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Operations Research

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The discipline of applying mathematical analysis to complex decision problems in operations: allocating scarce resources, scheduling, routing, inventory, and the design of service and production systems. Drawing on mathematical programming, stochastic modeling, queueing, simulation, and game-theoretic reasoning, it seeks policies that perform provably well in systems shaped by constraints, congestion, and uncertainty.

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OptimizationProbability·Captain: mikedeng1

Advance Demand Information, Price Discrimination, and Preorder Strategies: When Preorder Profit Increases with Demand CorrelationResearch Paper

Motivation

Firms that sell new products (consoles, books, films) often take preorders before release. A preorder serves two purposes at once. It lets the firm charge early adopters a different price from later buyers, a form of price discrimination, and the number of preorders is advance demand information: an early signal of how large regular-season demand will be. Li and Zhang (MSOM 15(1), 2013) ask whether better advance information always helps a seller who runs a preorder, when consumers are strategic and anticipate the seller's stocking decision. Their answer is no. The second-period stocking decision improves, but the preorder price can fall. Whether the net effect is positive depends on the low-type margin and the size of the early-adopter segment.

This mission formalizes that answer, §4 of the paper: the preorder profit as a function of the demand correlation ρ\rhoρ.

Setting

A seller sells a perishable product over two periods. High-type consumers, with valuation vHv_HvH​, arrive in the first period and may preorder at price p1p_1p1​. Low-type consumers, with valuation vL<vHv_L < v_HvL​<vH​, arrive in the second period, when the price is p2p_2p2​. A high type who waits values the product at δvH\delta v_HδvH​, where δ≤1\delta \le 1δ≤1 and δvH>vL\delta v_H > v_LδvH​>vL​. The unit cost is ccc, with 0<c<vL0 < c < v_L0<c<vL​. Unsold units have no salvage value and unmet demand carries no penalty. Write Δ=δvH−vL\Delta = \delta v_H - v_LΔ=δvH​−vL​.

The demands are jointly normal with correlation ρ∈[0,1)\rho \in [0,1)ρ∈[0,1). The high-type demand has mean μH\mu_HμH​, and XXX denotes its standardization, a standard normal variable. The low-type demand has mean μL\mu_LμL​, standard deviation σL\sigma_LσL​ and λL=μL/σL\lambda_L = \mu_L/\sigma_LλL​=μL​/σL​. Given X=xX = xX=x, the updated low-type demand X~L(x)\tilde X_L(x)X~L​(x) is normal with mean μ~L(x)=μL+ρσLx\tilde\mu_L(x) = \mu_L + \rho\sigma_L xμ~​L​(x)=μL​+ρσL​x and standard deviation σ~L=σL1−ρ2\tilde\sigma_L = \sigma_L\sqrt{1-\rho^2}σ~L​=σL​1−ρ2​. Φ\PhiΦ and ϕ\phiϕ are the standard normal distribution function and density, and zLz_LzL​ solves Φ(zL)=(vL−c)/vL\Phi(z_L) = (v_L - c)/v_LΦ(zL​)=(vL​−c)/vL​.

In the second period the seller charges p2=vLp_2 = v_Lp2​=vL​ and solves a newsvendor problem. It orders

Q(x)=μ~L(x)+zLσ~L(1)Q(x) = \tilde\mu_L(x) + z_L\tilde\sigma_L \qquad (1)Q(x)=μ~​L​(x)+zL​σ~L​(1)

and earns ΠL(x)=(vL−c)(μL+ρσLx)−vLϕ(zL)σL1−ρ2\Pi_L(x) = (v_L - c)(\mu_L + \rho\sigma_L x) - v_L\phi(z_L)\sigma_L\sqrt{1-\rho^2}ΠL​(x)=(vL​−c)(μL​+ρσL​x)−vL​ϕ(zL​)σL​1−ρ2​ (2). A waiting high type believes half of the remaining consumers will be served before her, so her belief of product availability is

ξ(ρ)=E[Pr⁡(X~L(X)2<Q(X))].(3)\xi(\rho) = \mathbb E\Big[\Pr\Big(\tfrac{\tilde X_L(X)}{2} < Q(X)\Big)\Big]. \qquad (3)ξ(ρ)=E[Pr(2X~L​(X)​<Q(X))].(3)

In the rational-expectations equilibrium every high type preorders at p1=vH−Δξp_1 = v_H - \Delta\xip1​=vH​−Δξ. The preorder profit is

Πp(ρ)=(vH−Δξ(ρ)−c)μH+ΠL(0).(4)\Pi^p(\rho) = (v_H - \Delta\xi(\rho) - c)\mu_H + \Pi_L(0). \qquad (4)Πp(ρ)=(vH​−Δξ(ρ)−c)μH​+ΠL​(0).(4)

The threshold is

μ~(ρ)=−vLϕ(zL)σL2ΔzL ϕ(2zL1−ρ2+λL).(6)\tilde\mu(\rho) = -\frac{v_L\phi(z_L)\sigma_L}{2\Delta z_L\,\phi\big(2z_L\sqrt{1-\rho^2} + \lambda_L\big)}. \qquad (6)μ~​(ρ)=−2ΔzL​ϕ(2zL​1−ρ2​+λL​)vL​ϕ(zL​)σL​​.(6)

Formalization targets

Goal: PROPOSITION 2

(i) c<vL<2c: Πp strictly increases on every interval where μH<μ~(ρ),and strictly decreases on every interval where μH≥μ~(ρ);(ii) vL≥2c: Πp strictly increases on [0,1).\begin{aligned} &\text{(i) } c < v_L < 2c:\ \Pi^p \text{ strictly increases on every interval where } \mu_H < \tilde\mu(\rho),\\ &\qquad\text{and strictly decreases on every interval where } \mu_H \ge \tilde\mu(\rho);\\ &\text{(ii) } v_L \ge 2c:\ \Pi^p \text{ strictly increases on } [0,1). \end{aligned}​(i) c<vL​<2c: Πp strictly increases on every interval where μH​<μ~​(ρ),and strictly decreases on every interval where μH​≥μ~​(ρ);(ii) vL​≥2c: Πp strictly increases on [0,1).​

Milestones

  1. (1)–(2): Q(x)Q(x)Q(x) is the unique maximizer of E[vLmin⁡(Q,X~L(x))−cQ]\mathbb E[v_L\min(Q,\tilde X_L(x)) - cQ]E[vL​min(Q,X~L​(x))−cQ], and its value is ΠL(x)\Pi_L(x)ΠL​(x).
  2. (3): ξ(ρ)=E[Φ((λL+ρX)/1−ρ2+2zL)]\xi(\rho) = \mathbb E\big[\Phi\big((\lambda_L + \rho X)/\sqrt{1-\rho^2} + 2z_L\big)\big]ξ(ρ)=E[Φ((λL​+ρX)/1−ρ2​+2zL​)].
  3. LEMMA 1(i): if c<vL<2cc < v_L < 2cc<vL​<2c, then zL<0z_L < 0zL​<0 and ξ\xiξ is strictly increasing in ρ\rhoρ.
  4. LEMMA 1(ii): if vL≥2cv_L \ge 2cvL​≥2c, then zL≥0z_L \ge 0zL​≥0 and ξ\xiξ is non-increasing in ρ\rhoρ, strictly so when vL>2cv_L > 2cvL​>2c.
  5. After (5): ddρΠL(0)=vLϕ(zL)σL ρ/1−ρ2>0\dfrac{d}{d\rho}\Pi_L(0) = v_L\phi(z_L)\sigma_L\,\rho/\sqrt{1-\rho^2} > 0dρd​ΠL​(0)=vL​ϕ(zL​)σL​ρ/1−ρ2​>0 for ρ∈(0,1)\rho \in (0,1)ρ∈(0,1).
  6. PROPOSITION 2(i), pointwise: for ρ∈(0,1)\rho \in (0,1)ρ∈(0,1), dΠp/dρ>0  ⟺  μH<μ~(ρ)d\Pi^p/d\rho > 0 \iff \mu_H < \tilde\mu(\rho)dΠp/dρ>0⟺μH​<μ~​(ρ) and dΠp/dρ<0  ⟺  μH>μ~(ρ)d\Pi^p/d\rho < 0 \iff \mu_H > \tilde\mu(\rho)dΠp/dρ<0⟺μH​>μ~​(ρ).
  7. LEMMA 2(i): if −λL/2<zL<0-\lambda_L/2 < z_L < 0−λL​/2<zL​<0, then μ~\tilde\muμ~​ is strictly increasing in ρ\rhoρ.
  8. LEMMA 2(ii): if zL≤−λL/2z_L \le -\lambda_L/2zL​≤−λL​/2, then μ~\tilde\muμ~​ is quasi-convex in ρ\rhoρ.

Significance

The proposition splits the value of advance demand information into two effects with opposite signs. Better information always raises the second-period profit (milestone 5). Its effect on the preorder price depends on the margin. When vL<2cv_L < 2cvL​<2c, the seller stocks below the conditional mean. A more precise forecast then raises the stock and the availability ξ\xiξ, and waiting becomes more attractive, which lowers the preorder price. The threshold μ~(ρ)\tilde\mu(\rho)μ~​(ρ) says which effect wins, and LEMMA 2 describes its shape. This is the basis for the paper's later comparisons of preorder, price-guarantee and no-preorder strategies.

The paper states these results and leaves the proofs to an online appendix. None of them has a machine-checked proof. A complete development would also give reusable facts about normal laws: the expectation E[Φ(a+bX)]\mathbb E[\Phi(a + bX)]E[Φ(a+bX)] for standard normal XXX, the normal newsvendor solution with its closed-form optimal profit, and derivatives of Gaussian integrals with respect to a correlation parameter.

Difficulty

The model is explicit, so the difficulty is not in modelling. It is in turning the two expectations into closed forms and differentiating them. The availability ξ\xiξ is an integral over XXX of a normal probability whose mean and variance both move with ρ\rhoρ. The expected newsvendor profit involves E[min⁡(Q,Y)]\mathbb E[\min(Q, Y)]E[min(Q,Y)] for a normal YYY. Neither closed form is in Mathlib, and neither is a derivative in ρ\rhoρ of a Gaussian integral. The obvious route, differentiating under the integral sign in (3), needs domination estimates that are uniform in ρ\rhoρ near each point, and these degenerate as ρ→1\rho \to 1ρ→1.

Signs are the second difficulty. zLz_LzL​ changes sign at vL=2cv_L = 2cvL​=2c, μ~\tilde\muμ~​ carries a leading minus and divides by zLz_LzL​, and the derivative of Πp\Pi^pΠp vanishes at ρ=0\rho = 0ρ=0 and wherever μ~(ρ)=μH\tilde\mu(\rho) = \mu_Hμ~​(ρ)=μH​. Strict monotonicity on an interval has to be recovered from a derivative that is positive except at finitely many points.

Formalization scope

Everything lives in the namespace PreorderADI.Correlation. A structure Params holds vH,vL,c,δ,μH,μL,σL,zLv_H, v_L, c, \delta, \mu_H, \mu_L, \sigma_L, z_LvH​,vL​,c,δ,μH​,μL​,σL​,zL​. The predicate Params.Standing records the model's assumptions: vH>vLv_H > v_LvH​>vL​, c<vLc < v_Lc<vL​, δ≤1\delta \le 1δ≤1 and δvH>vL\delta v_H > v_LδvH​>vL​, together with Φ(zL)=(vL−c)/vL\Phi(z_L) = (v_L-c)/v_LΦ(zL​)=(vL​−c)/vL​. σH\sigma_HσH​ is omitted because nothing in §4 uses it after standardization. Φ\PhiΦ is ProbabilityTheory.cdf (gaussianReal 0 1) and ϕ\phiϕ is gaussianPDFReal 0 1. The normal law with mean mmm and standard deviation sss is gaussianReal m (s^2).

The formalization commits to the following conventions and additions:

  • Added hypotheses. Four hypotheses are added to the page's assumptions:
    • c>0c > 0c>0, so that zLz_LzL​ exists;
    • σL>0\sigma_L > 0σL​>0, so that the conditional law is a genuine normal law;
    • μL>0\mu_L > 0μL​>0, so that λL>0\lambda_L > 0λL​>0, as LEMMA 2 presupposes;
    • μH>0\mu_H > 0μH​>0, which PROPOSITION 2(ii) needs.
  • zLz_LzL​. zLz_LzL​ is a parameter pinned down by Φ(zL)=(vL−c)/vL\Phi(z_L) = (v_L-c)/v_LΦ(zL​)=(vL​−c)/vL​, not an inverse function with junk values.
  • Range of ρ\rhoρ. ρ\rhoρ ranges over [0,1)[0,1)[0,1), the paper's "we will focus on ρ≥0\rho \ge 0ρ≥0" together with ρ<1\rho < 1ρ<1. Derivative statements use (0,1)(0,1)(0,1).
  • ξ\xiξ and Πp\Pi^pΠp. ξ\xiξ is defined as the first expression of (3), the expected probability, so that no closed form is assumed. Πp\Pi^pΠp is defined by (4). PROPOSITION 1, which derives (4) as the unique equilibrium profit, is not formalized: the paper defines the equilibrium only through conditions that already assume every high type preorders.
  • Monotonicity. "Increases in ρ\rhoρ when μH<μ~(ρ)\mu_H < \tilde\mu(\rho)μH​<μ~​(ρ)" is formalized as strict monotonicity on every order-connected I⊆[0,1)I \subseteq [0,1)I⊆[0,1) on which the condition holds. "Decreasing" in LEMMA 1(ii) is non-strict, since ξ\xiξ is constant when vL=2cv_L = 2cvL​=2c. Quasi-convexity is Mathlib's QuasiconvexOn.
  • The ε_v sentence is omitted. PROPOSITION 2(i) also claims that some εv>0\varepsilon_v > 0εv​>0 makes Πp\Pi^pΠp always decrease when vL<c+εvv_L < c + \varepsilon_vvL​<c+εv​. That claim is false in the paper's own model. As vL↓cv_L \downarrow cvL​↓c, μ~(ρ)→∞\tilde\mu(\rho) \to \inftyμ~​(ρ)→∞ for ρ\rhoρ below roughly 3/2\sqrt 3/23​/2, so Πp\Pi^pΠp increases there for every fixed μH\mu_HμH​. The paper's Figure 1 shows the same behaviour.
  • Out of scope. §5 rests on an approximation that treats normal demands as nonnegative, so it is excluded. §§6–7 depend on models given only in the online appendix and are excluded too.

A statement about the closed form Φ(λL+2zL1−ρ2)\Phi(\lambda_L + 2z_L\sqrt{1-\rho^2})Φ(λL​+2zL​1−ρ2​) in place of ξ\xiξ would make LEMMA 1 a one-line monotonicity fact. So would a definition of Πp\Pi^pΠp that bypasses (3). The definitions rule both out.

Welcome contributions include proofs of the milestones, general Mathlib-style lemmas on Gaussian expectations of Φ\PhiΦ and of min⁡(Q,Y)\min(Q, Y)min(Q,Y), and a formalization of PROPOSITION 1 from conditions (i)–(v).

Selected references

  • C. Li and F. Zhang, Advance Demand Information, Price Discrimination, and Preorder Strategies, Manufacturing & Service Operations Management 15(1):57–71, 2013. https://doi.org/10.1287/msom.1120.0398
  • G. P. Cachon and R. Swinney, Purchasing, Pricing, and Quick Response in the Presence of Strategic Consumers, Management Science 55(3):497–511, 2009. https://doi.org/10.1287/mnsc.1080.0948
  • X. Su and F. Zhang, On the Value of Commitment and Availability Guarantees When Selling to Strategic Consumers, Management Science 55(5):713–726, 2009. https://doi.org/10.1287/mnsc.1080.0967
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Information TheoryOptimizationProbability·Captain: mikedeng1

Worst-Case Value-At-Risk and Robust Portfolio Optimization: A Conic Programming Approach 2: Closed Form of the Entropy-Constrained Worst-Case VaRResearch Paper

Motivation

Value-at-Risk (VaR) is the loss level that a portfolio exceeds with probability at most ε\varepsilonε. It is the standard risk measure of banking regulation, and its classical computation assumes Gaussian returns: for a Gaussian return vector with mean x^\hat xx^ and covariance Γ\GammaΓ it equals −Φ−1(ε)w⊤Γw−x^⊤w-\Phi^{-1}(\varepsilon)\sqrt{w^\top\Gamma w} - \hat x^\top w−Φ−1(ε)w⊤Γw​−x^⊤w, where Φ\PhiΦ is the standard normal distribution function. Real returns are not exactly Gaussian, and a VaR computed from a misspecified distribution can badly understate risk.

El Ghaoui, Oks and Oustry (Oper. Res. 51(4), 2003) replace the single distribution by a class P\mathcal PP of distributions and define the worst-case VaR as the smallest loss level whose probability is at most ε\varepsilonε under every distribution of the class. Their first class, distributions with a given mean and covariance, leads to the Chebyshev-type bound of their Theorem 1, whose worst case is attained by discrete distributions. §4.2 of the paper asks instead for distributions that stay close to a Gaussian, measured by relative entropy (Kullback–Leibler divergence). Such balls are the basic uncertainty sets of distributionally robust optimization and of robust control in economics (Hansen and Sargent's multiplier and constraint preferences), and they give a smooth worst case. Theorem 9 computes the resulting worst-case VaR in closed form.

Setting

Returns are random vectors x∈Rnx \in \mathbb R^nx∈Rn and a portfolio is a vector w∈Rnw \in \mathbb R^nw∈Rn with w≠0w \neq 0w=0; its return is r(w,x)=w⊤xr(w,x) = w^\top xr(w,x)=w⊤x. For a level γ∈R\gamma \in \mathbb Rγ∈R the loss set is Sγ={x:γ≤−x⊤w}\mathcal S_\gamma = \{x : \gamma \le -x^\top w\}Sγ​={x:γ≤−x⊤w} (Eq. 13 of the paper).

Given a class P\mathcal PP of probability distributions on Rn\mathbb R^nRn and ε∈(0,1)\varepsilon \in (0,1)ε∈(0,1), the worst-case Value-at-Risk (Eq. 4) is

VP(w)=min⁡{γ∈R:sup⁡P∈PP(Sγ)≤ε}.V_{\mathcal P}(w) = \min\Big\{\gamma \in \mathbb R : \sup_{P \in \mathcal P} P(\mathcal S_\gamma) \le \varepsilon\Big\}.VP​(w)=min{γ∈R:P∈Psup​P(Sγ​)≤ε}.

Fix a mean x^∈Rn\hat x \in \mathbb R^nx^∈Rn and a positive definite covariance Γ≻0\Gamma \succ 0Γ≻0, and let P0=N(x^,Γ)P_0 = \mathcal N(\hat x, \Gamma)P0​=N(x^,Γ) be the reference Gaussian. For d≥0d \ge 0d≥0 the relative-entropy class (Eq. 43) is

Pd={P probability on Rn:KL(P,P0)=∫log⁡dPdP0 dP≤d},\mathcal P_d = \Big\{P \text{ probability on } \mathbb R^n : \mathrm{KL}(P, P_0) = \int \log\frac{dP}{dP_0}\,dP \le d\Big\},Pd​={P probability on Rn:KL(P,P0​)=∫logdP0​dP​dP≤d},

with KL(P,P0)=+∞\mathrm{KL}(P,P_0) = +\inftyKL(P,P0​)=+∞ unless PPP is absolutely continuous with respect to P0P_0P0​.

The risk factor (Eq. 45) is

f(ε,d)=sup⁡λ>0eε/λ−d−1e1/λ−1,κ(ε,d)=−Φ−1(f(ε,d)),f(\varepsilon,d) = \sup_{\lambda>0}\frac{e^{\varepsilon/\lambda - d} - 1}{e^{1/\lambda} - 1}, \qquad \kappa(\varepsilon,d) = -\Phi^{-1}\big(f(\varepsilon,d)\big),f(ε,d)=λ>0sup​e1/λ−1eε/λ−d−1​,κ(ε,d)=−Φ−1(f(ε,d)),

and the Gaussian tail of the loss set is ϕ(γ)=P0(Sγ)=1−Φ((γ+w⊤x^)/w⊤Γw)\phi(\gamma) = P_0(\mathcal S_\gamma) = 1 - \Phi\big((\gamma + w^\top\hat x)/\sqrt{w^\top\Gamma w}\big)ϕ(γ)=P0​(Sγ​)=1−Φ((γ+w⊤x^)/w⊤Γw​).

Formalization targets

Goal: Theorem 9 (p. 553)

For Γ≻0\Gamma \succ 0Γ≻0, w≠0w \neq 0w=0, d≥0d \ge 0d≥0 and 0<ε<10 < \varepsilon < 10<ε<1, the minimum in (4) over Pd\mathcal P_dPd​ exists and

VPd(w)=κ(ε,d)w⊤Γw−x^⊤w.(44)V_{\mathcal P_d}(w) = \kappa(\varepsilon,d)\sqrt{w^\top\Gamma w} - \hat x^\top w. \tag{44}VPd​​(w)=κ(ε,d)w⊤Γw​−x^⊤w.(44)

Milestones

The milestones follow the proof of Theorem 9 on pp. 553–554, in attack order.

  1. Eq. (45). The two expressions of fff agree: sup⁡λ>0eε/λ−d−1e1/λ−1=sup⁡v>0e−d(v+1)ε−1v\sup_{\lambda>0}\frac{e^{\varepsilon/\lambda-d}-1}{e^{1/\lambda}-1} = \sup_{v>0}\frac{e^{-d}(v+1)^\varepsilon - 1}{v}supλ>0​e1/λ−1eε/λ−d−1​=supv>0​ve−d(v+1)ε−1​.
  2. Gaussian tail. P0(Sγ)=1−Φ((γ+w⊤x^)/w⊤Γw)P_0(\mathcal S_\gamma) = 1 - \Phi\big((\gamma + w^\top\hat x)/\sqrt{w^\top\Gamma w}\big)P0​(Sγ​)=1−Φ((γ+w⊤x^)/w⊤Γw​).
  3. Eq. (47). For λ>0\lambda > 0λ>0, the Lagrangian L(Q)=Q(Sγ)+λ0(1−Q(Rn))+λ(d−KL-integral)L(Q) = Q(\mathcal S_\gamma) + \lambda_0(1 - Q(\mathbb R^n)) + \lambda(d - \mathrm{KL}\text{-integral})L(Q)=Q(Sγ​)+λ0​(1−Q(Rn))+λ(d−KL-integral) is maximised over finite measures Q≪P0Q \ll P_0Q≪P0​ by the exponentially tilted density dQ⋆/dP0=exp⁡((χS−λ0)/λ−1)dQ^\star/dP_0 = \exp((\chi_{\mathcal S} - \lambda_0)/\lambda - 1)dQ⋆/dP0​=exp((χS​−λ0​)/λ−1), with value
θ(λ0,λ)=λ0+λd+λe−λ0/λ−1((e1/λ−1)ϕ(γ)+1).\theta(\lambda_0,\lambda) = \lambda_0 + \lambda d + \lambda e^{-\lambda_0/\lambda - 1}\big((e^{1/\lambda}-1)\phi(\gamma) + 1\big).θ(λ0​,λ)=λ0​+λd+λe−λ0​/λ−1((e1/λ−1)ϕ(γ)+1).
  1. Eq. (48). min⁡λ0∈Rθ(λ0,λ)=λd+λlog⁡((e1/λ−1)ϕ(γ)+1)\min_{\lambda_0\in\mathbb R}\theta(\lambda_0,\lambda) = \lambda d + \lambda\log\big((e^{1/\lambda}-1)\phi(\gamma)+1\big)minλ0​∈R​θ(λ0​,λ)=λd+λlog((e1/λ−1)ϕ(γ)+1).
  2. Duality. sup⁡P∈PdP(Sγ)=inf⁡λ>0(λd+λlog⁡((e1/λ−1)ϕ(γ)+1))\sup_{P\in\mathcal P_d} P(\mathcal S_\gamma) = \inf_{\lambda>0}\big(\lambda d + \lambda\log((e^{1/\lambda}-1)\phi(\gamma)+1)\big)supP∈Pd​​P(Sγ​)=infλ>0​(λd+λlog((e1/λ−1)ϕ(γ)+1)).
  3. Inversion. For d>0d > 0d>0: some λ>0\lambda > 0λ>0 makes the dual value at most ε\varepsilonε if and only if γ≥κ(ε,d)w⊤Γw−w⊤x^\gamma \ge \kappa(\varepsilon,d)\sqrt{w^\top\Gamma w} - w^\top\hat xγ≥κ(ε,d)w⊤Γw​−w⊤x^.
  4. Remark after Theorem 9. f(ε,0)=εf(\varepsilon, 0) = \varepsilonf(ε,0)=ε, so κ(ε,0)=−Φ−1(ε)\kappa(\varepsilon,0) = -\Phi^{-1}(\varepsilon)κ(ε,0)=−Φ−1(ε). The risk factor κ(ε,d)\kappa(\varepsilon, d)κ(ε,d) is strictly increasing in d≥0d \ge 0d≥0.

Significance

Theorem 9 says that an entropy ball around a Gaussian leaves the form of the Gaussian VaR unchanged: only the risk factor moves, from −Φ−1(ε)-\Phi^{-1}(\varepsilon)−Φ−1(ε) to κ(ε,d)\kappa(\varepsilon,d)κ(ε,d), a scalar computed by a one-dimensional maximisation. The worst-case VaR therefore stays a convex function of www whenever κ≥0\kappa \ge 0κ≥0, and minimising it over a polytope of portfolios is a second-order cone program (problem (3) of the paper). The number f(ε,d)f(\varepsilon,d)f(ε,d) is the largest ppp with KL(Bernoulli(ε) ∥ Bernoulli(p))≤d\mathrm{KL}(\mathrm{Bernoulli}(\varepsilon)\,\|\,\mathrm{Bernoulli}(p)) \le dKL(Bernoulli(ε)∥Bernoulli(p))≤d, which ties the result to the binary-divergence bounds used throughout information theory.

The theorem was proved in 2003. The worst-case-probability step (milestone 5) is an instance of the Donsker–Varadhan / Gibbs variational duality for relative-entropy balls, which the paper imports from the literature (Smith 1995). No machine-checked proof of Theorem 9 or of this duality on Rn\mathbb R^nRn is known. A formalization would give a verified closed form for a relative-entropy distributionally robust chance constraint, and the duality and tilting lemmas would serve any mission on KL-ball robust optimization.

Difficulty

The obvious argument is Lagrangian duality for the infinite-dimensional problem sup⁡{P(Sγ):KL(P,P0)≤d}\sup\{P(\mathcal S_\gamma) : \mathrm{KL}(P,P_0) \le d\}sup{P(Sγ​):KL(P,P0​)≤d}. Weak duality and the pointwise maximisation that produces the tilted density are elementary. The difficulty is the step the paper cites rather than proves: that the duality gap is zero, and that the supremum over distributions equals the infimum of the dual over λ>0\lambda > 0λ>0. The feasible set is a set of measures, the objective is an indicator, and the constraint is a divergence that is +∞+\infty+∞ off a set of absolutely continuous measures, so a finite-dimensional Slater argument does not apply as stated.

The second difficulty is at the boundary of the parameters. At d=0d = 0d=0 the supremum defining f(ε,0)f(\varepsilon,0)f(ε,0) is approached only as λ→∞\lambda \to \inftyλ→∞, so the final inversion step behaves differently from d>0d > 0d>0. At ε=1\varepsilon = 1ε=1 the theorem is false, since every level γ\gammaγ is feasible and (4) has no minimum.

Formalization scope

Returns live in EuclideanSpace ℝ (Fin n). P0P_0P0​ is Mathlib's multivariateGaussian xhat Γ with Γ.PosDef, and KL\mathrm{KL}KL is InformationTheory.klDiv, which is ∞\infty∞ unless P≪P0P \ll P_0P≪P0​ with integrable log-likelihood ratio and equals ∫log⁡dPdP0 dP\int\log\frac{dP}{dP_0}\,dP∫logdP0​dP​dP otherwise for probability measures. The class Pd\mathcal P_dPd​ requires IsProbabilityMeasure P. Φ\PhiΦ is cdf (gaussianReal 0 1), and Φ−1(p)\Phi^{-1}(p)Φ−1(p) is defined as inf⁡{t:p≤Φ(t)}\inf\{t : p \le \Phi(t)\}inf{t:p≤Φ(t)}, which inverts Φ\PhiΦ on (0,1)(0,1)(0,1). The quadratic form w⊤Γww^\top\Gamma ww⊤Γw is a double sum, and ∥Γ1/2w∥2\|\Gamma^{1/2}w\|_2∥Γ1/2w∥2​ is written w⊤Γw\sqrt{w^\top\Gamma w}w⊤Γw​.

Conventions the Lean statements commit to:

  • "min" in (4) is IsLeast of the feasible set {γ:P(Sγ)≤ε ∀P∈Pd}\{\gamma : P(\mathcal S_\gamma) \le \varepsilon \ \forall P \in \mathcal P_d\}{γ:P(Sγ​)≤ε ∀P∈Pd​}. "sup⁡PP(Sγ)≤ε\sup_{P}P(\mathcal S_\gamma) \le \varepsilonsupP​P(Sγ​)≤ε" is written "for every PPP", with probabilities compared in [0,∞][0,\infty][0,∞].
  • The paper prints ε∈(0,1]\varepsilon \in (0,1]ε∈(0,1]. The mission assumes 0<ε<10 < \varepsilon < 10<ε<1, because the goal is false at ε=1\varepsilon = 1ε=1.
  • w≠0w \neq 0w=0 is the paper's assumption that the admissible set of portfolios excludes 000.
  • f(ε,d)f(\varepsilon,d)f(ε,d) is a Lean sSup of a set that is nonempty and bounded above by 111 for ε≤1\varepsilon \le 1ε≤1, d≥0d \ge 0d≥0.
  • The duality of milestone 5 is stated as the existence of one real number that is both the least upper bound of the worst-case probabilities and the greatest lower bound of the dual values, not as an equality of Lean's sSup and sInf.
  • Eq. (48) is stated as an attained minimum (IsLeast), which the calculus gives.
  • Milestone 3 works with finite measures Q≪P0Q \ll P_0Q≪P0​ with integrable log-likelihood ratio in place of the paper's densities ppp. It uses the complement of Sγ\mathcal S_\gammaSγ​ where the paper writes {γ≥−x⊤w}\{\gamma \ge -x^\top w\}{γ≥−x⊤w}, which differs by a P0P_0P0​-null hyperplane.
  • Milestone 6 assumes d>0d > 0d>0; the goal keeps d≥0d \ge 0d≥0.

Restricting Pd\mathcal P_dPd​ to {P0}\{P_0\}{P0​}, dropping IsProbabilityMeasure, or taking an arbitrary reference measure would trivialize or change the theorem. The class is the full KL ball around the nondegenerate Gaussian.

Infrastructure a complete development needs: the pushforward of a multivariate Gaussian under a linear functional (a one-dimensional Gaussian), the Gibbs variational principle for relative entropy, the strong duality for KL balls, and properties of Φ\PhiΦ and its quantile (continuity, strict monotonicity, symmetry Φ(−t)=1−Φ(t)\Phi(-t) = 1 - \Phi(t)Φ(−t)=1−Φ(t)). The Gaussian-quantile and KL-ball duality lemmas are reusable beyond this mission. Contributions of any of these as separate lemmas are welcome.

Selected references

  • L. El Ghaoui, M. Oks, F. Oustry, Worst-Case Value-at-Risk and Robust Portfolio Optimization: A Conic Programming Approach, Operations Research 51(4):543–556, 2003. https://doi.org/10.1287/opre.51.4.543.16101
  • J. E. Smith, Generalized Chebychev Inequalities: Theory and Applications in Decision Analysis, Operations Research 43(5):807–825, 1995. https://doi.org/10.1287/opre.43.5.807
  • M. D. Donsker, S. R. S. Varadhan, Asymptotic evaluation of certain Markov process expectations for large time, I, Communications on Pure and Applied Mathematics 28(1):1–47, 1975. https://doi.org/10.1002/cpa.3160280102
  • L. P. Hansen, T. J. Sargent, Robust Control and Model Uncertainty, American Economic Review 91(2):60–66, 2001. https://doi.org/10.1257/aer.91.2.60
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Convex OptimizationLinear algebraOptimization·Captain: mikedeng1

Robust Solutions to Uncertain Semidefinite Programs III: Quadratic Growth and Uniqueness of the Robust SDP SolutionResearch Paper

Motivation

A semidefinite program (SDP) minimizes a linear objective cTxc^TxcTx subject to a linear matrix inequality F(x)=F0+∑ixiFi⪰0F(x) = F_0 + \sum_i x_i F_i \succeq 0F(x)=F0​+∑i​xi​Fi​⪰0. When the data FiF_iFi​ are uncertain, El Ghaoui, Oustry and Lebret (SIAM J. Optim. 9(1), 1998) proposed to optimize against the worst case over a norm-bounded family of perturbations: the robust SDP. Their Theorem 3.1 shows that, for unstructured ("full") perturbations, the robust SDP is itself an SDP in the enlarged variable (x,τ)(x,\tau)(x,τ). Section 4 of the paper then asks what robustification does to the solution. Nominal SDPs are often ill-posed: the optimal set can be a whole face, and optimal points can jump under small data changes. Section 4 shows that, under explicit hypotheses, the robust problem has a unique solution with quadratic growth, which is the sense in which the paper describes robustness as a regularization of SDPs. This mission formalizes that result, Theorem 4.2.

Setting

Fix natural numbers m,n,p,qm, n, p, qm,n,p,q, matrices F0,…,Fm∈Rn×nF_0, \dots, F_m \in \mathbb{R}^{n\times n}F0​,…,Fm​∈Rn×n (symmetric), R0,…,Rm∈Rq×nR_0, \dots, R_m \in \mathbb{R}^{q\times n}R0​,…,Rm​∈Rq×n, L∈Rn×pL \in \mathbb{R}^{n\times p}L∈Rn×p, and an objective vector c∈Rmc \in \mathbb{R}^mc∈Rm, c≠0c \neq 0c=0. Write F(x)=F0+∑i=1mxiFiF(x) = F_0 + \sum_{i=1}^m x_iF_iF(x)=F0​+∑i=1m​xi​Fi​ and R(x)=R0+∑i=1mxiRiR(x) = R_0 + \sum_{i=1}^m x_iR_iR(x)=R0​+∑i=1m​xi​Ri​.

With full perturbations, uncertainty level ρ=1\rho = 1ρ=1 and D=0D = 0D=0 (the standing choices of §4), the robust SDP is the SDP

minimize cTxsubject toF(x,τ)=[F(x)−τLLTR(x)TR(x)τI]⪰0(15)\text{minimize } c^Tx \quad\text{subject to}\quad \mathcal{F}(x,\tau) = \begin{bmatrix} F(x) - \tau LL^T & R(x)^T \\ R(x) & \tau I\end{bmatrix} \succeq 0 \tag{15}minimize cTxsubject toF(x,τ)=[F(x)−τLLTR(x)​R(x)TτI​]⪰0(15)

in the variables y=(x,τ)∈Rm×Ry = (x,\tau) \in \mathbb{R}^m \times \mathbb{R}y=(x,τ)∈Rm×R. A point is feasible if F(x,τ)⪰0\mathcal{F}(x,\tau) \succeq 0F(x,τ)⪰0 (symmetric positive semidefinite) and optimal if it is feasible and minimizes cTxc^TxcTx over all feasible (x′,τ′)(x',\tau')(x′,τ′). The solution is the pair (x,τ)(x,\tau)(x,τ).

The paper's hypotheses (§4.1):

  • H1 (Slater): F(x,τ)≻0\mathcal{F}(x,\tau) \succ 0F(x,τ)≻0 for some (x,τ)(x,\tau)(x,τ).
  • H2 (inf-compactness): every sublevel set {(x,τ) feasible:cTx≤M}\{(x,\tau)\ \text{feasible} : c^Tx \le M\}{(x,τ) feasible:cTx≤M} is bounded.
  • H3(a): the nullspace of the pencil λR0+∑ixiRi\lambda R_0 + \sum_i x_iR_iλR0​+∑i​xi​Ri​ is one and the same proper subspace N⊊RnN \subsetneq \mathbb{R}^nN⊊Rn for every (λ,x)≠(0,0)(\lambda,x) \neq (0,0)(λ,x)=(0,0).
  • H3(b): for every xxx the stacked matrix [LTR(x)]\begin{bmatrix} L^T \\ R(x)\end{bmatrix}[LTR(x)​] has full column rank.

For τ>0\tau > 0τ>0 put G(x,τ)=F(x)−τLLT−1τR(x)TR(x)G(x,\tau) = F(x) - \tau LL^T - \frac{1}{\tau}R(x)^TR(x)G(x,τ)=F(x)−τLLT−τ1​R(x)TR(x), the Schur complement of the block τI\tau IτI in F(x,τ)\mathcal{F}(x,\tau)F(x,τ).

The quadratic growth condition (QGC) holds at an optimal point y⋆=(x⋆,τ⋆)y^\star = (x^\star,\tau^\star)y⋆=(x⋆,τ⋆) if there are α,ε>0\alpha, \varepsilon > 0α,ε>0 with

cTx ≥ cTx⋆+α ∥y−y⋆∥2for every feasible y=(x,τ), ∥y−y⋆∥<ε.c^Tx \ \ge\ c^Tx^\star + \alpha\,\|y - y^\star\|^2 \qquad \text{for every feasible } y = (x,\tau),\ \|y - y^\star\| < \varepsilon .cTx ≥ cTx⋆+α∥y−y⋆∥2for every feasible y=(x,τ), ∥y−y⋆∥<ε.

Formalization targets

Goal: Theorem 4.2 (p. 39)

Under c≠0c \neq 0c=0, symmetry of the FiF_iFi​, H1, H2, H3(a) and H3(b):

(∀ y⋆ optimal for (15): QGC holds at y⋆)and∃! y=(x,τ) optimal for (15).\bigl(\forall\, y^\star \text{ optimal for (15)}:\ \text{QGC holds at } y^\star\bigr)\quad\text{and}\quad \exists!\, y = (x,\tau) \text{ optimal for (15)} .(∀y⋆ optimal for (15): QGC holds at y⋆)and∃!y=(x,τ) optimal for (15).

Both halves are stated; uniqueness is of the pair (x,τ)(x,\tau)(x,τ), and existence is part of the claim.

Milestones, in the order the paper's proof uses them

  1. §4.1 (p. 38): H3(a) implies R(x)≠0R(x) \neq 0R(x)=0 for every xxx.
  2. §4.2 (p. 39): under H3(a), every feasible τ\tauτ is positive; in particular τopt>0\tau_{\mathrm{opt}} > 0τopt​>0.
  3. §4.2, Eq. (16): for τ>0\tau > 0τ>0, F(x,τ)⪰0  ⟺  G(x,τ)⪰0\mathcal{F}(x,\tau) \succeq 0 \iff G(x,\tau) \succeq 0F(x,τ)⪰0⟺G(x,τ)⪰0.
  4. Appendix A (p. 49): at every optimal (x,τ)(x,\tau)(x,τ) there is a dual matrix Z⪰0Z \succeq 0Z⪰0, Z≠0Z \neq 0Z=0, with Tr⁡ZG(x,τ)=0\operatorname{Tr} ZG(x,\tau) = 0TrZG(x,τ)=0, Tr⁡Z ∂G/∂xi=ci\operatorname{Tr} Z\,\partial G/\partial x_i = c_iTrZ∂G/∂xi​=ci​ and τ2Tr⁡LLTZ=Tr⁡R(x)TR(x)Z\tau^2\operatorname{Tr}LL^TZ = \operatorname{Tr}R(x)^TR(x)Zτ2TrLLTZ=TrR(x)TR(x)Z.
  5. Appendix A (p. 49): H3(b) rules out Tr⁡LLTZ=Tr⁡R(x)TR(x)Z=0\operatorname{Tr}LL^TZ = \operatorname{Tr}R(x)^TR(x)Z = 0TrLLTZ=TrR(x)TR(x)Z=0 for Z⪰0Z \succeq 0Z⪰0, Z≠0Z \neq 0Z=0, hence Tr⁡R(x)TR(x)Z>0\operatorname{Tr}R(x)^TR(x)Z > 0TrR(x)TR(x)Z>0.
  6. Appendix A (pp. 49–50): under H3(a), with τ>0\tau > 0τ>0, Z⪰0Z \succeq 0Z⪰0 and Tr⁡R(x)TR(x)Z>0\operatorname{Tr}R(x)^TR(x)Z > 0TrR(x)TR(x)Z>0, the Hessian of the Lagrangian cTx−Tr⁡Z G(x,τ)c^Tx - \operatorname{Tr} Z\,G(x,\tau)cTx−TrZG(x,τ) is positive definite.

Significance

The result. Theorem 4.2 turns the robust SDP into a well-posed problem: a unique solution with quadratic growth. Quadratic growth is the property from which the paper's Hölder-stability results (Theorem 4.3, Corollaries 4.1–4.2) follow through the perturbation theory of Bonnans, Cominetti and Shapiro, and it is what justifies using the robust SDP as a regularization of ill-conditioned SDPs (§5.4). The remark after the theorem notes a geometric reading: the growth holds for every objective, so the boundary of the robust feasible set contains no facets.

Formalizing it. The theorem has a published proof (Appendix A), which relies on a second-order sufficient condition for nonlinear SDPs cited from Bonnans, Cominetti and Shapiro. There is no machine-checked proof of it or of any second-order optimality result for SDPs that we know of. A formalization provides a complete account of the dual attainment, complementarity and second-order steps for this concrete problem class, and it checks the paper's computations; one of them, the intermediate display for the second derivative in Appendix A, has a factor error in its cross term that does not affect the conclusion.

Difficulty

The feasible set of (15) is a spectrahedron, and linear objectives over spectrahedra do not in general have unique minimizers, since optimal faces can be flat. Uniqueness therefore cannot come from convexity alone. It has to come from curvature of the boundary at the optimum, and that curvature is carried only by the nonlinear term 1τR(x)TR(x)\frac{1}{\tau}R(x)^TR(x)τ1​R(x)TR(x) of the Schur complement, which is degenerate along some directions. Positive definiteness of the Hessian must be recovered from the structural hypotheses H3(a) and H3(b), which interact with a dual matrix ZZZ that is known only to exist. The natural first attempt is to use τ>0\tau > 0τ>0 and the positive semidefiniteness of ZZZ directly. That attempt fails: the second derivative is Tr⁡Z RTR\operatorname{Tr} Z\,\mathcal{R}^T\mathcal{R}TrZRTR for a direction-dependent matrix R\mathcal{R}R, which vanishes on the kernel of ZZZ, so it is not positive without H3(a) relating the kernels of all members of the pencil. Dual attainment and complementarity for (15) also have to be established, and the local second-order bound then has to be converted into a statement about every nearby feasible point.

Formalization scope

  • Representation. Data are bundled in RobustSDP.Uniqueness.SDPData m n p q; decision points are pairs y : (Fin m → ℝ) × ℝ; the coefficient Fs i, i : Fin m, is the paper's Fi+1F_{i+1}Fi+1​. ⪰0\succeq 0⪰0 and ≻0\succ 0≻0 are Mathlib's Matrix.PosSemidef and Matrix.PosDef, which include symmetry, as the paper's notation does.
  • Conventions fixed. §4's standing choices D=0D = 0D=0 and ρ=1\rho = 1ρ=1 are built into (15). The standing assumptions c≠0c \neq 0c=0 and symmetric FiF_iFi​ (p. 33) are explicit hypotheses. H2 is read as bounded sublevel sets of the feasible set in (x,τ)(x,\tau)(x,τ); the paper's wording ("any unbounded sequence of feasible points produces an unbounded sequence of objectives") is meant in this sense, as its claim that H1 and H2 give existence of optimal points shows. H3(b)'s full column rank is injectivity of ξ↦(LTξ,R(x)ξ)\xi \mapsto (L^T\xi, R(x)\xi)ξ↦(LTξ,R(x)ξ). The QGC uses the Euclidean norm on Rm+1\mathbb{R}^{m+1}Rm+1 in its local form, which is equivalent to the paper's o(∥y−yopt∥2)o(\|y - y_{\mathrm{opt}}\|^2)o(∥y−yopt​∥2) form. It is stated for (15) rather than for the paper's reformulation (16), with which (15) coincides near the optimum because τopt>0\tau_{\mathrm{opt}} > 0τopt​>0. The auxiliary constraint τ≥0.99 τopt\tau \ge 0.99\,\tau_{\mathrm{opt}}τ≥0.99τopt​ of (16) is not formalized. GGG uses Lean's τ⁻¹, which is 000 at τ=0\tau = 0τ=0, so every statement about GGG assumes τ>0\tau > 0τ>0 or τ≠0\tau \ne 0τ=0.
  • No trivializing reading. The goal cannot be satisfied by stating only uniqueness of xxx, by reading H2 as "the objective is bounded below", or by reading H3(a) as "R(x)≠0R(x) \neq 0R(x)=0". The statement quantifies over the pair (x,τ)(x,\tau)(x,τ), and both the quadratic growth and the existence and uniqueness halves are required. The hypotheses are jointly satisfiable: for example m=1m = 1m=1, n=p=2n = p = 2n=p=2, q=4q = 4q=4, F(x)=diag(3+x,3−x)F(x) = \mathrm{diag}(3+x, 3-x)F(x)=diag(3+x,3−x), L=I2L = I_2L=I2​, R(x)=[1;x]⊗I2R(x) = [1; x]\otimes I_2R(x)=[1;x]⊗I2​ and c=1c = 1c=1.
  • Infrastructure. A complete development needs Schur complements for positive semidefinite block matrices (available in Mathlib), strong duality with dual attainment for inequality-form SDPs under Slater's condition (ConvexOptimization.sdp_strong_duality on the platform, in another Mathlib environment), existence of minimizers on closed bounded sets, second derivatives of matrix-valued maps, and a local second-order argument for convex problems. The duality and second-order parts can be reused beyond this mission. Contributions to any milestone, or alternative proofs that avoid the general Bonnans–Cominetti–Shapiro theory, are welcome.

Selected references

  • L. El Ghaoui, F. Oustry and H. Lebret, Robust Solutions to Uncertain Semidefinite Programs, SIAM J. Optim. 9(1), 33–52, 1998. https://doi.org/10.1137/S1052623496305717
  • J. F. Bonnans, R. Cominetti and A. Shapiro, Sensitivity analysis of optimization problems under second order regular constraints, Math. Oper. Res. 23(4), 806–831, 1998 (the paper's reference [10]). https://doi.org/10.1287/moor.23.4.806
  • A. Shapiro, First and second order analysis of nonlinear semidefinite programs, Math. Programming Ser. B 77, 301–320, 1997. https://doi.org/10.1007/BF02614439
  • R. T. Rockafellar, Convex Analysis, Princeton University Press, 1970. https://doi.org/10.1515/9781400873173
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Dynamic ProgrammingOptimization·Captain: mikedeng1

Integrating Replenishment Decisions with Advance Demand Information I: The Myopic Order-Up-To Level Is Optimal When Observed Demand Beyond the Protection Period Is LargeResearch Paper

Motivation

Many firms learn part of future demand before it has to be served: customers place orders days or weeks ahead of the date they need the goods, or commit to delivery dates in contracts. Advance demand information of this kind reduces the uncertainty the inventory manager has to protect against, and the question is how replenishment decisions should use it. Gallego and Özer (Management Science 47(10), 2001) model orders placed up to NNN periods ahead and a supply lead time LLL. They show that, with a fixed ordering cost, the classical (s,S)(s,S)(s,S) structure survives with parameters that depend on the observed future demand, and they identify when that dependence disappears.

The classical theory this builds on is the finite-horizon inventory model with a set-up cost. Scarf (1960) introduced KKK-convexity to prove that (s,S)(s,S)(s,S) policies are optimal there. Veinott (1966) and Iglehart (1963) bounded the optimal policy parameters by myopic quantities. Gallego and Özer extend both results to a state that carries a vector of observed demands.

Setting

Periods are t=1,…,Tt = 1, \dots, Tt=1,…,T. In period ttt customers place orders Dt=(Dt,t,…,Dt,t+N)D_t = (D_{t,t}, \dots, D_{t,t+N})Dt​=(Dt,t​,…,Dt,t+N​) for periods t,…,t+Nt, \dots, t+Nt,…,t+N; DtD_tDt​ is a random vector with law μt\mu_tμt​ and nonnegative components. The lead time LLL and the information horizon NNN satisfy N>L+1N > L+1N>L+1; write M=N−L−1≥1M = N - L - 1 \ge 1M=N−L−1≥1. The state at the start of period ttt is a pair (xt,ot)(x_t, o_t)(xt​,ot​): the modified inventory position xt∈Rx_t \in \mathbb{R}xt​∈R, and the vector

ot=(ot,t+L+1,…,ot,t+N−1)∈RMo_t = (o_{t,t+L+1}, \dots, o_{t,t+N-1}) \in \mathbb{R}^Mot​=(ot,t+L+1​,…,ot,t+N−1​)∈RM

of demands already observed for the periods beyond the protection period t,…,t+Lt, \dots, t+Lt,…,t+L.

The manager raises xtx_txt​ to an order-up-to level y≥xty \ge x_ty≥xt​, paying a set-up cost Kt>0K_t > 0Kt​>0 if y>xty > x_ty>xt​. After DtD_tDt​ is observed, the state moves to

xt+1=y−∑s=tt+L+1Dt,s−ot,t+L+1,ot+1,s=ot,s+Dt,s  (s=t+L+2,…,t+N),x_{t+1} = y - \sum_{s=t}^{t+L+1} D_{t,s} - o_{t,t+L+1},\qquad o_{t+1,s} = o_{t,s} + D_{t,s}\ \ (s = t+L+2,\dots,t+N),xt+1​=y−s=t∑t+L+1​Dt,s​−ot,t+L+1​,ot+1,s​=ot,s​+Dt,s​  (s=t+L+2,…,t+N),

with ot,t+N=0o_{t,t+N} = 0ot,t+N​=0. With a convex single-period cost GtG_tGt​, discount factors αt>0\alpha_t > 0αt​>0 and δ(z)=1{z>0}\delta(z) = \mathbf 1\{z > 0\}δ(z)=1{z>0}, the optimal cost satisfies JT+1≡0J_{T+1} \equiv 0JT+1​≡0 and

Jt(x,o)=min⁡y≥x{Ktδ(y−x)+Vt(y,o)},Vt(y,o)=Gt(y)+αt+1 E Jt+1(xt+1,ot+1).J_t(x, o) = \min_{y \ge x}\{K_t\delta(y - x) + V_t(y, o)\},\qquad V_t(y, o) = G_t(y) + \alpha_{t+1}\,\mathbb E\,J_{t+1}(x_{t+1}, o_{t+1}).Jt​(x,o)=y≥xmin​{Kt​δ(y−x)+Vt​(y,o)},Vt​(y,o)=Gt​(y)+αt+1​EJt+1​(xt+1​,ot+1​).

Let Ht(x,o)=Kt+min⁡y≥xVt(y,o)−Vt(x,o)H_t(x, o) = K_t + \min_{y\ge x}V_t(y,o) - V_t(x,o)Ht​(x,o)=Kt​+miny≥x​Vt​(y,o)−Vt​(x,o). The order-up-to level St(o)S_t(o)St​(o) is the least minimizer of Vt(⋅,o)V_t(\cdot, o)Vt​(⋅,o), and the reorder point is st(o)=max⁡{x:Ht(x,o)≤0}s_t(o) = \max\{x : H_t(x,o) \le 0\}st​(o)=max{x:Ht​(x,o)≤0}.

A function ggg is (a,b)(a,b)(a,b)-convex, g∈C(a,b)g \in C(a,b)g∈C(a,b), if g(θx1+(1−θ)x2)≤θ(a+g(x1))+(1−θ)(b+g(x2))g(\theta x_1 + (1-\theta)x_2) \le \theta(a + g(x_1)) + (1-\theta)(b + g(x_2))g(θx1​+(1−θ)x2​)≤θ(a+g(x1​))+(1−θ)(b+g(x2​)) for all x1≤x2x_1 \le x_2x1​≤x2​ and θ∈[0,1]\theta \in [0,1]θ∈[0,1]; C(0,K)C(0,K)C(0,K) is Scarf's KKK-convexity. In the stationary problem Gt=GG_t = GGt​=G, Kt=KK_t = KKt​=K, αt=α\alpha_t = \alphaαt​=α and μt=ν\mu_t = \nuμt​=ν, and the myopic levels are

Sm=min⁡{y:G(y)≤G(x) ∀x},sm=max⁡{y≤Sm:G(y)≥K+G(Sm)},S‾=inf⁡{y>Sm:G(y)>G(Sm)+αK}.S^m = \min\{y : G(y) \le G(x)\ \forall x\},\quad s^m = \max\{y \le S^m : G(y) \ge K + G(S^m)\},\quad \overline S = \inf\{y > S^m : G(y) > G(S^m) + \alpha K\}.Sm=min{y:G(y)≤G(x) ∀x},sm=max{y≤Sm:G(y)≥K+G(Sm)},S=inf{y>Sm:G(y)>G(Sm)+αK}.

Formalization targets

Goal: Theorem 2 (p. 1350)

For the stationary problem, every 1≤t≤T1 \le t \le T1≤t≤T and every observed-demand vector ot≥0o_t \ge 0ot​≥0,

ot,t+L+1≥S‾−sm  ⟹  St(ot)=Sm.o_{t,t+L+1} \ge \overline S - s^m \implies S_t(o_t) = S^m.ot,t+L+1​≥S−sm⟹St​(ot​)=Sm.

Only the observed demand for the first period beyond the protection period is compared with the threshold; the other components of oto_tot​ are free.

Milestones

  • Lemma 1, Parts 1, 2, 4, 5 (p. 1349): inclusion, positive combinations, expectations, and g(max⁡(x,s))g(\max(x,s))g(max(x,s)) for (a,b)(a,b)(a,b)-convex functions.
  • Lemma 2 and Corollary 1 (p. 1350): for V∈C(0,K)V \in C(0,K)V∈C(0,K) with a minimizer SSS, HHH changes sign once from −-− to +++, and (for continuous VVV) J(x)=V(max⁡(s,x))J(x) = V(\max(s,x))J(x)=V(max(s,x)).
  • Theorem 1, Parts 1–3 (p. 1350): Vt(⋅,ot)∈C(0,Kt)V_t(\cdot, o_t) \in C(0, K_t)Vt​(⋅,ot​)∈C(0,Kt​) is coercive, a state-dependent (st(ot),St(ot))(s_t(o_t), S_t(o_t))(st​(ot​),St​(ot​)) policy is optimal, and Jt(⋅,ot)∈C(0,Kt)J_t(\cdot, o_t) \in C(0, K_t)Jt​(⋅,ot​)∈C(0,Kt​) with its limits at ±∞\pm\infty±∞.
  • Lemma 3 (p. 1351): Sm≤St(ot)≤S‾S^m \le S_t(o_t) \le \overline SSm≤St​(ot​)≤S and sm≤st(ot)s^m \le s_t(o_t)sm≤st​(ot​).

Significance

Theorem 1 says that advance demand information does not destroy the (s,S)(s,S)(s,S) structure: the optimal policy is still a reorder point and an order-up-to level, now functions of oto_tot​. Theorem 2 is a horizon result. Once enough demand is already booked for period t+L+1t+L+1t+L+1, the order-up-to level is the myopic one, computed from GGG alone, and the rest of the information vector can be ignored. The threshold S‾−sm\overline S - s^mS−sm grows with the set-up cost. In practice the manager then orders only to cover demand up to period t+Lt+Lt+L, knowing another order will be placed in period t+1t+1t+1, and the search for state-dependent policies is confined to states with little booked demand.

The results are proved in the paper, with some steps argued informally (the unit forward difference in Lemma 3, a minimum over an open set in the definition of S‾\overline SS). As far as the platform's catalog shows, no (s,S)(s,S)(s,S) optimality theorem of this form has a machine-checked proof: the platform has KKK-convexity lemmas for a single constant, not for (a,b)(a,b)(a,b)-convexity or a dynamic program with a vector state. A formal proof would check the infinite-state induction and the conditions under which the expectation in (9) is finite. The (a,b)(a,b)(a,b)-convexity layer and the one-period results (Lemma 2, Corollary 1) are reusable for any set-up cost model.

Difficulty

The obvious induction proves KKK-convexity of VtV_tVt​ and then applies Scarf's argument. The vector state makes each step conditional on facts the scalar case gets for free. The expectation in (9) mixes a random shift of xxx with a random update of ooo, so preserving KKK-convexity needs Lemma 1, Part 4 rather than the scalar version. Coercivity and continuity of Vt(⋅,o)V_t(\cdot, o)Vt​(⋅,o), and measurability and integrability of D↦Jt+1(xt+1,ot+1)D \mapsto J_{t+1}(x_{t+1}, o_{t+1})D↦Jt+1​(xt+1​,ot+1​), must be carried through the induction jointly in (x,o)(x, o)(x,o). They cannot be assumed.

For Theorem 2, VtV_tVt​ is not a function of GGG alone, and a comparison of St(ot)S_t(o_t)St​(ot​) with SmS^mSm has to control EJt+1\mathbb E J_{t+1}EJt+1​. That requires the lower bound sm≤st+1(ot+1)s^m \le s_{t+1}(o_{t+1})sm≤st+1​(ot+1​) at the next period, which holds only on the nonnegative state space.

Formalization scope

Everything is stated about the functional equation (8)–(9). The paper derives it in Appendix A from a control problem over history-dependent policies, citing Özer (2000); that reduction is out of scope. The demand vector is Fin (L + M + 2) → ℝ and ooo is Fin M → ℝ, with component jjj equal to ot,t+L+1+jo_{t,t+L+1+j}ot,t+L+1+j​. JJJ is defined by backward recursion, minima over y≥xy \ge xy≥x are infima over {y:x≤y}\{y : x \le y\}{y:x≤y}, and expectations are Bochner integrals. GtG_tGt​ is an abstract primitive, not built from holding and penalty costs.

The paper's hypotheses are GtG_tGt​ convex with Gt(y)→∞G_t(y) \to \inftyGt​(y)→∞ as ∣y∣→∞|y| \to \infty∣y∣→∞ (stated for G~t\widetilde G_tGt​, used for GtG_tGt​), Kt>0K_t > 0Kt​>0 (Section 4), and αt+1Kt+1≤Kt\alpha_{t+1}K_{t+1} \le K_tαt+1​Kt+1​≤Kt​. The formalization adds hypotheses the paper uses without stating:

  • positive discount factors;
  • demands nonnegative almost surely;
  • every demand component has a finite mean, and ∣Gt(y)∣≤at+bt∣y∣|G_t(y)| \le a_t + b_t|y|∣Gt​(y)∣≤at​+bt​∣y∣ (so the expectation in (9) is finite);
  • continuity of VVV in the abstract Corollary 1;
  • nonnegative observed demands oto_tot​ in Lemma 3 and Theorem 2, where the lower bound fails for negative ot,t+L+1o_{t,t+L+1}ot,t+L+1​.

All hypotheses are placed on the primitives; nothing is assumed about the derived VtV_tVt​ or JtJ_tJt​. A Solutions/verification instance (G(y)=∣y∣G(y) = |y|G(y)=∣y∣, K=1K = 1K=1, α=1/2\alpha = 1/2α=1/2, zero demand) shows these hypotheses can be met together.

The definition of S‾\overline SS is read as an infimum: the paper prints a minimum over an open set. St(ot)S_t(o_t)St​(ot​) and st(ot)s_t(o_t)st​(ot​) appear through IsLeast and IsGreatest, never as sInf/sSup values. A default value therefore cannot satisfy a conclusion, and vacuous readings (an empty minimizer set, an unbounded reorder set) are excluded. The infinite-horizon results (Lemma 4, Theorem 3, Corollary 2) and the zero set-up cost case are not part of this mission. Contributions are welcome at every level, and most of all a reusable library for (a,b)(a,b)(a,b)-convex functions.

Selected references

  • G. Gallego, Ö. Özer, Integrating Replenishment Decisions with Advance Demand Information, Management Science 47(10):1344–1360, 2001. https://doi.org/10.1287/mnsc.47.10.1344.10261
  • H. Scarf, The Optimality of (S, s) Policies in the Dynamic Inventory Problem, in Mathematical Methods in the Social Sciences, Stanford University Press, 1960.
  • A. F. Veinott, On the Optimality of (s,S) Inventory Policies: New Conditions and a New Proof, SIAM Journal on Applied Mathematics 14(5):1067–1083, 1966. https://doi.org/10.1137/0114086
  • D. L. Iglehart, Optimality of (s, S) Policies in the Infinite Horizon Dynamic Inventory Problem, Management Science 9(2):259–267, 1963. https://doi.org/10.1287/mnsc.9.2.259
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Algorithmic Game TheoryMachine Learning·Captain: mikedeng1

Calibrated Learning and Correlated Equilibrium I: Calibrated Forecasts with Best Responses Converge to the Set of Correlated EquilibriaResearch Paper

Motivation

A correlated equilibrium (Aumann 1974) is a joint distribution over the players' strategy profiles such that no player gains by deviating from the strategy the distribution recommends to them. It is the equilibrium notion that learning dynamics in repeated games most naturally reach, and a basic question in learning in games is which simple rules, played repeatedly, drive the empirical distribution of play to the set of correlated equilibria.

Foster and Vohra (1997) answer this with a hypothesis on forecasts instead of a particular algorithm. Each player forecasts the other's next move and best-responds to the forecast. They only require the forecasts to be calibrated in the sense of Dawid (1982): among the rounds in which a player forecast a given probability vector, the empirical frequencies of the opponent's moves must approach that vector. Their Theorem 1 says that this already forces the empirical joint distribution of play to approach the set of correlated equilibria. The paper uses this to argue that Bayesian players under a common prior, whose forecasts are calibrated by Dawid's theorem, end up playing a correlated equilibrium. That is an alternative to Aumann's (1987) derivation of correlated equilibrium from common priors and rationality.

Timeline:

  • Aumann (1974, 1987) introduces correlated equilibrium and derives it from Bayesian rationality.
  • Dawid (1982) proposes calibration as a minimal requirement on probability forecasts.
  • Foster and Vohra (1997) prove Theorem 1 (this mission) and show that calibrated forecasts exist once the forecaster may randomize.
  • Hart and Mas-Colell (2000) give regret matching, an adaptive procedure with the same limit set.

Setting

A finite two-player game GGG has strategy sets S(1)={0,…,m−1}S(1) = \{0, \dots, m-1\}S(1)={0,…,m−1} and S(2)={0,…,n−1}S(2) = \{0, \dots, n-1\}S(2)={0,…,n−1} and payoff matrices u1,u2:S(1)×S(2)→Ru_1, u_2 : S(1) \times S(2) \to \mathbb{R}u1​,u2​:S(1)×S(2)→R, which the players maximize. A joint distribution DDD is a nonnegative m×nm \times nm×n matrix with entries summing to 111. It is a correlated equilibrium if

∑x,yD(x,y) u1(Φ(x),y)≤∑x,yD(x,y) u1(x,y)for all Φ:S(1)→S(1),\sum_{x,y} D(x,y)\, u_1(\Phi(x), y) \le \sum_{x,y} D(x,y)\, u_1(x,y) \quad \text{for all } \Phi : S(1) \to S(1),x,y∑​D(x,y)u1​(Φ(x),y)≤x,y∑​D(x,y)u1​(x,y)for all Φ:S(1)→S(1),

and symmetrically for player 2. The set of correlated equilibria is π(G)\pi(G)π(G).

The game is played in rounds s=0,1,2,…s = 0, 1, 2, \dotss=0,1,2,…. In round sss player 1 issues a forecast f1(s)f_1(s)f1​(s), a probability vector over S(2)S(2)S(2), and player 2 issues a forecast f2(s)f_2(s)f2​(s) over S(1)S(1)S(1). Each player then plays a best response to its forecast, x(s)=R1(f1(s))x(s) = R_1(f_1(s))x(s)=R1​(f1​(s)) and y(s)=R2(f2(s))y(s) = R_2(f_2(s))y(s)=R2​(f2​(s)). Here R1R_1R1​ and R2R_2R2​ are best-reply functions: R1(p)R_1(p)R1​(p) maximizes ∑ypyu1(⋅,y)\sum_y p_y u_1(\cdot, y)∑y​py​u1​(⋅,y) for every probability vector ppp, and R1R_1R1​ is a fixed function of the forecast alone. This is the paper's standing assumption of a stationary, deterministic tie-breaking rule.

For a forecast sequence fff and the opponent's plays zzz, N(p,t)N(p,t)N(p,t) counts the rounds among the first ttt in which fff forecast ppp. ρ(p,j,t)\rho(p,j,t)ρ(p,j,t) is the fraction of those rounds in which the opponent played jjj, and 000 if there are none. The forecast is calibrated with respect to zzz if for every jjj

∑p∣ρ(p,j,t)−pj∣ N(p,t)t⟶0(t→∞).\sum_p |\rho(p,j,t) - p_j|\, \frac{N(p,t)}{t} \longrightarrow 0 \qquad (t \to \infty).p∑​∣ρ(p,j,t)−pj​∣tN(p,t)​⟶0(t→∞).

The empirical joint distribution Dt(x,y)D_t(x,y)Dt​(x,y) is the fraction of the first ttt rounds in which player 1 played xxx and player 2 played yyy.

Formalization targets

Goal: Theorem 1

If f1f_1f1​ is calibrated with respect to yyy and f2f_2f2​ is calibrated with respect to xxx, then

min⁡D∈π(G) max⁡x∈S(1), y∈S(2)∣Dt(x,y)−D(x,y)∣⟶0(t→∞).\min_{D \in \pi(G)} \ \max_{x \in S(1),\, y \in S(2)} |D_t(x,y) - D(x,y)| \longrightarrow 0 \qquad (t \to \infty).D∈π(G)min​ x∈S(1),y∈S(2)max​∣Dt​(x,y)−D(x,y)∣⟶0(t→∞).

The goal fixes no rate and no particular forecasting method: it asserts only convergence of DtD_tDt​ to the set π(G)\pi(G)π(G), for every calibrated forecast.

Milestones: the steps of the proof (pp. 44–45)

  1. DtD_tDt​ lies in the simplex for t≥1t \ge 1t≥1.
  2. For each x∈S(1)x \in S(1)x∈S(1), the set Mb(x)M_b(x)Mb​(x) of mixtures to which xxx is a best response is closed and convex.
  3. The mixtures Mp(x)M_p(x)Mp​(x) at which player 1 actually plays xxx satisfy Mp(x)⊆Mb(x)M_p(x) \subseteq M_b(x)Mp​(x)⊆Mb​(x).
  4. The identity writing Dt(x,y)D_t(x,y)Dt​(x,y) as a forecast-weighted term plus a calibration error.
  5. Calibration makes the error term vanish.
  6. The weighted average of the forecasts at which player 1 plays xxx lies in Mb(x)M_b(x)Mb​(x).
  7. For a convergent subsequence Dti→DD_{t_i} \to DDti​​→D, every row of DDD with positive mass, normalized, lies in Mb(x)M_b(x)Mb​(x).
  8. Every subsequential limit of DtD_tDt​ is a correlated equilibrium.

Further result: matching pennies (p. 46)

With the constant forecast (1/2,1/2)(1/2, 1/2)(1/2,1/2) and the non-stationary tie-break "heads on even rounds, tails on odd rounds", both forecasts are calibrated and every play is a best reply, yet DtD_tDt​ does not approach π(G)\pi(G)π(G). The stationarity assumption cannot be dropped.

Significance

The result. Theorem 1 separates what learning needs from how it is achieved. Any forecasting procedure that is calibrated, combined with myopic best responses, yields correlated equilibrium behaviour in the long run. The paper's Theorem 3 constructs a randomized calibrated forecaster, so the theorem gives an uncoupled learning procedure for correlated equilibrium, one that needs no knowledge of the opponent's payoffs. The converse direction, that every correlated equilibrium arises this way for almost every game, is the paper's Theorem 2 (a separate mission of this series).

Formalizing it. The theorem is proved in the paper and has no machine-checked proof on Prove2Me or, to the knowledge of this mission, elsewhere. The platform's existing correlated-equilibrium results (the Algorithmic Game Theory swap-regret development, AGT.swap_regret_correlated_equilibrium) reach correlated equilibrium through swap regret of mixed strategies, a different hypothesis and a different object. This mission adds a formal notion of calibration and the convergence argument, both reusable for the paper's Theorems 2 and 3 and for later work on calibration and learning.

Difficulty

The obvious reading of calibration is that each player's forecast converges to the opponent's empirical distribution; if that held, best responses to it would give convergence. It does not hold. Calibration constrains the opponent's frequencies only conditionally on the forecast issued, and the forecasts need not converge at all. What must be shown is a statement about the conditional distributions of the joint play given each strategy of player 1, while the set of forecasts issued keeps growing. Rows of the limit with zero mass carry no conditional distribution. The "min → 0" form also asks for more than a property of limit points: it is a uniform statement about all large ttt.

Formalization scope

  • Strategies are Fin m and Fin n; payoffs are real matrices; forecasts are real vectors required to be probability vectors in every round.
  • A correlated equilibrium is the joint-distribution form of p. 44 (the correlated strategy on a finite probability space is represented by its law). It is the ε=0\varepsilon = 0ε=0, two-player, payoff (not cost) instance of the published AGT.IsCorrelatedEquilibrium, restated rather than imported.
  • The stationary deterministic tie-break is modelled by arbitrary best-reply functions RiR_iRi​ of the forecast. They do not depend on the round, and the statements quantify over all of them, which includes the lowest-index rule.
  • Forecasts are sequences fi:N→Rkf_i : \mathbb{N} \to \mathbb{R}^kfi​:N→Rk. The theorem uses only the realized forecasts, and every sequence is realized by a rule reading the round number from the history.
  • Rounds are indexed from 000: "the first ttt rounds" are 0,…,t−10, \dots, t-10,…,t−1. D0=0D_0 = 0D0​=0 by Lean's division convention; only t≥1t \ge 1t≥1 and limits are used.
  • The calibration sum runs over the forecasts issued in the first ttt rounds, which is the paper's sum over all ppp with its zero terms removed. ρ(p,j,t)=0\rho(p,j,t) = 0ρ(p,j,t)=0 when N(p,t)=0N(p,t) = 0N(p,t)=0, as on the page.
  • "min … → 0" is stated as: for every ε>0\varepsilon > 0ε>0, eventually some D∈π(G)D \in \pi(G)D∈π(G) is within ε\varepsilonε of DtD_tDt​ in every coordinate. The two forms are equivalent because π(G)\pi(G)π(G) is compact and nonempty. The formalization avoids an infimum over π(G)\pi(G)π(G), which Lean would evaluate to 000 on an empty set.
  • A statement that drops the best-reply property, the probability-vector condition on forecasts, or the stationarity of RiR_iRi​ is not Theorem 1: the matching pennies example shows the last one is essential. Swapping the calibration hypotheses (player 1's forecast calibrated against player 1's own plays) type-checks when m=nm = nm=n and is not the theorem.
  • Only the two-player case is claimed. The paper says the results "generalize easily to the nnn-person case" without proof.

Proofs of any milestone, and reusable lemmas about calibration scores and compactness of the simplex of joint distributions, are welcome.

Selected references

  • D. P. Foster, R. V. Vohra, Calibrated learning and correlated equilibrium, Games and Economic Behavior 21 (1997) 40–55. https://doi.org/10.1006/game.1997.0595
  • R. J. Aumann, Subjectivity and correlation in randomized strategies, Journal of Mathematical Economics 1 (1974) 67–96. https://doi.org/10.1016/0304-4068(74)90037-8
  • R. J. Aumann, Correlated equilibrium as an expression of Bayesian rationality, Econometrica 55 (1987) 1–18. https://doi.org/10.2307/1911154
  • A. P. Dawid, The well-calibrated Bayesian, Journal of the American Statistical Association 77 (1982) 605–610. https://doi.org/10.1080/01621459.1982.10477856
  • S. Hart, A. Mas-Colell, A simple adaptive procedure leading to correlated equilibrium, Econometrica 68 (2000) 1127–1150. https://doi.org/10.1111/1468-0262.00153
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ProbabilityTheoretical Computer Science·Captain: mikedeng1

Competitive Paging Algorithms I: The Marking Algorithm Is 2H_k-CompetitiveResearch Paper

Motivation

Paging is the problem of managing a two-level memory: a fast cache holds kkk pages out of an address space of nnn pages, requests to pages arrive one at a time, and a request to a page outside the cache (a page fault) forces the algorithm to bring that page in and, when the cache is full, to evict another. The cost is the number of faults. An on-line algorithm decides which page to evict without knowing future requests. The comparison of paging policies with the optimal off-line policy is where competitive analysis began.

Sleator and Tarjan showed that LRU and FIFO are within a factor kkk of the off-line optimum and that no deterministic on-line algorithm does better than kkk (Sleator–Tarjan 1985). Randomization changes the picture: Fiat, Karp, Luby, McGeoch, Sleator and Young introduced the marking algorithm and proved that its expected cost is within a factor 2Hk2H_k2Hk​ of the optimum, where Hk=1+12+⋯+1k≈ln⁡kH_k = 1 + \frac12 + \dots + \frac1k \approx \ln kHk​=1+21​+⋯+k1​≈lnk (arXiv:cs/0205038).

Timeline.

  • 1985: Sleator and Tarjan: LRU and FIFO are kkk-competitive; no deterministic algorithm beats kkk.
  • 1988: Karlin, Manasse, Rudolph and Sleator coin "competitive" and analyse flush-when-full (Algorithmica 3).
  • 1990: Manasse, McGeoch and Sleator introduce the kkk-server problem and define competitiveness for randomized algorithms (J. Algorithms 11).
  • 1991: Fiat et al.: the marking algorithm is 2Hk2H_k2Hk​-competitive, and Hn−1H_{n-1}Hn−1​-competitive when k=n−1k = n-1k=n−1; no randomized paging algorithm beats HkH_kHk​.
  • 1991: McGeoch and Sleator give an HkH_kHk​-competitive randomized paging algorithm (Algorithmica 6).
  • 2000: Achlioptas, Chrobak and Noga determine the exact competitive ratio of the marking algorithm, 2Hk−12H_k - 12Hk​−1 (Theoret. Comput. Sci. 234).

Setting

The paper works in the uniform kkk-server problem, which is isomorphic to paging. There is a set MMM of nnn vertices, enumerated e(0),…,e(n−1)e(0), \dots, e(n-1)e(0),…,e(n−1), and moving a server between two distinct vertices costs 111. There are kkk servers, 1≤k≤n1 \le k \le n1≤k≤n. A request is a vertex, and after each request some server must be on it. Cached pages are covered vertices; a fault is a server move.

The marking algorithm starts with its servers on e(0),…,e(k−1)e(0), \dots, e(k-1)e(0),…,e(k−1) and keeps a set of marked vertices, initially the covered ones. On a request to rrr:

  1. Marking. rrr is marked; the moment k+1k+1k+1 vertices are marked, all marks except the one on rrr are erased.
  2. Serving. If rrr is covered, nothing moves. Otherwise a server is chosen uniformly at random among the covered unmarked vertices and moved to rrr.

The marks are updated before the server is chosen. For a finite request sequence σ\sigmaσ, CM(σ)C_M(\sigma)CM​(σ) is the algorithm's expected number of server moves. OPT(σ)\mathrm{OPT}(\sigma)OPT(σ) is the least number of moves with which kkk servers, starting from the same configuration C0C_0C0​ and knowing σ\sigmaσ in advance, can serve σ\sigmaσ.

A randomized algorithm is ccc-competitive if there is a constant aaa such that CM(σ)≤c⋅CB(σ)+aC_M(\sigma) \le c \cdot C_B(\sigma) + aCM​(σ)≤c⋅CB​(σ)+a for every request sequence σ\sigmaσ and every algorithm BBB.

The marks divide σ\sigmaσ into phases. A new phase begins at the request that would make k+1k+1k+1 vertices marked. A vertex is clean in a phase if it was not requested in the previous phase and not yet in this one, and stale if it was requested in the previous phase but not yet in this one.

Formalization targets

Goal: Theorem 1

∃ a∈R  ∀σ:CM(σ)  ≤  2Hk⋅OPT(σ)+a.\exists\, a \in \mathbb R\ \ \forall \sigma:\qquad C_M(\sigma) \;\le\; 2H_k \cdot \mathrm{OPT}(\sigma) + a .∃a∈R  ∀σ:CM​(σ)≤2Hk​⋅OPT(σ)+a.

The constant aaa may depend on nnn, kkk and the enumeration, never on σ\sigmaσ.

Milestones (proof of Theorem 1, pp. 4–5)

  1. Without loss of generality the adversary is lazy: no move on a covered request, exactly one move otherwise (reference item, already proved on the platform).
  2. At the start of every phase the marked vertices are exactly the covered ones, and the first request of a phase is unmarked.
  3. In a phase with lll clean requests, a lazy adversary pays CA≥l−dC_A \ge l - dCA​≥l−d, where ddd counts its servers off the marking algorithm's servers at the start of the phase.
  4. It also pays CA≥d′C_A \ge d'CA​≥d′, where d′d'd′ counts its servers off the final marked set at the end of the phase.
  5. Hence CA≥max⁡(l−d,d′)≥12(l−d+d′)C_A \ge \max(l-d, d') \ge \tfrac12(l - d + d')CA​≥max(l−d,d′)≥21​(l−d+d′).
  6. A request to a stale vertex is a fault with probability c/sc/sc/s (ccc clean vertices requested so far, sss stale vertices left).
  7. The marking algorithm's expected cost in a phase is at most l(Hk−Hl+1)≤lHkl(H_k - H_l + 1) \le lH_kl(Hk​−Hl​+1)≤lHk​.

Companions

  • Theorem 2: for k=n−1k = n-1k=n−1, CM(σ)≤Hn−1⋅OPT(σ)+aC_M(\sigma) \le H_{n-1} \cdot \mathrm{OPT}(\sigma) + aCM​(σ)≤Hn−1​⋅OPT(σ)+a.
  • Tightness remark (pp. 5–6): for k=2k = 2k=2, n=4n = 4n=4 there is no aaa with CM(σ)≤H2⋅OPT(σ)+aC_M(\sigma) \le H_2 \cdot \mathrm{OPT}(\sigma) + aCM​(σ)≤H2​⋅OPT(σ)+a for all σ\sigmaσ.

Significance

The result. Theorem 1 was the first proof that randomization beats the deterministic barrier kkk for paging, bringing the ratio down to O(log⁡k)O(\log k)O(logk). Together with the paper's lower bound HkH_kHk​ for every randomized algorithm, it determines the randomized competitive ratio of paging up to a factor 222. Its phase and clean/stale accounting is reused throughout the analysis of randomized caching.

Formalizing it. The theorem is proved (1991). As far as is known it has no machine-checked proof. Formalizing it requires a probabilistic model of a randomized on-line algorithm, an off-line optimum, and a phase decomposition with an exchangeability argument, and these are the first such objects in this library. Theorem 2 and the k=2k = 2k=2, n=4n = 4n=4 example use the same definitions and also check that the formal algorithm is the paper's. The sharp ratio 2Hk−12H_k - 12Hk​−1 is a natural follow-up.

Difficulty

The comparison is between a random process and a deterministic adversary, and each side has its own obstacle.

On the algorithm's side, the configuration inside a phase is random, and the fault probability of a stale request depends on the whole history of the phase. The claim that the ccc uncovered stale vertices form a uniformly random subset of the sss stale ones is an exchangeability property of the process, and must be established from the step-by-step uniform choice. The worst-case ordering of the requests within a phase then has to be justified as a bound, not assumed.

On the adversary's side, the per-phase bound max⁡(l−d,d′)\max(l-d, d')max(l−d,d′) does not sum directly. The ddd and d′d'd′ terms telescope across phases only because the configuration of the marking algorithm at each phase boundary is deterministic. The first phase, which begins after an initial run of requests to e(0),…,e(k−1)e(0), \dots, e(k-1)e(0),…,e(k−1), and the last, incomplete phase have to be absorbed into the additive constant.

Formalization scope

The vertex set is an abstract metric space MMM with e:Fin n≃Me : \mathrm{Fin}\,n \simeq Me:Finn≃M and dist(x,y)=1\mathrm{dist}(x,y) = 1dist(x,y)=1 for x≠yx \ne yx=y. The natural metric ∣i−j∣|i - j|∣i−j∣ on Fin n\mathrm{Fin}\,nFinn is deliberately not used. The configurations and the off-line optimum OPT\mathrm{OPT}OPT are the published KServer definitions (KServer.Config, KServer.offlineCost), with OPT\mathrm{OPT}OPT taken from the marking algorithm's initial configuration. An off-line algorithm starting elsewhere changes the cost by at most kkk, which is absorbed into aaa.

The marking algorithm is a Markov chain on pairs (covered set, marked set). Each step is a PMF, with the eviction drawn by PMF.uniformOfFinset from the covered unmarked vertices. The expected cost is the sum over requests of the probability that the request is not covered, which is exact because the algorithm moves exactly one server per fault. Harmonic numbers are Mathlib's harmonic, cast to R\mathbb RR. Phases, clean counts and lazy off-line schedules are defined once, in the mission's definition file, and all milestones use them.

A trivializing formalization is ruled out as follows. The additive constant is quantified before σ\sigmaσ, so a per-sequence constant cannot be used. The comparison is with the optimum over all off-line schedules, not a particular one. The random choice is among the covered unmarked vertices, with marks updated first. The hypothesis 1≤k≤n1 \le k \le n1≤k≤n excludes the degenerate case k=0k = 0k=0, where H0=0H_0 = 0H0​=0.

Proofs of individual milestones are welcome. The laziness reduction for off-line schedules, the exchangeability lemma for the uniform eviction process, and the harmonic-sum identity ∑j=l+1kl/j=l(Hk−Hl)\sum_{j=l+1}^{k} l/j = l(H_k - H_l)∑j=l+1k​l/j=l(Hk​−Hl​) are reusable beyond this mission.

Selected references

  • A. Fiat, R. M. Karp, M. Luby, L. A. McGeoch, D. D. Sleator, N. E. Young, Competitive Paging Algorithms, J. Algorithms 12(4):685–699, 1991; arXiv:cs/0205038v1. https://arxiv.org/abs/cs/0205038
  • D. D. Sleator, R. E. Tarjan, Amortized Efficiency of List Update and Paging Rules, Comm. ACM 28(2):202–208, 1985. https://doi.org/10.1145/2786.2793
  • A. R. Karlin, M. S. Manasse, L. Rudolph, D. D. Sleator, Competitive Snoopy Caching, Algorithmica 3:79–119, 1988. https://doi.org/10.1007/BF01762111
  • M. S. Manasse, L. A. McGeoch, D. D. Sleator, Competitive Algorithms for Server Problems, J. Algorithms 11(2):208–230, 1990. https://doi.org/10.1016/0196-6774(90)90003-W
  • L. A. McGeoch, D. D. Sleator, A Strongly Competitive Randomized Paging Algorithm, Algorithmica 6:816–825, 1991. https://doi.org/10.1007/BF01759073
  • D. Achlioptas, M. Chrobak, J. Noga, Competitive Analysis of Randomized Paging Algorithms, Theoret. Comput. Sci. 234:203–218, 2000. https://doi.org/10.1016/S0304-3975(98)00116-9
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Algorithmic Game TheoryMechanism DesignProbability·Captain: mikedeng1

Bargaining under Incomplete Information I: Class A Equilibrium Offer Strategies Satisfy the Linked Differential EquationsResearch Paper

Motivation

A buyer and a seller negotiate over a single indivisible good. Each knows how much the good is worth to them, but not how much it is worth to the other side. Whether the two will trade, and at what price, then depends on how each party shades its offer to exploit the other's uncertainty. Chatterjee and Samuelson (Bargaining under Incomplete Information, Operations Research 31(5), 1983) modelled this situation as a one-shot game in which both parties submit sealed offers simultaneously, and characterised its Bayesian equilibria.

The model became the standard reference point for bilateral trade with two-sided private information. Myerson and Satterthwaite (J. Econ. Theory 29, 1983) showed that no mechanism can guarantee efficient trade in this setting, and that the equilibrium of the Chatterjee–Samuelson game with k=1/2k = 1/2k=1/2 and uniform values attains the second-best efficiency bound. Later work on the kkk-double auction (Satterthwaite and Williams, J. Econ. Theory 48, 1989; Leininger, Linhart and Radner, J. Econ. Theory 48, 1989) studies the continuum of equilibria of exactly this game. The object of the present mission, a pair of linked differential equations, is the tool these papers use to construct and classify equilibria.

Setting

A seller has reservation price vs∈[v‾s,vˉs]v_s \in [\underline v_s, \bar v_s]vs​∈[v​s​,vˉs​] and a buyer has reservation price vb∈[v‾b,vˉb]v_b \in [\underline v_b, \bar v_b]vb​∈[v​b​,vˉb​]. Each knows their own value. The buyer's belief about vsv_svs​ is a probability measure μb\mu_bμb​ with distribution function FbF_bFb​; the seller's belief about vbv_bvb​ is μs\mu_sμs​ with distribution function FsF_sFs​. The subscript names the player who holds the belief, not the variable. Each belief is regular: F(v‾)=0F(\underline v) = 0F(v​)=0, F(vˉ)=1F(\bar v) = 1F(vˉ)=1, and FFF is strictly increasing and differentiable on the value interval, with density fbf_bfb​ (respectively fsf_sfs​).

Under the Bargaining Rule, the seller asks sss and the buyer offers bbb simultaneously. If b≥sb \ge sb≥s the good is sold at P=kb+(1−k)sP = kb + (1-k)sP=kb+(1−k)s for a fixed k∈[0,1]k \in [0, 1]k∈[0,1]; otherwise nothing happens. Profits are P−vsP - v_sP−vs​ for the seller and vb−Pv_b - Pvb​−P for the buyer on trade, and zero otherwise.

An offer strategy is a function SSS (for the seller) or BBB (for the buyer) from values to offers. Against SSS, a buyer with value vvv offering bbb earns in expectation

πb(b,v)=∫1{S(vs)≤b} (v−kb−(1−k)S(vs)) dμb(vs),\pi_b(b, v) = \int \mathbf 1\{S(v_s) \le b\}\,\bigl(v - kb - (1-k)S(v_s)\bigr)\,d\mu_b(v_s),πb​(b,v)=∫1{S(vs​)≤b}(v−kb−(1−k)S(vs​))dμb​(vs​),

and symmetrically πs(s,v)=∫1{s≤B(vb)} (kB(vb)+(1−k)s−v) dμs(vb)\pi_s(s, v) = \int \mathbf 1\{s \le B(v_b)\}\,(kB(v_b) + (1-k)s - v)\,d\mu_s(v_b)πs​(s,v)=∫1{s≤B(vb​)}(kB(vb​)+(1−k)s−v)dμs​(vb​). The pair (S,B)(S, B)(S,B) is an equilibrium if B(v)B(v)B(v) maximises πb(⋅,v)\pi_b(\cdot, v)πb​(⋅,v) over all real offers for every buyer value vvv, and S(v)S(v)S(v) maximises πs(⋅,v)\pi_s(\cdot, v)πs​(⋅,v) for every seller value vvv.

A strategy is of class AAA if its offers are bounded, it is nondecreasing, it is strictly increasing except where it sits at its lowest offer mmm or its highest offer MMM, and it is differentiable wherever its offer lies strictly between mmm and MMM. A class AAA equilibrium is an equilibrium in which both strategies are of class AAA.

Formalization targets

Goal: Theorem 2, the linked differential equations

In a class AAA equilibrium, wherever the seller's strategy is strictly increasing around yyy and the buyer value xxx offers B(x)=S(y)B(x) = S(y)B(x)=S(y),

kFb(y)S′(y)+fb(y)S(y)=x fb(y),(3a)k F_b(y) S'(y) + f_b(y) S(y) = x\, f_b(y), \tag{3a}kFb​(y)S′(y)+fb​(y)S(y)=xfb​(y),(3a)

and wherever the buyer's strategy is strictly increasing around xxx and the seller value yyy asks S(y)=B(x)S(y) = B(x)S(y)=B(x),

(1−k)(1−Fs(x))B′(x)−fs(x)B(x)=− y fs(x).(3b)(1-k)\bigl(1 - F_s(x)\bigr) B'(x) - f_s(x) B(x) = -\,y\, f_s(x). \tag{3b}(1−k)(1−Fs​(x))B′(x)−fs​(x)B(x)=−yfs​(x).(3b)

The paper writes x=B−1(S(y))x = B^{-1}(S(y))x=B−1(S(y)) in (3a) and y=S−1(B(x))y = S^{-1}(B(x))y=S−1(B(x)) in (3b).

Milestones: the displays of the proof

  1. Gb(S(y))=Fb(y)G_b(S(y)) = F_b(y)Gb​(S(y))=Fb​(y): the buyer's probability that the seller asks at most S(y)S(y)S(y) equals Fb(y)F_b(y)Fb​(y).
  2. The buyer's first-order condition: ∂πb/∂b=(v−b)gb(b)−kGb(b)\partial \pi_b / \partial b = (v - b) g_b(b) - k G_b(b)∂πb​/∂b=(v−b)gb​(b)−kGb​(b) at b=S(y)b = S(y)b=S(y), with offer density gb(S(y))=fb(y)/S′(y)g_b(S(y)) = f_b(y)/S'(y)gb​(S(y))=fb​(y)/S′(y), and it vanishes at an equilibrium offer.
  3. The seller's first-order condition: ∂πs/∂s=(v−s)gs(s)+(1−k)(1−Gs(s))\partial \pi_s / \partial s = (v - s) g_s(s) + (1-k)(1 - G_s(s))∂πs​/∂s=(v−s)gs​(s)+(1−k)(1−Gs​(s)) at s=B(x)s = B(x)s=B(x), and it vanishes at an equilibrium ask.

The milestones assume S′(y)>0S'(y) > 0S′(y)>0 (respectively B′(x)>0B'(x) > 0B′(x)>0), which the paper's formula for the offer density needs. The goal does not assume it.

Significance

Theorem 2 reduces the search for equilibria to the analysis of a pair of ordinary differential equations. Every explicit equilibrium in the paper and in the later kkk-double-auction literature is found as a solution of (3a)–(3b) with suitable boundary conditions: the linear equilibrium for uniform beliefs (the paper's Example 1), the one-parameter families of Satterthwaite–Williams, and the non-linear equilibria of Leininger–Linhart–Radner. The equations also expose how the split parameter kkk distributes bargaining power: at k=1k = 1k=1 equation (3b) forces the seller to ask their own value, and at k=0k = 0k=0 equation (3a) forces the buyer to bid theirs.

The result is proved in the paper. To the best of a search of the platform, no formalization of it or of the bargaining model exists. This mission produces a machine-checked version of the necessary conditions. Its definitions of beliefs, expected profits, equilibrium and class AAA are also the basis for companion missions on the uniform linear equilibrium and its trade probability.

Difficulty

The paper's proof is four lines: differentiate the expected profit, set the derivative to zero, substitute. Three steps of that argument do not survive a careful reading.

First, the paper differentiates under an offer density gbg_bgb​ that exists only if SSS is strictly increasing and has a positive derivative. Class AAA allows SSS to be flat at its bounds, to jump between them, and to have zero derivative. The formal goal assumes none of this. It must handle the case S′(y)=0S'(y) = 0S′(y)=0, where the offer distribution has an infinite density at S(y)S(y)S(y) and the first-order condition becomes a one-sided argument.

Second, identifying Gb(S(y))G_b(S(y))Gb​(S(y)) with Fb(y)F_b(y)Fb​(y) requires that no seller value outside a neighbourhood of yyy makes the same offer. That is a global statement about SSS, and it is where monotonicity on the whole interval and the "flat only at the bounds" clause of class AAA enter.

Third, the first-order condition needs the equilibrium offer S(y)S(y)S(y) to be an interior maximiser of a function of bbb that is differentiable there. The profit πb\pi_bπb​ is an integral over the belief, and its differentiability at S(y)S(y)S(y) must be derived from the differentiability of SSS at the single point yyy and of FbF_bFb​. Neither SSS nor πb\pi_bπb​ is assumed continuous elsewhere.

Formalization scope

Values, offers and kkk are real numbers. Beliefs are probability measures on R\mathbb RR, with distribution function Mathlib's ProbabilityTheory.cdf. Expected profits are Bochner integrals over the opponent's value, not over an offer density. The two agree whenever the density exists, and the integral form needs none. Integrability is not assumed: for a class AAA strategy and a regular belief supported on the value interval, the integrand is bounded and almost everywhere measurable. Ties (b=sb = sb=s) trade. Deviations range over all real offers. Strategies are arbitrary functions R→R\mathbb R \to \mathbb RR→R whose values outside the value interval play no role.

The derivative S′(y)S'(y)S′(y) is deriv S y. The paper's inverses B−1B^{-1}B−1 and S−1S^{-1}S−1 are not introduced as functions. The matching value is a universally quantified variable xxx with B(x)=S(y)B(x) = S(y)B(x)=S(y), so no junk value of an inverse can make an equation true or false. The equations are asserted only at values yyy interior to an open subinterval on which SSS is strictly increasing. A formalization that assumed the first-order condition, or restricted to strategies with S′>0S' > 0S′>0 everywhere, would be a different and weaker theorem.

A complete development needs: differentiation of parametric integrals of indicator type (the derivative of b↦∫1{S≤b} h dμb \mapsto \int \mathbf 1\{S \le b\}\,h\,d\mub↦∫1{S≤b}hdμ), the change of variables from values to offers under a strictly increasing strategy, and Fermat's rule (IsLocalMax.hasDerivAt_eq_zero). The first two are reusable for auctions and other Bayesian games with monotone strategies. Proofs of the milestones, alternative proofs of the goal, and general lemmas about monotone strategies are welcome.

Selected references

  • K. Chatterjee and W. Samuelson, Bargaining under Incomplete Information, Operations Research 31(5):835–851, 1983. https://doi.org/10.1287/opre.31.5.835
  • R. B. Myerson and M. A. Satterthwaite, Efficient Mechanisms for Bilateral Trading, Journal of Economic Theory 29(2):265–281, 1983. https://doi.org/10.1016/0022-0531(83)90048-0
  • M. A. Satterthwaite and S. R. Williams, Bilateral Trade with the Sealed Bid k-Double Auction: Existence and Efficiency, Journal of Economic Theory 48(1):107–133, 1989. https://doi.org/10.1016/0022-0531(89)90120-8
  • W. Leininger, P. B. Linhart and R. Radner, Equilibria of the Sealed-Bid Mechanism for Bargaining with Incomplete Information, Journal of Economic Theory 48(1):63–106, 1989. https://doi.org/10.1016/0022-0531(89)90121-X
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Convex OptimizationOptimization·Captain: mikedeng1

The Generalized Quasi-Variational Inequality Problem II: Existence via Projection and the Brouwer Fixed Point TheoremResearch Paper

Motivation

A variational inequality asks for a point xxx of a set K⊆RnK\subseteq\mathbb R^nK⊆Rn at which a vector field fff makes a non-obtuse angle with every feasible direction: (x′−x)Tf(x)≥0(x'-x)^T f(x)\ge 0(x′−x)Tf(x)≥0 for all x′∈Kx'\in Kx′∈K. It is the common form of the first-order optimality condition of a constrained optimization problem, of complementarity problems in mathematical programming, and of equilibrium conditions in traffic networks and economics. Two generalizations are standard in operations research. In a quasi-variational inequality the constraint set depends on the unknown, K=K(x)K=K(x)K=K(x), as in generalized Nash games where each player's feasible set depends on the other players' choices. In a generalized variational inequality the vector field is set-valued, y∈f(x)y\in f(x)y∈f(x), as when fff is the subdifferential of a nonsmooth convex function.

D. Chan and J. S. Pang (Math. Oper. Res. 7 (1982) 211–222) introduced the problem that combines both, the generalized quasi-variational inequality (GQVI), and proved existence theorems for it. Their §5 gives a second route to existence, independent of the set-valued fixed point theory of their §3: a solution is a fixed point of a map built from Euclidean projections, and for single-valued continuous fff the Brouwer fixed point theorem produces one. The characterization of solutions as projection fixed points, for the generalized variational inequality, is due to Fang and Peterson (reference [11] of the paper, a 1979 University of Maryland Baltimore County research report). This mission formalizes that projection route.

Setting

Work in Rn\mathbb R^nRn with the Euclidean inner product xTyx^TyxTy and norm ∥x∥\|x\|∥x∥. A point-to-set mapping KKK assigns to each x∈Rnx\in\mathbb R^nx∈Rn a subset K(x)⊆RnK(x)\subseteq\mathbb R^nK(x)⊆Rn; a point-to-point mapping fff assigns a vector f(x)f(x)f(x).

The GQVI. Given point-to-set mappings KKK and fff, GQVI(K,f)\mathrm{GQVI}(K,f)GQVI(K,f) asks for vectors xxx and yyy with

x∈K(x),y∈f(x),(x′−x)Ty≥0  for all x′∈K(x).x\in K(x),\qquad y\in f(x),\qquad (x'-x)^Ty\ge 0\ \text{ for all } x'\in K(x).x∈K(x),y∈f(x),(x′−x)Ty≥0  for all x′∈K(x).

Such a pair is a solution. For a point-to-point fff one takes y=f(x)y=f(x)y=f(x): find x∈K(x)x\in K(x)x∈K(x) with (x′−x)Tf(x)≥0(x'-x)^Tf(x)\ge0(x′−x)Tf(x)≥0 for all x′∈K(x)x'\in K(x)x′∈K(x).

Projection. For a set SSS and a point zzz, the projection PS(z)=sol⁡min⁡x∈S∥x−z∥P_S(z)=\operatorname{sol}\min_{x\in S}\|x-z\|PS​(z)=solminx∈S​∥x−z∥ is the nearest point of SSS to zzz. For nonempty closed convex SSS it exists and is unique.

Semicontinuity of point-to-set mappings (Berge). KKK is upper semicontinuous at xxx if for every open G⊇K(x)G\supseteq K(x)G⊇K(x) there is a neighbourhood NNN of xxx with K(x′)⊆GK(x')\subseteq GK(x′)⊆G for x′∈Nx'\in Nx′∈N; lower semicontinuous at xxx if for every open GGG meeting K(x)K(x)K(x) there is a neighbourhood NNN of xxx with K(x′)∩G≠∅K(x')\cap G\ne\emptysetK(x′)∩G=∅ for x′∈Nx'\in Nx′∈N; continuous if both. "On a set CCC" means at every point of CCC, with neighbourhoods relative to CCC.

Formalization targets

Goal: Theorem 5.2 (p. 220)

Let fff be continuous on a nonempty compact convex set CCC, and let KKK be a continuous mapping on CCC whose values K(x)K(x)K(x), x∈Cx\in Cx∈C, are nonempty, closed, convex and contained in CCC. Then there is xxx with

x∈K(x),(x′−x)Tf(x)≥0for all x′∈K(x).x\in K(x),\qquad (x'-x)^Tf(x)\ge 0\quad\text{for all }x'\in K(x).x∈K(x),(x′−x)Tf(x)≥0for all x′∈K(x).

Milestone: Lemma 5.1 (p. 220)

If KKK is continuous at x0x_0x0​ and every K(x)K(x)K(x) is nonempty, closed and convex, then for every y0y_0y0​ the map

(x,y)⟼p(x,y)=PK(x)(y)(x,y)\longmapsto p(x,y)=P_{K(x)}(y)(x,y)⟼p(x,y)=PK(x)​(y)

is continuous at (x0,y0)(x_0,y_0)(x0​,y0​).

Milestone: Theorem 5.1 (p. 220)

If every K(x)K(x)K(x) is closed and convex, then for every pair (x∗,y∗)(x^*,y^*)(x∗,y∗)

(x∗,y∗) solves GQVI(K,f)  ⟺  x∗=PK(x∗)(x∗−y∗) and y∗∈f(x∗).(x^*,y^*)\ \text{solves}\ \mathrm{GQVI}(K,f)\iff x^*=P_{K(x^*)}(x^*-y^*)\ \text{and}\ y^*\in f(x^*).(x∗,y∗) solves GQVI(K,f)⟺x∗=PK(x∗)​(x∗−y∗) and y∗∈f(x∗).

The Brouwer fixed point theorem is already on the platform (AGT.brouwer_fixed_point) and is included as a reference item, as is the Hilbert-space nearest-point theorem VectorSpaceOpt.min_distance_convex_set.

Significance

Theorem 5.2 is the existence theorem for quasi-variational inequalities with a moving convex constraint set and a continuous single-valued field, under compactness. With KKK constant it is the Hartman–Stampacchia theorem (Acta Math. 115 (1966) 271–310), the basic existence result for finite-dimensional variational inequalities, and so it also covers existence of equilibria of generalized Nash games whose shared constraints satisfy the continuity hypotheses. The paper notes that Theorem 5.2 also follows from its Corollary 3.1, which rests on the Eilenberg–Montgomery fixed point theorem; the projection route needs only Brouwer.

Theorem 5.1 matters beyond this existence result: it turns the GQVI into a fixed-point equation, which is the basis of projection algorithms for variational inequalities and of the contraction argument of the paper's Theorem 5.3. Lemma 5.1, continuity of the projection onto a continuously moving closed convex set, is a stability result used throughout parametric optimization.

All three statements were proved in 1982. None has a machine-checked proof on the platform or in Mathlib, which has neither a projection onto a general closed convex set as a function of the set nor any variational inequality. The work of this mission is to formalize the known proofs.

Difficulty

Theorem 5.1 is a direct consequence of the variational characterization of the nearest point of a convex set. The substance lies in Lemma 5.1 and in adapting it to the goal. The projection depends on the set K(x)K(x)K(x), not only on the point, and continuity of KKK is a statement about sets, given by two separate semicontinuity conditions that each control only one side of the convergence. Neither alone suffices: upper semicontinuity without lower lets K(x)K(x)K(x) shrink abruptly and the nearest point jump; lower without upper lets limits of nearest points fall outside K(x0)K(x_0)K(x0​). The limit points of the projections must also be kept bounded, which needs the nonemptiness near x0x_0x0​.

A second difficulty is that the goal assumes continuity of KKK only on CCC, with neighbourhoods relative to CCC, while Lemma 5.1 is stated for continuity at a point of Rn\mathbb R^nRn. Applying the lemma to the composite map x↦PK(x)(x−f(x))x\mapsto P_{K(x)}(x-f(x))x↦PK(x)​(x−f(x)) on CCC therefore requires either a relative version of the lemma or a reduction; the lemma cannot be quoted verbatim.

Formalization scope

The space is EuclideanSpace ℝ (Fin n) with its Euclidean norm, never the sup-norm space Fin n → ℝ. Point-to-set mappings are functions into Set. The solution predicate is IsGQVISolution K f x y; a point-to-point fff enters as fun z => {f z}. Upper and lower semicontinuity are Mathlib's UpperHemicontinuousAt/On and LowerHemicontinuousAt/On; "continuous on CCC" is both, relative to CCC.

The projection is IsProj S z p (nearest-point predicate) and proj S z, which returns a nearest point when one exists and the junk value zzz otherwise. Theorem 5.1 uses the relational form, so no junk value enters when K(x∗)=∅K(x^*)=\emptysetK(x∗)=∅. Lemma 5.1 assumes every K(x)K(x)K(x) nonempty, closed and convex, so proj is always the true projection there.

Two hypotheses implicit in the paper are explicit:

  1. Closed values in Theorem 5.2. The paper uses Berge's definitions, under which upper semicontinuous mappings have compact values, and its proof uses that each K(x)K(x)K(x) is closed. The Lean statement assumes K(x)K(x)K(x) closed for x∈Cx\in Cx∈C; without it the theorem is false (C=[0,1]C=[0,1]C=[0,1], K(x)≡(0,1)K(x)\equiv(0,1)K(x)≡(0,1), f≡1f\equiv1f≡1).
  2. Nonempty values in Lemma 5.1. The projection function p(x,y)=PK(x)(y)p(x,y)=P_{K(x)}(y)p(x,y)=PK(x)​(y) is defined only for nonempty K(x)K(x)K(x); the Lean statement assumes K(x)≠∅K(x)\ne\emptysetK(x)=∅ for all xxx.

A formalization in which the projection is merely "some point of K(x)K(x)K(x)", or ignores the distance, would make the reverse direction of Theorem 5.1 false and Lemma 5.1 meaningless; a GQVI whose test points range over CCC instead of K(x)K(x)K(x) would turn Theorem 5.2 into a plain variational inequality on CCC. Both are excluded by the definitions above.

A complete development needs the nearest-point characterization on closed convex sets (available in Mathlib and on the platform), sequential characterizations of upper and lower hemicontinuity for closed-valued mappings in Rn\mathbb R^nRn, continuity of the projection onto a moving convex set, and Brouwer's theorem (a platform reference). The hemicontinuity lemmas and the projection-continuity lemma are reusable for the other missions of this series and for parametric optimization in general. Proofs of Lemma 5.1 and Theorem 5.1, a relative-to-CCC version of Lemma 5.1, and a proof of Brouwer's theorem are all welcome.

Selected references

  • D. Chan and J. S. Pang, The generalized quasi-variational inequality problem, Mathematics of Operations Research 7(2) (1982) 211–222. https://doi.org/10.1287/moor.7.2.211
  • S. C. Fang and E. L. Peterson, Generalized variational inequalities, Mathematics Research Report No. 79-10, Department of Mathematics, University of Maryland Baltimore County, October 1979 (cited by Chan and Pang as [11]; no online copy).
  • P. Hartman and G. Stampacchia, On some non-linear elliptic differential-functional equations, Acta Mathematica 115 (1966) 271–310. https://doi.org/10.1007/BF02392210
  • C. Berge, Topological Spaces, The Macmillan Company, New York, 1963 (definitions of upper and lower semicontinuity of point-to-set mappings).
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Control TheoryDynamic ProgrammingOptimization·Captain: mikedeng1

Monotone Mappings with Application in Dynamic Programming I: Compactness Gives Convergence of the DP Algorithm and an Optimal Stationary Policy under Uniform IncreaseResearch Paper

Motivation

Infinite-horizon optimal control problems with nonnegative costs (Strauch's negative dynamic programming, the positive-cost counterpart of Blackwell's positive model) are among the settings where the standard tools of discounted dynamic programming fail: there is no contraction, costs may be infinite, and the value-iteration algorithm started from zero may converge to the wrong limit. Strauch showed in 1966 that under these assumptions the limit of value iteration can lie strictly below the optimal cost (Strauch 1966). Bertsekas (1977) recast the deterministic, stochastic and minimax versions of these problems as one abstract problem about a monotone mapping HHH, and proved Bellman's equation, optimality criteria for stationary policies, and conditions for convergence of the dynamic programming algorithm at that level of generality (Bertsekas 1977). This framework became the basis of the "abstract dynamic programming" theory developed later in Bertsekas and Shreve (1978) and Bertsekas (2013, 2022).

This mission formalizes the part of the paper that works under the uniform increase assumption, culminating in the paper's compactness condition for convergence of value iteration.

Setting

A model consists of a nonempty state space SSS, a control space CCC, for each x∈Sx\in Sx∈S a nonempty constraint set U(x)⊆CU(x)\subseteq CU(x)⊆C, a mapping H:S×C×F→[−∞,+∞]H:S\times C\times F\to[-\infty,+\infty]H:S×C×F→[−∞,+∞], where FFF is the set of functions J:S→[−∞,∞]J:S\to[-\infty,\infty]J:S→[−∞,∞] ordered pointwise, and a terminal function Jˉ∈F\bar J\in FJˉ∈F with Jˉ(x)>−∞\bar J(x)>-\inftyJˉ(x)>−∞. HHH is monotone: J≤J′J\le J'J≤J′ implies H(x,u,J)≤H(x,u,J′)H(x,u,J)\le H(x,u,J')H(x,u,J)≤H(x,u,J′) for u∈U(x)u\in U(x)u∈U(x).

A selector is μ:S→C\mu:S\to Cμ:S→C with μ(x)∈U(x)\mu(x)\in U(x)μ(x)∈U(x); a policy is a sequence π={μ0,μ1,… }\pi=\{\mu_0,\mu_1,\dots\}π={μ0​,μ1​,…} of selectors, and {μ,μ,… }\{\mu,\mu,\dots\}{μ,μ,…} is stationary. Define

Tμ(J)(x)=H(x,μ(x),J),T(J)(x)=inf⁡u∈U(x)H(x,u,J),T_\mu(J)(x)=H(x,\mu(x),J),\qquad T(J)(x)=\inf_{u\in U(x)}H(x,u,J),Tμ​(J)(x)=H(x,μ(x),J),T(J)(x)=u∈U(x)inf​H(x,u,J), Jπ(x)=lim⁡N→∞(Tμ0⋯TμN−1)(Jˉ)(x),J∗(x)=inf⁡πJπ(x),J∞(x)=lim⁡N→∞TN(Jˉ)(x).J_\pi(x)=\lim_{N\to\infty}(T_{\mu_0}\cdots T_{\mu_{N-1}})(\bar J)(x),\qquad J^*(x)=\inf_\pi J_\pi(x),\qquad J_\infty(x)=\lim_{N\to\infty}T^N(\bar J)(x).Jπ​(x)=N→∞lim​(Tμ0​​⋯TμN−1​​)(Jˉ)(x),J∗(x)=πinf​Jπ​(x),J∞​(x)=N→∞lim​TN(Jˉ)(x).

J∗J^*J∗ is the optimal value function and J∞J_\inftyJ∞​ the limit of the dynamic programming algorithm. A policy is optimal if Jπ=J∗J_\pi=J^*Jπ​=J∗.

Assumption I is Jˉ(x)≤H(x,u,Jˉ)\bar J(x)\le H(x,u,\bar J)Jˉ(x)≤H(x,u,Jˉ) for all xxx and u∈U(x)u\in U(x)u∈U(x). Assumption I.1 says that H(x,u,⋅)H(x,u,\cdot)H(x,u,⋅) commutes with limits of nondecreasing sequences above Jˉ\bar JJˉ. Assumption I.2 says there is α>0\alpha>0α>0 with H(x,u,J)≤H(x,u,J+re)≤H(x,u,J)+αrH(x,u,J)\le H(x,u,J+re)\le H(x,u,J)+\alpha rH(x,u,J)≤H(x,u,J+re)≤H(x,u,J)+αr for r>0r>0r>0 and J≥JˉJ\ge\bar JJ≥Jˉ, where e≡1e\equiv1e≡1. For the convergence analysis the paper introduces, for k≥1k\ge1k≥1, the sets Ck={(x,u,λ)∣u∈U(x), H[x,u,Tk−1(Jˉ)]≤λ}C_k=\{(x,u,\lambda)\mid u\in U(x),\ H[x,u,T^{k-1}(\bar J)]\le\lambda\}Ck​={(x,u,λ)∣u∈U(x), H[x,u,Tk−1(Jˉ)]≤λ} with λ\lambdaλ real, their projections P(Ck)P(C_k)P(Ck​) on (x,λ)(x,\lambda)(x,λ) through admissible uuu, and the closure P(Ck)‾\overline{P(C_k)}P(Ck​)​ obtained by adding limits of real sequences λn\lambda_nλn​ at fixed xxx.

Formalization targets

Goal: Proposition 12

Let I, I.1, I.2 hold, let CCC be a Hausdorff topological space, and suppose there is kˉ\bar kkˉ such that Uk(x,λ)={u∈U(x)∣H[x,u,Tk(Jˉ)]≤λ}U_k(x,\lambda)=\{u\in U(x)\mid H[x,u,T^k(\bar J)]\le\lambda\}Uk​(x,λ)={u∈U(x)∣H[x,u,Tk(Jˉ)]≤λ} is compact for every xxx, real λ\lambdaλ and k≥kˉk\ge\bar kk≥kˉ. Then

P(⋂k≥1Ck)=⋂k≥1P(Ck)‾,J∞=T(J∞)=T(J∗)=J∗,P\Bigl(\bigcap_{k\ge1}C_k\Bigr)=\bigcap_{k\ge1}\overline{P(C_k)},\qquad J_\infty=T(J_\infty)=T(J^*)=J^*,P(k≥1⋂​Ck​)=k≥1⋂​P(Ck​)​,J∞​=T(J∞​)=T(J∗)=J∗,

and there exists an optimal stationary policy.

Milestones

In attack order: Proposition 2 (JN=TN(Jˉ)J_N=T^N(\bar J)JN​=TN(Jˉ) for the NNN-stage problem); Proposition 4 (ε\varepsilonε-optimal policies, stationary when α<1\alpha<1α<1); Proposition 5 (Bellman's equation J∗=T(J∗)J^*=T(J^*)J∗=T(J∗) and minimality of J∗J^*J∗ among TTT-excessive functions above Jˉ\bar JJˉ); Corollary 5.1 (the same for JμJ_\muJμ​); Proposition 7 ({μ∗,μ∗,… }\{\mu^*,\mu^*,\dots\}{μ∗,μ∗,…} is optimal iff Tμ∗(J∗)=T(J∗)T_{\mu^*}(J^*)=T(J^*)Tμ∗​(J∗)=T(J∗)); Proposition 10 (J∞≤T(J∞)≤T(J∗)=J∗J_\infty\le T(J_\infty)\le T(J^*)=J^*J∞​≤T(J∞​)≤T(J∗)=J∗, with equality throughout iff J∞=T(J∞)J_\infty=T(J_\infty)J∞​=T(J∞​)); Lemma 2 (P(Ck)‾=E[Tk(Jˉ)]\overline{P(C_k)}=E[T^k(\bar J)]P(Ck​)​=E[Tk(Jˉ)], the epigraph); Proposition 11 (convergence of value iteration is equivalent to interchanging projection and intersection); Lemma 3 (a function with compact real sublevel sets attains its minimum).

Significance

The result. Proposition 12 gives a checkable condition, compactness of sublevel sets of the one-stage costs, under which value iteration started at Jˉ\bar JJˉ converges to the optimal cost and an optimal stationary policy exists, in any model covered by the abstract framework: deterministic and stochastic control with nonnegative costs, minimax control, and problems with state constraints encoded by infinite costs. Without such a condition the algorithm can stall below J∗J^*J∗ even in one-dimensional deterministic problems. Propositions 5 and 7 are the abstract form of the classical Bellman equation and optimality criterion for positive-cost problems.

Formalizing it. The results are proved in the paper. The platform's existing dynamic programming results are finite-state, real-valued and contraction-based; none covers extended-real costs, general state spaces, or the uniform increase regime. This mission would produce a machine-checked abstract DP layer over EReal in which the Bellman equation, the stationary-policy criterion and the convergence conditions are proved once for every model satisfying the assumptions. No machine-checked proof of these results is known.

Difficulty

The obvious argument for J∞=J∗J_\infty=J^*J∞​=J∗ interchanges a limit in NNN with an infimum over policies. Under Assumption I the iterates increase, and a limit of infima of an increasing family can be strictly smaller than the infimum of the limits; the paper's own example in Section 1 shows it. Monotone convergence arguments therefore do not apply. The paper converts the interchange into a statement about projections of the sets CkC_kCk​ and closes the gap with a compactness argument, which requires handling infinite values carefully: epigraphs are taken over real λ\lambdaλ only, and states where the value is +∞+\infty+∞ are treated separately. Proposition 4, on which Bellman's equation rests, needs a selection of nearly optimal policies state by state and a geometric control of the errors through I.2.

Formalization scope

Functions in FFF are S → EReal. Policies are sequences ℕ → Selector, where a selector is a function with μ(x)∈U(x)\mu(x)\in U(x)μ(x)∈U(x) for all xxx. The composition Tμ0⋯TμN−1T_{\mu_0}\cdots T_{\mu_{N-1}}Tμ0​​⋯TμN−1​​ applies TμN−1T_{\mu_{N-1}}TμN−1​​ first. JπJ_\piJπ​ and J∞J_\inftyJ∞​ are limUnder atTop of their defining sequences. Every statement assumes Assumption I, under which these sequences are nondecreasing and the limits exist. TTT takes the infimum over U(x)U(x)U(x) only and J∗J^*J∗ over admissible policies only. Both SSS and each U(x)U(x)U(x) are nonempty. λ\lambdaλ ranges over R\mathbb RR, and the closure  ⋅ ‾\overline{\,\cdot\,}⋅ is the sequential closure in λ\lambdaλ at fixed xxx, not a topological closure on S×RS\times\mathbb RS×R. The sets CkC_kCk​ are used only for k≥1k\ge1k≥1. I.2 is parameterized by its scalar α\alphaα. Proposition 4's second part refers to the α\alphaα for which I.2 is assumed.

Repairs of the page. Lemma 3 is false as printed. On N\mathbb NN with the cofinite topology every subset is compact, yet f(n)=−nf(n)=-nf(n)=−n has no minimum. It also fails for U=∅U=\emptysetU=∅. The mission states Lemma 3 for a Hausdorff space CCC and nonempty UUU, and Proposition 12 for a Hausdorff control space. Proposition 12 is also false as printed: with S={0}S=\{0\}S={0}, C=U(0)=NC=U(0)=\mathbb NC=U(0)=N cofinite, Jˉ(0)=0\bar J(0)=0Jˉ(0)=0 and H(0,u,J)=J(0)+1/(u+1)H(0,u,J)=J(0)+1/(u+1)H(0,u,J)=J(0)+1/(u+1), all hypotheses hold but no stationary policy is optimal and (70) fails. Proposition 11(b)'s parenthetical "(equivalently there exists an optimal stationary policy)" holds only together with J∞=J∗J_\infty=J^*J∞​=J∗ (the paper cites an example with an optimal stationary policy and J∞≠J∗J_\infty\neq J^*J∞​=J∗). It is stated in that joint form, never as an equivalence between condition (68) and the bare existence of an optimal stationary policy.

Trivializing readings ruled out. An empty constraint set would make T≡+∞T\equiv+\inftyT≡+∞ and the policy set empty, so every Bellman identity would hold trivially. The model therefore requires U(x)≠∅U(x)\neq\emptysetU(x)=∅. The goal's three conclusions, (70), the chain of equalities and the optimal stationary policy, are all required, so a formalization that states only one of them is not the goal.

Needed infrastructure: monotone limits in EReal, infima over sets, and compactness in Hausdorff spaces (Mathlib's Cantor intersection theorem). The definitions (model, assumptions, epigraph sets) can be reused for the companion mission under Assumption D and for later abstract DP developments. Proofs of any milestone are welcome, as are reusable lemmas on monotone EReal sequences.

Selected references

  • D. P. Bertsekas, Monotone Mappings with Application in Dynamic Programming, SIAM J. Control Optim. 15(3), 438–464, 1977. https://doi.org/10.1137/0315031
  • R. E. Strauch, Negative Dynamic Programming, Ann. Math. Statist. 37(4), 871–890, 1966. https://doi.org/10.1214/aoms/1177699369
  • D. P. Bertsekas and S. E. Shreve, Stochastic Optimal Control: The Discrete-Time Case, Academic Press, 1978. http://web.mit.edu/dimitrib/www/soc.html
  • D. P. Bertsekas, Abstract Dynamic Programming, 3rd ed., Athena Scientific, 2022. http://web.mit.edu/dimitrib/www/abstractdp.html
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Convex OptimizationLinear OptimizationOptimization·Captain: mikedeng1

On Polyhedral Approximations of the Second-Order Cone I: A Compact Polyhedral Approximation of the Lorentz ConeResearch Paper

Motivation

Conic quadratic programs (second-order cone programs) minimize a linear objective subject to linear constraints and constraints of the form ∥Aℓx−bℓ∥2≤cℓTx−dℓ\|A_\ell x-b_\ell\|_2\le c_\ell^Tx-d_\ell∥Aℓ​x−bℓ​∥2​≤cℓT​x−dℓ​. They model robust linear programs with ellipsoidal uncertainty, truss topology design, contact problems with Coulomb friction, and convex quadratically constrained quadratic programs. In theory they are no harder than linear programs of the same size; in practice, linear programming software handles far larger instances than conic quadratic solvers did at the time of writing (Ben-Tal & Nemirovski 2001, pp. 193–195). This raises a question about geometry rather than algorithms: can a second-order cone be replaced by a polyhedral cone of moderate size without losing much accuracy?

The obvious answer — circumscribe the cone by a polyhedral cone with many facets — fails: the number of facets must grow exponentially in the dimension, even for constant accuracy. Ben-Tal and Nemirovski showed that auxiliary variables change the picture completely: a projection of a polyhedral cone can approximate the Lorentz cone with size only O(kln⁡(1/ε))O(k\ln(1/\varepsilon))O(kln(1/ε)). The construction is now standard; it underlies, for instance, the lifted linear-programming branch-and-bound algorithm for mixed-integer conic quadratic programs of Vielma, Ahmed & Nemhauser 2008.

Setting

For y∈Rky\in\mathbb R^ky∈Rk let ∥y∥2=y12+⋯+yk2\|y\|_2=\sqrt{y_1^2+\dots+y_k^2}∥y∥2​=y12​+⋯+yk2​​. The (k+1)(k+1)(k+1)-dimensional Lorentz cone is

Lk={(y,t)∈Rk×R∣t≥∥y∥2}.L^k=\{(y,t)\in\mathbb R^k\times\mathbb R\mid t\ge\|y\|_2\}.Lk={(y,t)∈Rk×R∣t≥∥y∥2​}.

Fix ε>0\varepsilon>0ε>0. A polyhedral ε\varepsilonε-approximation of LkL^kLk is a linear map

Π(y,t,u):Rk×R×Rp→Rq\Pi(y,t,u):\mathbb R^k\times\mathbb R\times\mathbb R^{p}\to\mathbb R^{q}Π(y,t,u):Rk×R×Rp→Rq

such that

  1. if (y,t)∈Lk(y,t)\in L^k(y,t)∈Lk, there is u∈Rpu\in\mathbb R^pu∈Rp with Π(y,t,u)≥0\Pi(y,t,u)\ge0Π(y,t,u)≥0 (componentwise);
  2. if Π(y,t,u)≥0\Pi(y,t,u)\ge0Π(y,t,u)≥0 for some uuu, then ∥y∥2≤(1+ε)t\|y\|_2\le(1+\varepsilon)t∥y∥2​≤(1+ε)t.

Equivalently, the polyhedral cone {(y,t,u)∣Π(y,t,u)≥0}\{(y,t,u)\mid\Pi(y,t,u)\ge0\}{(y,t,u)∣Π(y,t,u)≥0} projects onto a cone lying between LkL^kLk and its (1+ε)(1+\varepsilon)(1+ε)-extension. The size of the approximation is p+qp+qp+q: the number of auxiliary variables plus the number of linear inequalities (an equation counts as two).

The construction in the paper uses a tower of variables: for k=2θk=2^\thetak=2θ, the coordinates y1,…,yky_1,\dots,y_ky1​,…,yk​ form generation 000, each consecutive pair of generation ℓ−1\ell-1ℓ−1 has a successor in generation ℓ\ellℓ (yiℓy_i^\ellyiℓ​ has parents y2i−1ℓ−1,y2iℓ−1y_{2i-1}^{\ell-1},y_{2i}^{\ell-1}y2i−1ℓ−1​,y2iℓ−1​), and the single variable of generation θ\thetaθ is ttt. It also uses an explicit linear system (8) in variables ξj,ηj\xi^j,\eta^jξj,ηj, j=0,…,νj=0,\dots,\nuj=0,…,ν, with trigonometric coefficients cos⁡(π/2j+1)\cos(\pi/2^{j+1})cos(π/2j+1), sin⁡(π/2j+1)\sin(\pi/2^{j+1})sin(π/2j+1), tan⁡(π/2ν+1)\tan(\pi/2^{\nu+1})tan(π/2ν+1), whose accuracy is δ(ν)=1/cos⁡(π/2ν+1)−1\delta(\nu)=1/\cos(\pi/2^{\nu+1})-1δ(ν)=1/cos(π/2ν+1)−1.

Formalization targets

Goal: Theorem 1.1

There is an absolute constant CCC such that for every positive integer kkk and every ε∈(0,1]\varepsilon\in(0,1]ε∈(0,1], LkL^kLk admits a polyhedral ε\varepsilonε-approximation with

pk+qk≤C kln⁡2ε.p_k+q_k\le C\,k\ln\frac{2}{\varepsilon}.pk​+qk​≤Cklnε2​.

The constant is not fixed; the goal asserts only the order of growth, which is what the paper claims.

Milestones

  1. §2, Eq. (5). For k=2θk=2^\thetak=2θ, θ≥1\theta\ge1θ≥1: (y,t)(y,t)(y,t) extends to a tower solving [y2i−1ℓ−1]2+[y2iℓ−1]2≤yiℓ\sqrt{[y_{2i-1}^{\ell-1}]^2+[y_{2i}^{\ell-1}]^2}\le y_i^\ell[y2i−1ℓ−1​]2+[y2iℓ−1​]2​≤yiℓ​ for all i,ℓi,\elli,ℓ if and only if ∥y∥2≤t\|y\|_2\le t∥y∥2​≤t.
  2. §2, Eqs. (6)–(7). Placing polyhedral εℓ\varepsilon_\ellεℓ​-approximations of L2L^2L2 on every level of the tower yields a polyhedral approximation of LkL^kLk with 1+ε=∏ℓ=1θ(1+εℓ)1+\varepsilon=\prod_{\ell=1}^\theta(1+\varepsilon_\ell)1+ε=∏ℓ=1θ​(1+εℓ​).
  3. Proposition 2.1 (i), (ii) and Eq. (9). System (8) is a polyhedral δ(ν)\delta(\nu)δ(ν)-approximation of L2L^2L2, and δ(ν)=O(4−ν)\delta(\nu)=O(4^{-\nu})δ(ν)=O(4−ν).
  4. Proof of Theorem 1.1, system (10), property 3. System (8) with parameter νℓ\nu_\ellνℓ​ on level ℓ\ellℓ of the tower approximates L2θL^{2^\theta}L2θ with quality β=∏ℓ=1θ1/cos⁡(π/2νℓ+1)−1\beta=\prod_{\ell=1}^\theta 1/\cos(\pi/2^{\nu_\ell+1})-1β=∏ℓ=1θ​1/cos(π/2νℓ​+1)−1.
  5. Proof of Theorem 1.1, choice of νℓ\nu_\ellνℓ​. With νℓ=⌊c ℓln⁡(2/ε)⌋\nu_\ell=\lfloor c\,\ell\ln(2/\varepsilon)\rfloorνℓ​=⌊cℓln(2/ε)⌋: β≤ε\beta\le\varepsilonβ≤ε and ∑ℓ2θ−ℓνℓ≤C 2θln⁡(2/ε)\sum_\ell 2^{\theta-\ell}\nu_\ell\le C\,2^\theta\ln(2/\varepsilon)∑ℓ​2θ−ℓνℓ​≤C2θln(2/ε).

Significance

The theorem shows that conic quadratic constraints are, up to a factor logarithmic in the accuracy, no more expensive to express as linear constraints than they are in their native form. Consequences listed in the paper include approximating convex quadratically constrained quadratic programs, robust counterparts of linear programs with ellipsoidal uncertainty, and problems with low-dimensional cones (Coulomb friction, k≤3k\le3k≤3; truss design, k≤2k\le2k≤2) by linear programs of comparable size. Together with the matching lower bound of §3 of the same paper (a separate mission of this series), it pins down the size of the best polyhedral approximation up to constants. The recursive halving of dimensions through the tower of 3-dimensional cones is a reusable device for other rotation-invariant cones.

The result is proved in the paper; as far as is known it has not been machine-checked. This mission produces a formal proof of the construction, including the trigonometric estimate δ(ν)=O(4−ν)\delta(\nu)=O(4^{-\nu})δ(ν)=O(4−ν) and the explicit linear encoding with its size count. Explicit values of the absolute constants are welcome as additional results.

Difficulty

The planar estimate is the core. Part (ii) of Proposition 2.1 must hold for every solution of the inequality system (8), not only for the solution one would write down for a given point of L2L^2L2; an argument that tracks only the intended solution proves part (i) and nothing about part (ii). The accuracy must also come out as 1/cos⁡(π/2ν+1)−11/\cos(\pi/2^{\nu+1})-11/cos(π/2ν+1)−1, geometric in ν\nuν; a bound that decays only polynomially in ν\nuν would give size poly(1/ε)\mathrm{poly}(1/\varepsilon)poly(1/ε) instead of ln⁡(1/ε)\ln(1/\varepsilon)ln(1/ε). The naive idea of approximating LkL^kLk directly by tangent hyperplanes is ruled out by the exponential facet count mentioned above; the auxiliary variables are indispensable. The second difficulty is bookkeeping: packaging k−1k-1k−1 copies of system (8) on a tower of depth θ=log⁡2k\theta=\log_2 kθ=log2​k into a single linear map, counting its variables and inequalities exactly, handling kkk that is not a power of two, and summing the accuracies so that the total size is O(kln⁡(2/ε))O(k\ln(2/\varepsilon))O(kln(2/ε)) rather than O(kln⁡kln⁡(1/ε))O(k\ln k\ln(1/\varepsilon))O(klnkln(1/ε)).

Formalization scope

  • Vectors of Rk\mathbb R^kRk are Fin k → ℝ. The norm ∥y∥2\|y\|_2∥y∥2​ is written out as eucNorm y = Real.sqrt (∑ i, y i ^ 2); the norm Mathlib attaches to Fin k → ℝ is the sup norm, under which the cone would be polyhedral and the theorem trivial.
  • A polyhedral approximation is an R\mathbb RR-linear map (Fin k → ℝ) × ℝ × (Fin p → ℝ) →ₗ[ℝ] (Fin q → ℝ) and ≥0\ge0≥0 is the componentwise order. Linearity is essential: with an arbitrary map, Π(y,t)=t−∥y∥2\Pi(y,t)=t-\|y\|_2Π(y,t)=t−∥y∥2​ would be an exact approximation with p=0p=0p=0, q=1q=1q=1. Affine maps are not allowed either; the paper's approximations are homogeneous.
  • The paper's absolute constants O(1)O(1)O(1) are existential constants quantified before kkk, ε\varepsilonε and θ\thetaθ. The goal requires k≥1k\ge1k≥1 and ε∈(0,1]\varepsilon\in(0,1]ε∈(0,1], as in the paper; ln⁡\lnln is Real.log.
  • System (8) and system (10) are stated as propositions with the absolute values written out; their parameters ν\nuν, νℓ\nu_\ellνℓ​ are required to be positive integers, as in the paper (at ν=0\nu=0ν=0 the coefficient tan⁡(π/2)\tan(\pi/2)tan(π/2) would be evaluated as 000 by Lean).
  • Tower variables are indexed Y ℓ i with 0-based i, so the parents of Y ℓ i are Y (ℓ-1) (2i) and Y (ℓ-1) (2i+1); the milestones on (6)–(7) and (10) are stated on solution sets rather than on an explicit linear map. The size counts of (10) (properties 1–2) are not separate milestones; the arithmetic milestone on νℓ\nu_\ellνℓ​ records the bound on ∑ℓ2θ−ℓνℓ\sum_\ell 2^{\theta-\ell}\nu_\ell∑ℓ​2θ−ℓνℓ​ to which they reduce.
  • δ(ν)=O(1/4ν)\delta(\nu)=O(1/4^\nu)δ(ν)=O(1/4ν) is stated as ∃C>0, ∀ν≥1, δ(ν)≤C/4ν\exists C>0,\ \forall\nu\ge1,\ \delta(\nu)\le C/4^\nu∃C>0, ∀ν≥1, δ(ν)≤C/4ν.

A complete development needs: elementary trigonometry of π/2j\pi/2^{j}π/2j (available in Mathlib), rotations in the plane, finite products and sums over {1,…,θ}\{1,\dots,\theta\}{1,…,θ}, and a way to assemble many small linear systems into one linear map with an exact count of rows and columns. The last piece, and the tower of variables with the reduction from arbitrary kkk to a power of two, are reusable for other lifted polyhedral approximations. Contributions of any milestone, of explicit linear encodings of (8) and (10), and of the extension from k=2θk=2^\thetak=2θ to all kkk are welcome.

Selected references

  • A. Ben-Tal and A. Nemirovski, On Polyhedral Approximations of the Second-Order Cone, Mathematics of Operations Research 26(2):193–205, 2001. https://doi.org/10.1287/moor.26.2.193.10561
  • J. P. Vielma, S. Ahmed and G. L. Nemhauser, A lifted linear programming branch-and-bound algorithm for mixed-integer conic quadratic programs, INFORMS Journal on Computing 20(3):438–450, 2008. https://doi.org/10.1287/ijoc.1070.0256
  • A. Ben-Tal and A. Nemirovski, Robust convex optimization, Mathematics of Operations Research 23(4):769–805, 1998. https://doi.org/10.1287/moor.23.4.769
  • A. Ben-Tal and A. Nemirovski, Lectures on Modern Convex Optimization, SIAM, 2001. https://doi.org/10.1137/1.9780898718829
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Convex OptimizationOptimization·Captain: mikedeng1

On Minimizing a Convex Function Subject to Linear Inequalities I: Beale's Simplex Method for a Convex Quadratic Function TerminatesResearch Paper

Motivation

Quadratic programming, the minimization of a convex quadratic function subject to linear constraints, is the simplest nonlinear extension of linear programming. It arises in least-squares estimation with sign constraints, in portfolio selection, and as the subproblem solved at each iteration of Newton-type methods for general smooth convex programs. E. M. L. Beale's 1955 paper (DOI 10.1111/j.2517-6161.1955.tb00191.x) gave one of the first finite algorithms for it by extending Dantzig's simplex method: the method keeps the simplex tableau and adds free variables, linear functions of the original variables with no sign restriction, along which the quadratic stops decreasing.

Timeline:

  • 1951: Dantzig publishes the simplex method for linear programming.
  • 1952: Charnes introduces ε-perturbations to resolve degeneracy in the simplex method.
  • 1955: Beale extends the simplex method to convex quadratic objectives and proves that the iteration terminates (§3 of the paper; the result formalized here).
  • 1959: Beale's "On quadratic programming" (Naval Research Logistics Quarterly 6) develops the method further; Wolfe's simplex method for quadratic programming (Econometrica 27) appears the same year.

Setting

There are nnn restricted variables xj≥0x_j \ge 0xj​≥0 satisfying mmm linearly independent linear equations, and a convex quadratic objective CCC. The iteration keeps N=n−mN = n - mN=n−m nonbasic variables z1,…,zNz_1, \dots, z_Nz1​,…,zN​, each either a restricted variable or a free variable, and writes every restricted variable as an affine function of them:

xh=ah0+∑l=1Nahlzl.(2.3)x_h = a_{h0} + \sum_{l=1}^{N} a_{hl} z_l. \qquad (2.3)xh​=ah0​+l=1∑N​ahl​zl​.(2.3)

A restricted variable that is not nonbasic is basic. The associated solution sets every zl=0z_l = 0zl​=0, so xh=ah0x_h = a_{h0}xh​=ah0​. The objective is written as

C=∑k=0N∑l=0Ncklzkzl,z0=1,(3.1)C = \sum_{k=0}^{N} \sum_{l=0}^{N} c_{kl} z_k z_l, \qquad z_0 = 1, \qquad (3.1)C=k=0∑N​l=0∑N​ckl​zk​zl​,z0​=1,(3.1)

with (ckl)(c_{kl})(ckl​) symmetric. Thus c00c_{00}c00​ is the value of CCC at the associated solution and 2ck02c_{k0}2ck0​ is its linear coefficient in zkz_kzk​. The number of nonbasic free variables is sss.

One step chooses a nonbasic zpz_pzp​ that can profitably be altered: a free one with cp0≠0c_{p0} \ne 0cp0​=0 if there is one, otherwise a restricted one with cp0<0c_{p0} < 0cp0​<0. It orients zpz_pzp​ so that it is to be increased, and increases it from 000. It stops at the first of two events. Either a basic variable xqx_qxq​ reaches 000 (the ratio test (2.4)), and then xqx_qxq​ becomes nonbasic in place of zpz_pzp​. Or CCC stops decreasing where the free variable ur=cp0+∑lcplzlu_r = c_{p0} + \sum_l c_{pl} z_lur​=cp0​+∑l​cpl​zl​ vanishes (3.2), and then uru_rur​ becomes nonbasic in place of zpz_pzp​. The coefficients are then transformed by substituting for zpz_pzp​ (eqs. (3.4)–(3.6)). CCC is in standard form when it has no linear term in any free variable.

Formalization targets

Goal: the iteration terminates

From a tableau with symmetric (ckl)(c_{kl})(ckl​), positive semidefinite quadratic block (ckl)k,l≥1(c_{kl})_{k,l \ge 1}(ckl​)k,l≥1​ and consistent labels, there is no infinite run

T0→T1→T2→⋯T_0 \to T_1 \to T_2 \to \cdotsT0​→T1​→T2​→⋯

of steps along which every basic variable stays strictly positive in the associated solution. No bound on the number of steps is claimed, as in the paper.

Milestones

  1. Eq. (3.7): the closed form of the transformed matrix, its symmetry, and the invariance ∑cklzkzl=∑ckl′′zk′zl′\sum c_{kl} z_k z_l = \sum c''_{kl} z'_k z'_l∑ckl​zk​zl​=∑ckl′′​zk′​zl′​.
  2. Lemma 1: when a free variable enters, its row and column vanish off the diagonal, the index 000 included.
  3. Lemma 2: a slot whose row and column vanish off the diagonal keeps this property when another free variable enters.
  4. The optimality criterion (p. 175): if no nonbasic variable can profitably be altered and CCC is convex, then c00c_{00}c00​ is the minimum over the feasible region.
  5. In standard form, c00≤C(z)c_{00} \le C(z)c00​≤C(z) for every zzz with the restricted nonbasic variables at 000.
  6. CCC decreases at every step: c00′<c00c'_{00} < c_{00}c00′​<c00​.
  7. A finite run never returns to a standard form with the same set of restricted nonbasic variables.
  8. If CCC is not in standard form and s=s0s = s_0s=s0​, then within s0s_0s0​ steps either standard form is reached or sss drops, and sss never exceeds s0s_0s0​ on the way.

Significance

The theorem makes Beale's method an algorithm: a finite procedure that ends either at an optimal tableau (milestone 4) or with a ray along which CCC decreases without bound. This finiteness is what later active-set methods for quadratic programming inherit.

The result was proved in 1955. What remains is to formalize it: a machine-checked account of a simplex-type method whose state includes variables that are created during the run and later discarded. Mathlib has no simplex-type algorithm for quadratic programming, and no machine-checked proof of this theorem is known. The pivot algebra (3.4)–(3.7) and the tableau model are reusable for other pivoting methods for quadratic programs.

Difficulty

The argument for linear programming does not carry over. There, the objective strictly decreases and a basis is a subset of a finite set of columns, so no basis repeats. Here each step may create a new free variable, and nothing bounds the number of distinct free variables that can occur. Tableaux are therefore not drawn from a finite set, and a strictly decreasing objective alone does not give termination. The paper states this itself: "there is no obvious limit to the number of free variables that may be involved". The difficulty is to bound the number of steps between returns to a well-behaved tableau, and this depends both on the rule that free variables are chosen first and on how the coefficient matrix evolves under repeated pivots.

Formalization scope

  • Representation. The nonbasic variables occupy fixed slots Fin (N+1). Slot 0 is z0=1z_0 = 1z0​=1; the nonbasic slot k : Fin N is index k.succ. A pivot stores the new nonbasic variable in the slot of the variable it replaces, so the paper's index qqq in (3.4)–(3.7) is that slot. The tableau holds the labels (restricted xjx_jxj​ or free), the rows of all nnn restricted variables (a nonbasic one has the unit row), and (ckl)(c_{kl})(ckl​). Free variables carry no row, as in the paper.
  • The pivot. pivotC is computed literally from (3.5) and then (3.6). Rows are transformed by the same substitution, as the paper states.
  • The step. The step is a relation. It allows any profitable choice of zpz_pzp​ subject to the free-first rule, and at a tie either outcome. No pricing rule is fixed, since the paper fixes none.
  • Convexity. Convexity of CCC is the symmetry of (ckl)(c_{kl})(ckl​) plus positive semidefiniteness of the block (ckl)k,l≥1(c_{kl})_{k,l \ge 1}(ckl​)k,l≥1​, assumed on the initial tableau.
  • Added hypothesis. The one hypothesis not on the page is that every basic restricted variable is strictly positive in the associated solution of every tableau of the run. It replaces Charnes's ε-perturbations, by which the paper ensures "the ah0a_{h0}ah0​ are always positive, and not zero". Positivity is required of basic variables only; nonbasic variables are 000 in the associated solution.
  • Out of scope. The link to the original equations (2.1) and phase 1 (artificial variables, the M-method) are not formalized: the iteration starts from a tableau already in the form (2.3).
  • Ruling out a trivial goal. A step relation that never fires, or a positivity hypothesis that no tableau can meet after a step, would make the goal trivially true. A sorry-free check exhibits a convex instance with consistent labels, a step, and positive basic variables before and after it.

Contributions are welcome on every milestone. The algebraic milestones 1–3 are self-contained.

Selected references

  • E. M. L. Beale, On Minimizing a Convex Function Subject to Linear Inequalities, Journal of the Royal Statistical Society, Series B 17(2):173–184, 1955. https://doi.org/10.1111/j.2517-6161.1955.tb00191.x
  • A. Charnes, Optimality and Degeneracy in Linear Programming, Econometrica 20(2):160–170, 1952. https://doi.org/10.2307/1907845
  • G. B. Dantzig, Maximization of a Linear Function of Variables Subject to Linear Inequalities, in T. C. Koopmans (ed.), Activity Analysis of Production and Allocation, Wiley, 1951, pp. 339–347.
  • E. M. L. Beale, On Quadratic Programming, Naval Research Logistics Quarterly 6(3):227–243, 1959. https://doi.org/10.1002/nav.3800060305
  • P. Wolfe, The Simplex Method for Quadratic Programming, Econometrica 27(3):382–398, 1959. https://doi.org/10.2307/1909468
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Algorithmic Game TheoryProbability·Captain: mikedeng1

Subjectivity and Correlation in Randomized Strategies I: Subjective Mixed Equilibria of Two-Person Games Have Objective PayoffsResearch Paper

Motivation

Classical non-cooperative game theory randomizes with objective, independent devices: each player spins a private wheel whose odds everyone agrees on. Aumann's 1974 paper (doi:10.1016/0304-4068(74)90037-8) asks what changes when the randomizing events are ordinary events of the world, about which players may hold different subjective probabilities and may be differently informed. The paper introduced correlated equilibrium, and it also separates two effects that the classical model fuses: subjectivity (players disagree about probabilities) and correlation (players peg their choices on common or dependent events).

This mission formalizes the paper's result on subjectivity without correlation. Example 2.3 of the paper exhibits a three-person game in which strategies pegged on subjective but mutually secret events form an equilibrium that every player prefers to every classical mixed equilibrium. Proposition 5.1 shows that this cannot happen with two players.

Setting

A game has a finite set N={1,…,n}N=\{1,\dots,n\}N={1,…,n} of players, a finite set SiS_iSi​ of pure strategies for each player, a finite set XXX of outcomes and an outcome function ggg from S=×i∈NSiS=\times_{i\in N}S_iS=×i∈N​Si​ onto XXX. Player iii has a utility ui:X→Ru_i:X\to\mathbb Rui​:X→R; write hi(a)=ui(g(a))h_i(a)=u_i(g(a))hi​(a)=ui​(g(a)) for a∈Sa\in Sa∈S.

A randomizing structure consists of a set Ω\OmegaΩ of states of the world with a σ\sigmaσ-field B\mathcal BB of events, a sub-σ\sigmaσ-field Ji⊆B\mathcal J_i\subseteq\mathcal BJi​⊆B for each player (the events iii is informed about), and a probability measure pip_ipi​ on B\mathcal BB for each player (the subjective probability of iii). A strategy of iii is a map si:Ω→Sis_i:\Omega\to S_isi​:Ω→Si​ whose level sets {si=a}\{s_i=a\}{si​=a} lie in Ji\mathcal J_iJi​. For a profile s=(s1,…,sn)s=(s_1,\dots,s_n)s=(s1​,…,sn​) of strategies the payoff of iii is

Hi(s)=∫Ωhi(s(ω)) dpi(ω),H_i(s)=\int_\Omega h_i\big(s(\omega)\big)\,dp_i(\omega),Hi​(s)=∫Ω​hi​(s(ω))dpi​(ω),

computed under player iii's own beliefs. An equilibrium point is a profile sss with Hi(s)≥Hi(s1,…,ti,…,sn)H_i(s)\ge H_i(s_1,\dots,t_i,\dots,s_n)Hi​(s)≥Hi​(s1​,…,ti​,…,sn​) for every player iii and every strategy tit_iti​ of iii.

An event AAA is iii-secret if A∈JiA\in\mathcal J_iA∈Ji​ and every other player jjj regards AAA as independent of every event in the σ\sigmaσ-field generated by the Jk\mathcal J_kJk​, k≠ik\ne ik=i: pj(A∩B)=pj(A)pj(B)p_j(A\cap B)=p_j(A)p_j(B)pj​(A∩B)=pj​(A)pj​(B). A strategy is mixed if its level sets are iii-secret, and objective if each level set has the same probability under every pjp_jpj​. A measure is non-atomic on a σ\sigmaσ-field R\mathcal RR if every event of R\mathcal RR of positive measure contains an event of R\mathcal RR of strictly smaller positive measure; a roulette is a sub-σ\sigmaσ-field of B\mathcal BB on which every pjp_jpj​ is non-atomic. Throughout, Assumption II holds: every player iii has a σ\sigmaσ-field Ri\mathcal R_iRi​ of iii-secret events on which every pjp_jpj​ is non-atomic.

For distributions σi\sigma_iσi​ on SiS_iSi​ the classical payoff is Fi(σ)=∑a∈Shi(a)∏jσj(aj)F_i(\sigma)=\sum_{a\in S}h_i(a)\prod_j\sigma_j(a_j)Fi​(σ)=∑a∈S​hi​(a)∏j​σj​(aj​), and σ\sigmaσ is a Nash equilibrium point if no player gains by switching to another distribution.

Formalization targets

Goal: Proposition 5.1 (p. 78)

Let n=2n=2n=2 and assume

p1(B)=0  ⟺  p2(B)=0for every B∈B.(5.2)p_1(B)=0\iff p_2(B)=0\qquad\text{for every }B\in\mathcal B.\tag{5.2}p1​(B)=0⟺p2​(B)=0for every B∈B.(5.2)

Then for every equilibrium point sss in mixed strategies there is an equilibrium point ttt in objective mixed strategies with

H(s)=H(t).H(s)=H(t).H(s)=H(t).

The game need not be zero-sum.

Milestones

  1. Lemma 7.1 (p. 81): in a roulette R\mathcal RR, for events B1,…,BlB^1,\dots,B^lB1,…,Bl and α∈[0,1]\alpha\in[0,1]α∈[0,1], there is an objective A∈RA\in\mathcal RA∈R with pi(A)=αp_i(A)=\alphapi​(A)=α and pi(A∩Bk)=pi(A)pi(Bk)p_i(A\cap B^k)=p_i(A)p_i(B^k)pi​(A∩Bk)=pi​(A)pi​(Bk) for all i,ki,ki,k.
  2. Lemma 4.1 (p. 77): every distribution σi\sigma_iσi​ on SiS_iSi​ is realised by an objective mixed strategy sis_isi​ with p{si=a}=σi(a)p\{s_i=a\}=\sigma_i(a)p{si​=a}=σi​(a).
  3. Lemma 7.3 (p. 82): if every sjs_jsj​, j≠ij\ne ij=i, is mixed, then pi{s=a}=pi{si=ai} pi{sj=aj ∀j≠i}=∏jpi{sj=aj}p_i\{s=a\}=p_i\{s_i=a_i\}\,p_i\{s_j=a_j\ \forall j\ne i\}=\prod_j p_i\{s_j=a_j\}pi​{s=a}=pi​{si​=ai​}pi​{sj​=aj​ ∀j=i}=∏j​pi​{sj​=aj​}.
  4. Corollary 7.4 (p. 83): mixed strategies are independent under every pkp_kpk​.
  5. Proposition 4.3 (p. 77): {F(σ):σ Nash}={H(s):s an equilibrium point in objective mixed strategies}\{F(\sigma):\sigma\text{ Nash}\}=\{H(s): s\text{ an equilibrium point in objective mixed strategies}\}{F(σ):σ Nash}={H(s):s an equilibrium point in objective mixed strategies}.

Significance

The result. Proposition 5.1 isolates correlation as the source of the new equilibrium payoffs of the subjective model in two-person games: disagreement about probabilities alone, with strategies pegged on secret events, reproduces only payoffs already achievable by classical mixed strategies (by Proposition 4.3, only Nash equilibrium payoffs). The paper uses it to explain Example 2.9, where two zero-sum players both expect more than the value, as an effect of subjectivity combined with correlation. Proposition 4.3 is the bridge that embeds classical Nash theory in the subjective model; with Nash's theorem it gives existence of equilibrium points in every game.

Formalizing it. The results are proved in the paper; to our knowledge none of them has been machine-checked. The mission produces a reusable measure-theoretic model of randomized strategies with private information and subjective beliefs (secret events, mixed and objective strategies, roulettes), a non-atomicity notion relative to a sub-σ\sigmaσ-field, and the Lyapunov-type construction of Lemma 7.1, none of which exists in Mathlib at the pinned revision.

Difficulty

The equilibrium conditions quantify over all strategies of the deviator, i.e. all Ji\mathcal J_iJi​-measurable maps, and the deviator may know events on which the opponent's mixed strategy is pegged. The obvious computation of H1(t1,s2)H_1(t_1,s_2)H1​(t1​,s2​) as a sum of products of marginal probabilities is valid only because the opponent's strategy is pegged on secret events, which is the content of Lemma 7.3; for correlated strategies it fails, and Example 2.9 shows the proposition then fails. A second obstacle is that the replacement t1t_1t1​ must reproduce player 2's beliefs about s1s_1s1​, while player 1's own equilibrium condition is stated under p1p_1p1​; condition (5.2) is what transfers "aaa is played with positive probability" from one player's beliefs to the other's. Constructing objective strategies with prescribed probabilities (Lemmas 7.1 and 4.1) needs the convexity of the range of a non-atomic vector measure (Lyapunov's theorem), which is not in Mathlib.

Formalization scope

Players are a finite type (Fin 2 in the goal, players 1,2↦0,11,2\mapsto 0,11,2↦0,1); the SiS_iSi​ and XXX are finite types, and ggg is surjective. The σ\sigmaσ-field B\mathcal BB is an explicit parameter mΩ of the structure RandomizingStructure ι Ω mΩ, which carries the Ji\mathcal J_iJi​ and the probability measures pip_ipi​. Probabilities are [0,∞][0,\infty][0,∞]-valued Mathlib measures. Utilities and pip_ipi​ are data (Assumption I is used only to compare lotteries by expected utility; the uniqueness of pip_ipi​ is not encoded). HiH_iHi​ is a Bochner integral; for strategy profiles the integrand has finitely many values and is measurable, hence integrable. Non-atomicity on a sub-σ\sigmaσ-field is defined directly; Mathlib's NoAtoms (singletons are null) would trivialize Assumption II and is not used. "Mixed" means pegged on the family of all iii-secret events, not on the σ\sigmaσ-field Ri\mathcal R_iRi​ of Assumption II. Classical distributions, FiF_iFi​ and Nash equilibrium points are AGT.IsLottery, AGT.expectedPayoff and AGT.IsMixedNash from the published definition agt_games.

A formalization that restricted deviations to mixed or objective strategies, or dropped "mixed" from the hypothesis on sss, would state a different theorem and is ruled out.

Useful contributions: Lyapunov's convexity theorem for finite-dimensional non-atomic vector measures (or the special case needed for Lemma 7.1), the factorization of Lemma 7.3, and the payoff identities used in the proof of Proposition 4.3. The model definitions are shared in meaning with the companion mission on two-person zero-sum games.

Selected references

  • R. J. Aumann, Subjectivity and Correlation in Randomized Strategies, Journal of Mathematical Economics 1 (1974) 67–96. https://doi.org/10.1016/0304-4068(74)90037-8
  • J. Nash, Non-Cooperative Games, Annals of Mathematics 54 (1951) 286–295. https://doi.org/10.2307/1969529
  • A. Liapounoff, Sur les fonctions-vecteurs complètement additives, Izv. Akad. Nauk SSSR Ser. Mat. 4 (1940) 465–478.
  • L. J. Savage, The Foundations of Statistics, Wiley, 1954.
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OptimizationProbability·Captain: mikedeng1

On Properties of Stochastic Inventory Systems III: Bounds between the Optimal Costs of the Stochastic (Q, r) Model and the EOQ ModelResearch Paper

Motivation

The continuous-review (Q,r)(Q, r)(Q,r) policy — order a fixed quantity QQQ whenever the inventory position falls to the reorder point rrr — is the textbook policy for a single item with random demand and a positive replenishment leadtime (Hadley and Whitin 1963). Its optimal parameters have no closed form, so practice routinely falls back on the deterministic economic order quantity (EOQ) model with backorders, whose optimum is explicit. How much the deterministic model misjudges the stochastic system's cost is therefore a practical question, and before Zheng (1992) it had been studied only numerically (Wagner, O'Hagan and Lundh 1965; Naddor 1975; Archibald and Silver 1978).

Zheng's paper answers it analytically. This mission targets its Theorem 3, which brackets the optimal cost of the stochastic model by the optimal cost of the EOQ model with the same parameters.

Setting

Demands arrive at rate λ>0\lambda>0λ>0 and orders arrive after a fixed leadtime L>0L>0L>0. Each order costs K>0K>0K>0; holding and backorder costs accrue at rates h>0h>0h>0 and p>0p>0p>0 per unit per unit time. The leadtime demand DDD is a nonnegative random variable with E(D)=λLE(D)=\lambda LE(D)=λL. The inventory cost rate at inventory position yyy is the newsvendor cost

G(y)=E[h(y−D)++p(D−y)+],G(y)=E\big[h(y-D)^+ + p(D-y)^+\big],G(y)=E[h(y−D)++p(D−y)+],

assumed to attain its minimum at a unique point y0y^0y0.

For order quantity Q>0Q>0Q>0 and reorder point rrr, the long-run average cost is

c(Q,r)=λK+∫rr+QG(y) dyQ.c(Q,r)=\frac{\lambda K+\int_r^{r+Q}G(y)\,dy}{Q}.c(Q,r)=QλK+∫rr+Q​G(y)dy​.

Let r(Q)r(Q)r(Q) be a reorder point minimizing c(Q,⋅)c(Q,\cdot)c(Q,⋅), and define H(Q)=G(r(Q))H(Q)=G(r(Q))H(Q)=G(r(Q)) for Q>0Q>0Q>0, H(0)=G(y0)H(0)=G(y^0)H(0)=G(y0), and C(Q)=c(Q,r(Q))C(Q)=c(Q,r(Q))C(Q)=c(Q,r(Q)). The optimal order quantity Q∗Q^*Q∗ minimizes CCC over Q>0Q>0Q>0, and C∗=C(Q∗)C^*=C(Q^*)C∗=C(Q∗). Write H0(Q)=H(Q)−G(y0)H_0(Q)=H(Q)-G(y^0)H0​(Q)=H(Q)−G(y0) and

C0(Q)=λK+∫0QH0(y) dyQ,C_0(Q)=\frac{\lambda K+\int_0^Q H_0(y)\,dy}{Q},C0​(Q)=QλK+∫0Q​H0​(y)dy​,

the controllable cost, so that C(Q)=G(y0)+C0(Q)C(Q)=G(y^0)+C_0(Q)C(Q)=G(y0)+C0​(Q); C0∗=C0(Q∗)C^*_0=C_0(Q^*)C0∗​=C0​(Q∗). The constant G(y0)G(y^0)G(y0) is the newsboy cost.

The EOQ model is the same construction with demand constant at λL\lambda LλL: Gd(y)=h(y−λL)++p(λL−y)+G_d(y)=h(y-\lambda L)^+ + p(\lambda L-y)^+Gd​(y)=h(y−λL)++p(λL−y)+, with functions HdH_dHd​, CdC_dCd​, optimal quantity Qd∗=2λK(h+p)/(hp)Q^*_d=\sqrt{2\lambda K(h+p)/(hp)}Qd∗​=2λK(h+p)/(hp)​ and optimal cost Cd∗=Cd(Qd∗)C^*_d=C_d(Q^*_d)Cd∗​=Cd​(Qd∗​).

Formalization targets

Goal: Theorem 3 (p. 97)

C0∗≤Qd∗Q∗ Cd∗,Cd∗≤C∗≤G(y0)+Qd∗Q∗ Cd∗.C^*_0\le\frac{Q^*_d}{Q^*}\,C^*_d,\qquad C^*_d\le C^*\le G(y^0)+\frac{Q^*_d}{Q^*}\,C^*_d.C0∗​≤Q∗Qd∗​​Cd∗​,Cd∗​≤C∗≤G(y0)+Q∗Qd∗​​Cd∗​.

All three inequalities are part of the goal. The weaker remark after the proof, Cd∗≤C∗≤Cd∗+G(y0)C^*_d\le C^*\le C^*_d+G(y^0)Cd∗​≤C∗≤Cd∗​+G(y0), drops the factor Qd∗/Q∗Q^*_d/Q^*Qd∗​/Q∗ and is not the goal.

Milestones

  1. Eq. (7): C(Q)=(λK+∫0QH(y) dy)/QC(Q)=\big(\lambda K+\int_0^Q H(y)\,dy\big)/QC(Q)=(λK+∫0Q​H(y)dy)/Q for Q>0Q>0Q>0.
  2. Eq. (8): Q>0Q>0Q>0 is optimal iff H(Q)=C(Q)H(Q)=C(Q)H(Q)=C(Q).
  3. Eqs. (13)–(15): C(Q)=G(y0)+C0(Q)C(Q)=G(y^0)+C_0(Q)C(Q)=G(y0)+C0​(Q), and H0(Q∗)=C0(Q∗)H_0(Q^*)=C_0(Q^*)H0​(Q∗)=C0​(Q∗).
  4. Lemma 6: A(Q)=QH(Q)−∫0QHA(Q)=QH(Q)-\int_0^QHA(Q)=QH(Q)−∫0Q​H is increasing and convex; Q=Q∗Q=Q^*Q=Q∗ iff A(Q)=λKA(Q)=\lambda KA(Q)=λK; Q∗Q^*Q∗ increases and r∗r^*r∗ decreases in KKK.
  5. Eqs. (18), (20): Hd(Q)=hph+pQH_d(Q)=\frac{hp}{h+p}QHd​(Q)=h+php​Q, and Qd∗Q^*_dQd∗​ is the EOQ optimum.
  6. Lemma 8: ∫0QH≥12QH(Q)≥A(Q)≥12QH0(Q)≥∫0QH0\int_0^QH\ge\tfrac12QH(Q)\ge A(Q)\ge\tfrac12QH_0(Q)\ge\int_0^QH_0∫0Q​H≥21​QH(Q)≥A(Q)≥21​QH0​(Q)≥∫0Q​H0​, with equalities for deterministic demand.
  7. Eq. (22): Gd(y)≤G(y)G_d(y)\le G(y)Gd​(y)≤G(y) for all yyy.

Significance

Theorem 3 says that randomness of leadtime demand raises the total optimal cost above the EOQ's, yet the controllable part of that cost — the part the order quantity actually trades off — is smaller than the EOQ's cost, scaled by Qd∗/Q∗Q^*_d/Q^*Qd∗​/Q∗. Combined with Qd∗≤Q∗Q^*_d\le Q^*Qd∗​≤Q∗ (Theorem 2 of the paper), the gap C∗−Cd∗C^*-C^*_dC∗−Cd∗​ is at most the newsboy cost G(y0)G(y^0)G(y0), independent of KKK, so the EOQ cost is a good proxy when KKK is large relative to G(y0)G(y^0)G(y0). The same machinery yields the paper's Theorem 5, that using Qd∗Q^*_dQd∗​ in the stochastic model costs at most 1/81/81/8 more than the optimum.

The result was proved in 1992; no machine-checked proof is known to exist. Formalizing it requires the continuous (Q,r)(Q,r)(Q,r) model as a whole — optimal reorder points, the one-variable reduction through HHH, and the area function AAA — none of which is in Mathlib. The companion missions of this series formalize Theorems 2, 4 and 5 of the same paper on the same model.

Difficulty

The middle inequality compares minima of two different functions: Cd≤CC_d\le CCd​≤C pointwise follows from Jensen's inequality, but only after the reorder point of each model is chosen optimally, so the comparison has to pass through the definition of CCC as a minimum over rrr. The outer inequalities depend on Lemma 8, whose proof uses convexity of HHH and a slope comparison H′≤Hd′H'\le H_d'H′≤Hd′​ (Lemmas 4 and 7). The paper argues these through first and second derivatives of r(Q)r(Q)r(Q) and GGG, which exist only when the leadtime demand has a smooth distribution; the formal statements assume no density, so a proof must either avoid derivatives or handle one-sided ones. Existence of optimal reorder points and of Q∗Q^*Q∗ is asserted in the paper without a separate argument.

Formalization scope

Everything lives in the namespace ZhengQR.CostBounds. The machinery (qrCost, reorderPt, idealPt, Hfun, Cfun, Afun, H0fun, C0fun, IsOptQty) is defined for an arbitrary G:R→RG:\mathbb R\to\mathbb RG:R→R and instantiated at the stochastic GGG and at GdG_dGd​. A structure QRModel holds the parameters, the demand distribution μ\muμ (a probability measure on R\mathbb RR) and the standing assumptions.

Conventions committed to:

  • Positivity of λ,L,K,h,p\lambda,L,K,h,pλ,L,K,h,p; D≥0D\ge0D≥0 almost surely; DDD integrable with E(D)=λLE(D)=\lambda LE(D)=λL; GGG has a unique minimizer (p. 90). No density is assumed.
  • r(Q)r(Q)r(Q) is a chosen minimizer of c(Q,⋅)c(Q,\cdot)c(Q,⋅) over R\mathbb RR, not a solution of G(r)=G(r+Q)G(r)=G(r+Q)G(r)=G(r+Q); y0y^0y0 is a chosen minimizer of GGG. Both use junk value 000 when no minimizer exists, which never happens under the assumptions.
  • H(0)=G(y0)H(0)=G(y^0)H(0)=G(y0); statements about HHH and AAA are on [0,∞)[0,\infty)[0,∞), about ccc, CCC, C0C_0C0​ for Q>0Q>0Q>0.
  • "Optimal order quantity" means Q>0Q>0Q>0 and C(Q)≤C(Q′)C(Q)\le C(Q')C(Q)≤C(Q′) for all Q′>0Q'>0Q′>0; the goal takes any such Q∗Q^*Q∗ and Lemma 6 states that exactly one exists, so the goal is not vacuous.
  • Cd∗C^*_dCd∗​ is Cd(Qd∗)C_d(Q^*_d)Cd​(Qd∗​), with Qd∗Q^*_dQd∗​ the explicit formula (20); milestone 5 proves it is the EOQ optimum. C0∗C^*_0C0∗​ is C0(Q∗)C_0(Q^*)C0​(Q∗), which equals min⁡Q>0C0\min_{Q>0}C_0minQ>0​C0​ by (13).
  • "Increasing" in Lemma 6 is read strictly, as the proof gives. Lemma 8 is stated for Q≥0Q\ge0Q≥0; "deterministic" means μ\muμ is the Dirac mass at λL\lambda LλL.

A formalization in which Cd∗C^*_dCd∗​ were an arbitrary number, or Q∗Q^*Q∗ an arbitrary positive real, would make the goal false or empty; both are tied to the model above.

Needed infrastructure: existence of minimizers of convex coercive functions on R\mathbb RR, differentiation of parametric integrals ∫r(Q)r(Q)+QG\int_{r(Q)}^{r(Q)+Q}G∫r(Q)r(Q)+Q​G, and properties of the newsvendor cost (convexity, coercivity, Jensen). Most of it is reusable for any continuous-review inventory model. Proofs of any milestone, and of lemmas the paper uses but this mission does not list (Lemmas 2–5, 7), are welcome.

Selected references

  • Y.-S. Zheng, On Properties of Stochastic Inventory Systems, Management Science 38(1):87–103, 1992. https://doi.org/10.1287/mnsc.38.1.87
  • G. Hadley and T. M. Whitin, Analysis of Inventory Systems, Prentice-Hall, 1963.
  • P. Zipkin, Inventory Service-Level Measures: Convexity and Approximation, Management Science 32(8):975–981, 1986. https://doi.org/10.1287/mnsc.32.8.975
  • A. Federgruen and Y.-S. Zheng, An Efficient Algorithm for Computing an Optimal (r, Q) Policy in Continuous Review Stochastic Inventory Systems, Operations Research 40(4):808–813, 1992. https://doi.org/10.1287/opre.40.4.808
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Algorithmic Game TheoryDynamic ProgrammingMarkov Chain·Captain: mikedeng1

Markovian Decision Processes with Uncertain Transition Probabilities I: The Max-Min Policy-Iteration Algorithm Terminates at a Max-Min Optimal Pure Stationary PolicyResearch Paper

Motivation

Howard's finite Markovian decision process (MDP) models a controller who, at each instant, observes the state of a system, chooses a decision, collects a reward and moves to a random next state with known transition probabilities. Howard's policy-iteration algorithm computes an optimal policy, and the model has been applied to inventory control, equipment replacement, quality control and marketing. Its weak point is the requirement that every transition probability be known exactly: in applications these numbers are estimated and are hard to measure.

Satia and Lave (Operations Research 21(3), 1973) relax this requirement. In their game-theoretic formulation, the controller knows only a set of admissible probability rows for every state–decision pair, and nature chooses the rows adversarially. This is the model now called a robust MDP with (s,a)-rectangular uncertainty, studied later by Iyengar (Math. Oper. Res. 2005) and Nilim and El Ghaoui (Oper. Res. 2005), who reprove and extend the dynamic-programming results for it. The paper gives a policy-iteration algorithm for the max-min criterion and proves that it terminates at an optimal policy. This mission formalizes that part of the paper (pp. 728–732).

Timeline:

  • 1953: Shapley introduces stochastic games (PNAS 39).
  • 1960: Howard, Dynamic Programming and Markov Processes, policy iteration for known transitions.
  • 1973: Satia and Lave, max-min and max-max policy iteration for uncertain transitions (dynamic-programming equations and optimality of pure stationary policies cited from Satia's 1968 Stanford thesis).
  • 2005: Iyengar; Nilim and El Ghaoui, robust dynamic programming under rectangular uncertainty.

Setting

There are finitely many states iii and, in state iii, a finite nonempty set DiD_iDi​ of decisions kkk. A transition i→ji\to ji→j under decision kkk earns reward rijkr^k_{ij}rijk​; rewards are discounted by β\betaβ with 0≤β<10\le\beta<10≤β<1. For every pair (i,k)(i,k)(i,k) there is a nonempty, closed, convex set SikS_i^kSik​ of probability rows p=(p1,…,pN)p=(p_1,\dots,p_N)p=(p1​,…,pN​), pj≥0p_j\ge0pj​≥0, ∑jpj=1\sum_j p_j=1∑j​pj​=1. Nature's choice is a matrix P∈SP\in SP∈S: one row pik∈Sikp_i^k\in S_i^kpik​∈Sik​ for every pair.

A pure stationary policy A=(A1,…,AN)A=(A_1,\dots,A_N)A=(A1​,…,AN​) selects Ai∈DiA_i\in D_iAi​∈Di​. Under PPP its present value vA(P)v^A(P)vA(P) is the unique solution of equations (5),

viA=∑jpijAi(rijAi+βvjA).v_i^A=\sum_j p^{A_i}_{ij}\big(r^{A_i}_{ij}+\beta v_j^A\big).viA​=j∑​pijAi​​(rijAi​​+βvjA​).

Nature's minimum is v‾i(A)=inf⁡P∈SviA(P)\underline v_i(A)=\inf_{P\in S}v_i^A(P)v​i​(A)=infP∈S​viA​(P), and the max-min return of criterion (2) is vˉi=max⁡Av‾i(A)\bar v_i=\max_A\underline v_i(A)vˉi​=maxA​v​i​(A). A policy is max-min optimal if v‾(A)=vˉ\underline v(A)=\bar vv​(A)=vˉ in every state.

The algorithm alternates two routines. Phase 1 (nature's policy evaluation) fixes AAA, computes vAv^AvA from the current rows, replaces each row at AiA_iAi​ by a minimizer of ∑jpj(rijAi+βvjA)\sum_j p_j(r^{A_i}_{ij}+\beta v^A_j)∑j​pj​(rijAi​​+βvjA​) over SiAiS_i^{A_i}SiAi​​ (6), and stops when the minima reproduce vAv^AvA. Phase 2 (policy improvement) chooses in each state a decision BiB_iBi​ maximizing the test quantity (7),

tik(v)=min⁡p∈Sik∑jpj(rijk+βvj),t_i^k(v)=\min_{p\in S_i^k}\sum_j p_j\big(r^k_{ij}+\beta v_j\big),tik​(v)=p∈Sik​min​j∑​pj​(rijk​+βvj​),

at v=v‾(A)v=\underline v(A)v=v​(A), keeping AiA_iAi​ on ties; if B=AB=AB=A the algorithm terminates.

Formalization targets

Goal: Proposition 5 with Proposition 3

Along every run A0,A1,…A^0,A^1,\dotsA0,A1,… of Phase 2 steps,

v‾(An)≤v‾(An+1)  ∀n,∃ n<#{policies}: An+1=An,  v‾(An)=vˉ,\underline v(A^n)\le\underline v(A^{n+1})\ \ \forall n,\qquad \exists\,n<\#\{\text{policies}\}:\ A^{n+1}=A^n,\ \ \underline v(A^n)=\bar v,v​(An)≤v​(An+1)  ∀n,∃n<#{policies}: An+1=An,  v​(An)=vˉ,

and the terminal policy attains the solution of the equations (4) and is ε\varepsilonε-optimal for every ε>0\varepsilon>0ε>0.

Milestones

  • Eq. (5): the present-value equations have a unique solution.
  • [I−βP]−1[I-\beta P]^{-1}[I−βP]−1 is nonnegative with diagonal at least 1 for stochastic PPP (proof of Proposition 5).
  • Proposition 1: equations (4), with randomized decisions and mixed choices of nature, have a unique solution, and it is the max-min return.
  • Proposition 2: a pure stationary policy attains it.
  • A non-final Phase 1 iteration lowers nature's value weakly everywhere and strictly somewhere (proof of Proposition 4).
  • Proposition 4: Phase 1 comes within ε\varepsilonε of nature's optimum after finitely many iterations.
  • Proposition 3: at termination no pure stationary policy is better.
  • Each policy change strictly improves the max-min return (proof of Proposition 5).

Significance

The goal certifies a complete algorithm for the max-min problem: it computes a policy that is optimal against the worst admissible transition probabilities, in all states at once, in finitely many improvement steps. Propositions 1 and 2 show that the dynamic-programming equations (4) characterize the max-min value and that neither side gains from randomization. The known-transition case (every SikS_i^kSik​ a single row) recovers Howard's policy iteration.

On the platform, Howard-type policy iteration for known transitions has been formalized (the Bertsekas Dynamic Programming and Optimal Control missions); nothing with uncertain transitions exists. The results of this paper are proved in the literature (Satia's thesis, and in greater generality by Iyengar and by Nilim and El Ghaoui); none has a machine-checked proof. This mission produces the first formal robust-MDP model and robust policy-iteration theorem on the platform.

Difficulty

The obvious argument copies Howard's improvement lemma. It fails at two points. First, the value of a policy is itself the result of an inner optimization by nature, so comparing two policies requires comparing two different worst-case transition matrices; the matrix P∗BP^{*B}P∗B minimizing against BBB is not the one minimizing against AAA. Second, the proof of Proposition 4 as printed shows only that nature's values decrease and converge; that the limit is nature's optimum, over a continuum of admissible rows, needs a separate argument. Finally, Proposition 1 involves randomized strategies and probability measures on the uncertainty sets, and reducing them to pure strategies is the content of Propositions 1 and 2, not a definitional convenience.

Formalization scope

States are a finite type S (nonemptiness is not needed: every statement is unchanged in meaning at N=1N=1N=1 and trivially true at N=0N=0N=0), decisions a family D : S → Type* of finite nonempty types. The model fixes these conventions and readings:

  • 0≤β<10\le\beta<10≤β<1 (not printed; every return is an infinite discounted sum) and nonempty SikS_i^kSik​ (not printed; Phase 1 presupposes a feasible row) are added standing hypotheses; closedness and convexity are the paper's.
  • The present value is [I−βPA]−1[I-\beta P^A]^{-1}[I−βPA]−1 applied to the one-step rewards; the Eq. (5) milestone proves it is the unique solution of (5).
  • "min over pik∈Sikp_i^k\in S_i^kpik​∈Sik​" in (2) is an infimum over the nonempty type of admissible choices P∈SP\in SP∈S, bounded below; "max over all policies" is a maximum over pure stationary policies, with randomization handled in (4).
  • In (4), τ\tauτ ranges over probability vectors on DjD_jDj​ and α\alphaα over probability measures on row vectors with α(Sjk)=1\alpha(S_j^k)=1α(Sjk​)=1; the missing integral sign and unmatched brace of the printed display are corrected.
  • "Optimal" = equal to the max-min return in every state; "ε\varepsilonε-optimal" = within ±ε\pm\varepsilon±ε in every state (p. 731); "ε\varepsilonε-optimal for nature" = within ε\varepsilonε of nature's minimum.
  • "Terminates" = Phase 2 returns the same policy; "a finite number of iterations" is stated with the explicit bound "fewer than the number of policies".
  • Phase 1 is taken exact in Phase 2 (the proofs of Propositions 3 and 5 use exact minimizers); the Phase 1 stopping test is printed without Σ\SigmaΣ and the sum is formalized.
  • Retention rule: Phase 2 keeps AiA_iAi​ when it is already a maximizer. It is not printed, but it is Howard's rule and Proposition 5 is false without it.
  • Proposition 5's "ε\varepsilonε-optimal … in a finite number of iterations" is formalized as exact termination at an optimal policy, which implies the printed claim for every ε\varepsilonε.

Equation (4) must not be collapsed to max⁡kmin⁡p∈Sjk\max_k\min_{p\in S_j^k}maxk​minp∈Sjk​​ in its definition: that would make Proposition 2 true by definition. Similarly, the Phase 2 relation always has a successor and algorithm runs exist from every policy, so the goal is not vacuous.

Needed infrastructure: Neumann series for I−βPI-\beta PI−βP with stochastic PPP, monotonicity of policy evaluation, existence of minimizers of linear functions on compact subsets of the simplex, and the contraction argument for the robust Bellman operator. These are reusable for any robust or known-transition MDP development. Proofs of any milestone, alternative arguments for Propositions 1 and 2, and extensions to the max-max criterion are welcome.

Selected references

  • J. K. Satia and R. E. Lave, Jr., Markovian Decision Processes with Uncertain Transition Probabilities, Operations Research 21(3), 728–740, 1973. https://doi.org/10.1287/opre.21.3.728
  • R. A. Howard, Dynamic Programming and Markov Processes, MIT Press, 1960.
  • L. S. Shapley, Stochastic Games, PNAS 39(10), 1095–1100, 1953. https://doi.org/10.1073/pnas.39.10.1095
  • G. N. Iyengar, Robust Dynamic Programming, Mathematics of Operations Research 30(2), 257–280, 2005. https://doi.org/10.1287/moor.1040.0129
  • A. Nilim and L. El Ghaoui, Robust Control of Markov Decision Processes with Uncertain Transition Matrices, Operations Research 53(5), 780–798, 2005. https://doi.org/10.1287/opre.1050.0216
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CombinatoricsGraph TheoryOptimization+1·Captain: mikedeng1

An Analysis of Several Heuristics for the Traveling Salesman Problem I: Nearest Neighbor Tours Can Be Far from OptimalResearch Paper

Motivation

The traveling salesman problem with the triangle inequality asks for a shortest closed tour through nnn points whose distances form a metric. It is NP-hard, so in practice tours are built by fast construction heuristics, and the natural question is how far such a tour can be from optimal in the worst case. Rosenkrantz, Stearns and Lewis (SIAM J. Comput. 6(3), 1977) gave the first systematic worst-case analysis of the standard heuristics. Their results are reproduced in textbooks on approximation algorithms and combinatorial optimization, and they are the reference point against which later guarantees (Christofides' 3/23/23/2 algorithm, the double-tree 222-approximation) are compared.

The simplest heuristic studied is the nearest neighbor algorithm (Bellmore and Nemhauser, 1968; the "next best method" of Gavett, 1965): from the current node, always move to the closest node not yet visited, and return to the start at the end. The paper shows that this greedy rule is never worse than logarithmic (Theorem 1) and that the logarithm cannot be removed (Theorem 2). This mission is about Theorem 2, the lower bound.

Setting

A traveling salesman graph on nnn nodes is a complete graph with a distance d(a,b)∈Rd(a,b)\in\mathbb Rd(a,b)∈R that is symmetric, d(a,b)=d(b,a)d(a,b)=d(b,a)d(a,b)=d(b,a), nonnegative, d(a,b)≥0d(a,b)\ge 0d(a,b)≥0, and satisfies the triangle inequality d(a,c)≤d(a,b)+d(b,c)d(a,c)\le d(a,b)+d(b,c)d(a,c)≤d(a,b)+d(b,c). A tour lists the nodes in a visiting order τ(0),…,τ(n−1)\tau(0),\dots,\tau(n-1)τ(0),…,τ(n−1) and returns to τ(0)\tau(0)τ(0); its length is the sum of the nnn distances along it. OPTIMAL is the least length of a tour.

The nearest neighbor algorithm starts at an arbitrary node τ(0)\tau(0)τ(0); having reached τ(k)\tau(k)τ(k), it moves to a node τ(k+1)\tau(k+1)τ(k+1) that minimizes d(τ(k),⋅)d(\tau(k),\cdot)d(τ(k),⋅) over the nodes not yet visited, breaking ties arbitrarily; after the last node it returns to τ(0)\tau(0)τ(0). The length of the resulting tour is written NEARNEIBER. Because the start node and the ties are free, one instance has in general several nearest-neighbor tours. A lower bound needs only one of them; an upper bound must hold for all.

The instances of the proof are built from a recursive family of weighted graphs. With li=16(4⋅2i−(−1)i+3)l_i=\frac16(4\cdot 2^i-(-1)^i+3)li​=61​(4⋅2i−(−1)i+3) (so l1,l2,l3,l4=2,3,6,11l_1,l_2,l_3,l_4=2,3,6,11l1​,l2​,l3​,l4​=2,3,6,11), the graph F1F_1F1​ is a triangle with unit weights, and Fi+1F_{i+1}Fi+1​ consists of two copies of FiF_iFi​ joined through one new node by two edges of length 111 and two edges of length lil_ili​. Each FiF_iFi​ has 2i+1−12^{i+1}-12i+1−1 nodes and a path PiP_iPi​ from its start node to its middle node through every node, of length LiL_iLi​ with L1=2L_1=2L1​=2, Li+1=2Li+2liL_{i+1}=2L_i+2l_iLi+1​=2Li​+2li​. The graph GiG_iGi​ adds two closing edges to FiF_iFi​, and Gˉi\bar G_iGˉi​ is the complete graph on the same nodes whose distance is the shortest-path distance of GiG_iGi​.

Formalization targets

Goal: Theorem 2 (p. 566)

For each m>3m>3m>3 there is a traveling salesman graph with n=2m−1n=2^m-1n=2m−1 nodes and a nearest-neighbor tour on it such that

NEARNEIBEROPTIMAL>13lg⁡(n+1)+49.\frac{\mathrm{NEARNEIBER}}{\mathrm{OPTIMAL}}>\frac13\lg(n+1)+\frac49 .OPTIMALNEARNEIBER​>31​lg(n+1)+94​.

The statement is existential in both the instance and the run of the algorithm, exactly as in the paper.

Milestones, in the order the proof uses them

  1. (2.12): the difference equation Li+1=2Li+2liL_{i+1}=2L_i+2l_iLi+1​=2Li​+2li​, L1=2L_1=2L1​=2, has the solution Li=19(6 i 2i+8⋅2i+(−1)i−9)L_i=\frac19(6\,i\,2^i+8\cdot2^i+(-1)^i-9)Li​=91​(6i2i+8⋅2i+(−1)i−9).
  2. Gˉi\bar G_iGˉi​ is a traveling salesman graph: the shortest-path distance of GiG_iGi​ is symmetric, nonnegative and satisfies the triangle inequality.
  3. (2.13)–(2.17): the shortest-path distances in Fi+1F_{i+1}Fi+1​ between the seven named nodes A,…,GA,\dots,GA,…,G of Fig. 1, e.g. AG‾=li+2−2\overline{AG}=l_{i+2}-2AG=li+2​−2.
  4. Property a): every edge of GiG_iGi​ is a shortest path between its endpoints.
  5. Property b): the nearest neighbor algorithm started at the start node of Gˉi\bar G_iGˉi​ can follow PiP_iPi​ and return along the edge of length li−1l_i-1li​−1.
  6. The optimal tour: OPTIMAL(Gˉi)=2i+1−1\mathrm{OPTIMAL}(\bar G_i)=2^{i+1}-1OPTIMAL(Gˉi​)=2i+1−1.
  7. The exact ratio: the tour along PiP_iPi​ has length Li+li−1L_i+l_i-1Li​+li​−1, so its ratio is (Li+li−1)/n(L_i+l_i-1)/n(Li​+li​−1)/n.
  8. The inequality: (Li+li−1)/n>13lg⁡(n+1)+49(L_i+l_i-1)/n>\frac13\lg(n+1)+\frac49(Li​+li​−1)/n>31​lg(n+1)+94​ for i≥3i\ge3i≥3.

The instance for mmm is Gˉm−1\bar G_{m-1}Gˉm−1​.

Significance

Theorem 1 of the same paper shows NEARNEIBER/OPTIMAL≤12⌈lg⁡n⌉+12\mathrm{NEARNEIBER}/\mathrm{OPTIMAL}\le\frac12\lceil\lg n\rceil+\frac12NEARNEIBER/OPTIMAL≤21​⌈lgn⌉+21​ for every nearest-neighbor tour on every traveling salesman graph. Theorem 2 shows that this bound has the right order: no constant-factor guarantee holds for the nearest neighbor rule, and the gap between the two constants (13\frac1331​ against 12\frac1221​) is all that remains. This separates the nearest neighbor rule from the insertion rules analysed later in the same paper, of which nearest and cheapest insertion are within a factor 222 of optimal. It is the standard example of a natural greedy heuristic whose approximation ratio grows with nnn.

The upper bound, Theorem 1, is already on Prove2Me with a machine-checked proof (SupplyChainTheory.nearest_neighbor_bound); its statement notes that the lower-bound instances are not formalized there. This mission supplies them: an explicit recursive family of metric instances, the shortest-path computations that certify it, and the arithmetic of its ratio. The result is proved in the paper; to our knowledge it has not been formalized in any proof assistant. The construction (a recursively defined weighted graph with a closed-form shortest-path table) is also a reusable pattern for other worst-case lower bounds of greedy heuristics.

Difficulty

The arithmetic ((2.12) and the final inequality) is routine. The content is in properties a) and b). A shortest-path distance is an infimum over all walks, and property a) asks that no detour through the recursive structure is shorter than the direct edge, at every level of the recursion. The paper handles this by an induction on (2.13)–(2.17) that tracks only seven nodes per level, and argues that distances inside a copy of FiF_iFi​ are not shortened by embedding it into Fi+1F_{i+1}Fi+1​. Property b) then needs that at each step of PiP_iPi​ the chosen node is at least as close as every unvisited node, including nodes in the other copy and nodes reached through the start or right nodes; ties occur, and the claim is only that some resolution of them follows PiP_iPi​. Checking small cases by computer does not give either property for all iii.

Formalization scope

Nodes of an instance are Fin n, a tour is a permutation of Fin n, the tour length is the sum over consecutive pairs including the closing edge, and OPTIMAL is a minimum over the finite set of permutations. The model is the paper's: symmetric, nonnegative distances with the triangle inequality. The distance structure also carries d(a,a)=0d(a,a)=0d(a,a)=0, a normalization not in the paper; the diagonal never enters a tour length. A nearest-neighbor tour is a permutation in which each step goes to a node at least as close as every unvisited node, from an arbitrary start with arbitrary ties.

Ratios are multiplied out: the goal is (13log⁡2(n+1)+49)⋅OPTIMAL<NEARNEIBER(\frac13\log_2(n+1)+\frac49)\cdot\mathrm{OPTIMAL}<\mathrm{NEARNEIBER}(31​log2​(n+1)+94​)⋅OPTIMAL<NEARNEIBER together with OPTIMAL>0\mathrm{OPTIMAL}>0OPTIMAL>0, the paper's standing assumption (1.1). lg⁡(n+1)\lg(n+1)lg(n+1) is Real.logb 2 of n+1n+1n+1, as printed. Because of the strict inequality and the conjunct OPTIMAL>0\mathrm{OPTIMAL}>0OPTIMAL>0, the all-zero distance does not satisfy the goal, so the statement cannot be met by a degenerate instance.

In the construction the nodes of FiF_iFi​, GiG_iGi​, Gˉi\bar G_iGˉi​ are numbered 0,…,2i+1−20,\dots,2^{i+1}-20,…,2i+1−2 from left to right (start node 000, middle node 2i−12^i-12i−1, right node 2i+1−22^{i+1}-22i+1−2); in Fi+1F_{i+1}Fi+1​ the left copy comes first, then the new node, then the right copy. Graphs are edge lists with real weights and lil_ili​ is defined in R\mathbb RR exactly as in (2.11). The shortest-path distance is the infimum of walk weights over an inductive walk predicate; it would be 000 for two nodes with no connecting walk, a case that does not arise because every GiG_iGi​ and FiF_iFi​ is connected. LiL_iLi​ is defined by its difference equation; its identification with the length of the tour along PiP_iPi​ is milestone 7. All construction statements assume i≥1i\ge1i≥1.

A complete development needs a small library for shortest-path distances of finite weighted edge lists (symmetry, triangle inequality, attainment, behaviour under relabelling and under gluing two graphs at a few nodes); this part is reusable beyond the mission. Contributions welcome: proofs of any milestone, and such general shortest-path lemmas as separate theorems. Theorem 1 is not part of this mission.

Selected references

  • D. J. Rosenkrantz, R. E. Stearns, P. M. Lewis II, An Analysis of Several Heuristics for the Traveling Salesman Problem, SIAM J. Comput. 6(3):563–581, 1977. https://doi.org/10.1137/0206041
  • M. Bellmore, G. L. Nemhauser, The Traveling Salesman Problem: A Survey, Operations Research 16(3):538–558, 1968. https://doi.org/10.1287/opre.16.3.538
  • J. W. Gavett, Three Heuristic Rules for Sequencing Jobs to a Single Production Facility, Management Science 11(8):B166–B176, 1965. https://doi.org/10.1287/mnsc.11.8.B166
  • N. Christofides, Worst-Case Analysis of a New Heuristic for the Travelling Salesman Problem, Report 388, Graduate School of Industrial Administration, Carnegie Mellon University, 1976.
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Convex OptimizationOptimization·Captain: mikedeng1

An Exact Duality Theory for Semidefinite Programming and Its Complexity Implications: The Extended Lagrange–Slater Dual Has Zero Duality Gap and Attains Its OptimumResearch Paper

Motivation

Semidefinite programming (SDP) optimizes a linear function over the intersection of the cone of positive semidefinite matrices with an affine subspace. It contains linear programming as the diagonal case and is the computational core of relaxations in combinatorial optimization, control theory and polynomial optimization. Its standard duality theory, however, is weaker than that of linear programming. The Lagrangian dual of an SDP can have a strictly positive duality gap, can fail to attain its optimal value, and an infeasible semidefinite system need not have a certificate of infeasibility of the naive Farkas form. All the classical strong duality theorems for SDP therefore assume a constraint qualification such as Slater's condition (a strictly feasible point).

M. V. Ramana (1997, Math. Program. 77, 129–162) constructed a dual, the Extended Lagrange–Slater Dual (ELSD), whose size is polynomial in the data and which enjoys every property of linear programming duality for every SDP, with no constraint qualification. The same construction yields an exact theorem of the alternative for semidefinite feasibility and the complexity consequence that semidefinite feasibility lies in NP if and only if it lies in co-NP in the Turing model.

Timeline:

  • 1980s–1990s: Lagrangian (Slater-type) duality for SDP, with strong duality under strict feasibility (see e.g. the surveys of Vandenberghe and Boyd, SIAM Rev. 38 (1996)).
  • 1981: Borwein and Wolkowicz, facial reduction for general convex programs, which regularizes a problem by passing to the minimal face containing the feasible set; not of polynomial size in the SDP data (J. Math. Anal. Appl. 83 (1981)).
  • 1997: Ramana, the ELSD, an explicit polynomial-size dual with zero gap and dual attainment for every SDP.
  • 1997: Ramana, Tunçel and Wolkowicz relate the ELSD to facial reduction (SIAM J. Optim. 7 (1997)).

Setting

Let n,mn, mn,m be natural numbers, Mn\mathcal M_nMn​ the space of real n×nn\times nn×n matrices, and Sn⊆Mn\mathcal S_n\subseteq\mathcal M_nSn​⊆Mn​ the symmetric ones. On Mn\mathcal M_nMn​ the inner product is A∙B=∑i,jAijBijA\bullet B = \sum_{i,j}A_{ij}B_{ij}A∙B=∑i,j​Aij​Bij​. For symmetric AAA, A⪰0A\succeq 0A⪰0 means AAA is positive semidefinite. The data are symmetric Q0,Q1,…,Qm∈SnQ_0, Q_1,\dots,Q_m\in\mathcal S_nQ0​,Q1​,…,Qm​∈Sn​ and c∈Rmc\in\mathbb R^mc∈Rm. The primal SDP is

(P)sup⁡ cTxs.t.Q(x):=Q0−∑i=1mxiQi⪰0,(\mathrm P)\qquad \sup\ c^{\mathsf T}x\quad\text{s.t.}\quad Q(x) := Q_0-\sum_{i=1}^m x_iQ_i\succeq 0 ,(P)sup cTxs.t.Q(x):=Q0​−i=1∑m​xi​Qi​⪰0,

with feasible region G={x∣Q(x)⪰0}G = \{x\mid Q(x)\succeq 0\}G={x∣Q(x)⪰0}, a spectrahedron. Define Q∗:Mn→RmQ^*:\mathcal M_n\to\mathbb R^mQ∗:Mn​→Rm by Q∗(U)=(U∙Qi)i=1mQ^*(U) = (U\bullet Q_i)_{i=1}^mQ∗(U)=(U∙Qi​)i=1m​ and write Q#(U)=0Q^\#(U) = 0Q#(U)=0 for "Q0∙U=0Q_0\bullet U = 0Q0​∙U=0 and Q∗(U)=0Q^*(U) = 0Q∗(U)=0".

For k≥1k\ge 1k≥1 let Ck\mathcal C_kCk​ be the set of tuples (Ui,Wi)i=1k(U_i, W_i)_{i=1}^k(Ui​,Wi​)i=1k​ of real n×nn\times nn×n matrices with W0=0W_0 = 0W0​=0 and, for i=1,…,ki = 1,\dots,ki=1,…,k,

Q#(Ui+Wi−1)=0,Ui⪰WiWiT.Q^\#(U_i+W_{i-1}) = 0,\qquad U_i\succeq W_iW_i^{\mathsf T}.Q#(Ui​+Wi−1​)=0,Ui​⪰Wi​WiT​.

The WiW_iWi​ need not be symmetric. Uk\mathcal U_kUk​ and Wk\mathcal W_kWk​ are the sets of last components UkU_kUk​ and WkW_kWk​; W0={0}\mathcal W_0 = \{0\}W0​={0}. The ELSD is

inf⁡ (U+W)∙Q0s.t.Q∗(U+W)=c,W∈Wm,U⪰0,\inf\ (U+W)\bullet Q_0\quad\text{s.t.}\quad Q^*(U+W) = c,\quad W\in\mathcal W_m,\quad U\succeq 0,inf (U+W)∙Q0​s.t.Q∗(U+W)=c,W∈Wm​,U⪰0,

and Weak-ELSD is the same program with Wm−1\mathcal W_{m-1}Wm−1​. For the milestones: the polar G∘={y∣xTy≤1 ∀x∈G}G^\circ = \{y\mid x^{\mathsf T}y\le 1\ \forall x\in G\}G∘={y∣xTy≤1 ∀x∈G}, the algebraic polar G∗={Q∗(U)∣U∙Q0≤1, U⪰0}G^* = \{Q^*(U)\mid U\bullet Q_0\le 1,\ U\succeq 0\}G∗={Q∗(U)∣U∙Q0​≤1, U⪰0}, and Sk=Q∗(Wk)S_k = Q^*(\mathcal W_k)Sk​=Q∗(Wk​).

Formalization targets

Goal: Theorem 6 (Duality Theorem)

For all data (Q0,…,Qm,c)(Q_0,\dots,Q_m,c)(Q0​,…,Qm​,c):

  1. weak duality: cTx≤(U+W)∙Q0c^{\mathsf T}x\le (U+W)\bullet Q_0cTx≤(U+W)∙Q0​ for x∈Gx\in Gx∈G and (U,W)(U,W)(U,W) feasible for ELSD or Weak-ELSD;
  2. if G≠∅G\neq\emptysetG=∅, then sup⁡x∈GcTx<∞\sup_{x\in G}c^{\mathsf T}x<\inftysupx∈G​cTx<∞ iff ELSD is feasible, iff Weak-ELSD is feasible;
  3. if G≠∅G\ne\emptysetG=∅ and ELSD (or Weak-ELSD) is feasible, there is v∈Rv\in\mathbb Rv∈R with
v=sup⁡x∈GcTx=inf⁡ELSD(U+W)∙Q0=inf⁡Weak-ELSD(U+W)∙Q0;v = \sup_{x\in G}c^{\mathsf T}x = \inf_{\mathrm{ELSD}}(U+W)\bullet Q_0 = \inf_{\mathrm{Weak\text{-}ELSD}}(U+W)\bullet Q_0;v=x∈Gsup​cTx=ELSDinf​(U+W)∙Q0​=Weak-ELSDinf​(U+W)∙Q0​;
  1. if G≠∅G\ne\emptysetG=∅ and the primal is bounded, ELSD attains vvv.

Milestones

Propositions 7(vi) and 7(vii) (facts on PSD matrices), Lemma 9 (annihilation Q(x)U=Q(x)W=0Q(x)U = Q(x)W = 0Q(x)U=Q(x)W=0), weak duality over every Wk\mathcal W_kWk​, Lemma 10 (nested subspaces), Lemma 13 (G∘=Cl(G∗)G^\circ = \mathrm{Cl}(G^*)G∘=Cl(G∗)), Corollary 14, Claims 17 and 16, the central Theorem 12,

G∘={Q∗(U+W)∣W∈Wk, U⪰0, U∙Q0≤1}(0∈G, k≥m−1),G^\circ = \{Q^*(U+W)\mid W\in\mathcal W_k,\ U\succeq 0,\ U\bullet Q_0\le 1\}\qquad(0\in G,\ k\ge m-1),G∘={Q∗(U+W)∣W∈Wk​, U⪰0, U∙Q0​≤1}(0∈G, k≥m−1),

the translation invariance of Ck,Uk,Wk\mathcal C_k,\mathcal U_k,\mathcal W_kCk​,Uk​,Wk​ (§2.5), and system (14) (dual attainment at value 0). Theorems 19–21 (Farkas lemma for SDP, optimality condition, primal attainment) are further items stated on the same definitions.

Significance

The Duality Theorem gives SDP a dual with the full strength of linear programming duality for every instance, at polynomial size. Consequences in the paper: an exact theorem of the alternative for semidefinite feasibility (Theorem 19); semidefinite characterizations of optimality of a given point and of primal attainment (Theorems 20, 21); and the complexity results that semidefinite feasibility is in NP iff it is in co-NP in the Turing model and in NP ∩ co-NP in the Blum–Shub–Smale model (Theorem 25, not part of this mission). Theorem 12 separately gives an exact semidefinite description of the polar of any spectrahedron containing the origin.

The results are proved on paper and are classical. No machine-checked version is known to exist; the platform's existing SDP duality theorem assumes Slater's condition. A formalization would provide the first constraint-qualification-free SDP duality in Lean, together with reusable infrastructure on PSD matrices (range inclusion, A∙B=0⇒AB=0A\bullet B = 0\Rightarrow AB = 0A∙B=0⇒AB=0) and on polars of convex sets.

Difficulty

The obvious route to SDP strong duality separates the primal's value from the image of the PSD cone under a linear map and invokes a closed-cone Farkas lemma. That step fails: the linear image of the PSD cone need not be closed, which is exactly why Lagrangian duality has gaps. In this mission the obstruction reappears as the non-closedness of the algebraic polar G∗G^*G∗ (Lemma 13 only gives G∘=Cl(G∗)G^\circ = \mathrm{Cl}(G^*)G∘=Cl(G∗)). The difficulty is to show that finitely many, and at most m−1m-1m−1, corrections by the sets SkS_kSk​ close G∗+SkG^*+S_kG∗+Sk​ (Claims 16, 17), and to control dimensions in doing so. A proof by assuming closedness, strict feasibility or a Slater point is a different theorem.

Formalization scope

Everything lives in the namespace ExactSDPDuality.ELSD, in one definition file. Matrices are Matrix (Fin n) (Fin n) ℝ, vectors Fin m → ℝ; "⪰0\succeq 0⪰0" is Mathlib's PosSemidef (which over ℝ includes symmetry); A∙BA\bullet BA∙B is the entrywise sum on all of Mn\mathcal M_nMn​; cTxc^{\mathsf T}xcTx is the dot product. The data Q0,…,QmQ_0,\dots,Q_mQ0​,…,Qm​ carry symmetry hypotheses in every statement, as the paper assumes throughout. Ck\mathcal C_kCk​ is encoded by sequences U,W:N→MnU, W:\mathbb N\to\mathcal M_nU,W:N→Mn​ with U0=W0=0U_0 = W_0 = 0U0​=W0​=0, so U0=W0={0}\mathcal U_0 = \mathcal W_0 = \{0\}U0​=W0​={0}; for m=0m = 0m=0 the index m−1m-1m−1 is 000. Optimal values are least upper and greatest lower bounds of the value sets, never real sSup/sInf. The polar is the one-sided polar. In §2.4 statements the standing assumption 0∈G0\in G0∈G is a hypothesis. In Claim 16 the index satisfies k+1≤mk+1\le mk+1≤m, the range where Sk+1S_{k+1}Sk+1​ is introduced, and dim⁡Sk\dim S_kdimSk​ is the rank of the span of SkS_kSk​.

Theorems 20 and 21 are printed with Q∗(U+W)=0Q^*(U+W) = 0Q∗(U+W)=0; both are false as printed (counterexamples in the items) and are stated with the corrected Q∗(U+W)=cQ^*(U+W) = cQ∗(U+W)=c that the paper's derivation from Theorem 6 gives.

Trivializing formalizations are ruled out: no Slater or other constraint qualification appears; the dual is the ELSD built from the recursively defined Wm\mathcal W_mWm​, not the Lagrangian dual or an arbitrary subspace; the WiW_iWi​ range over all of Mn\mathcal M_nMn​, not only symmetric matrices (the paper's Example 4 needs a nonsymmetric W2W_2W2​).

Needed infrastructure: PSD matrix facts (Proposition 7), bipolar theorem for closed convex sets containing the origin (Proposition 11), closedness arguments for linear images of cones, and dimension counting of subspaces of Rm\mathbb R^mRm. Contributions of any milestone, of these general lemmas, and of alternative proofs (for instance via facial reduction) are welcome.

Selected references

  • M. V. Ramana, An exact duality theory for semidefinite programming and its complexity implications, Mathematical Programming 77 (1997) 129–162. https://doi.org/10.1007/BF02614433
  • M. V. Ramana, L. Tunçel, H. Wolkowicz, Strong duality for semidefinite programming, SIAM Journal on Optimization 7 (1997) 641–662. https://doi.org/10.1137/S1052623495288350
  • J. M. Borwein, H. Wolkowicz, Regularizing the abstract convex program, Journal of Mathematical Analysis and Applications 83 (1981) 495–530. https://doi.org/10.1016/0022-247X(81)90138-4
  • L. Vandenberghe, S. Boyd, Semidefinite programming, SIAM Review 38 (1996) 49–95. https://doi.org/10.1137/1038003
  • R. T. Rockafellar, Convex Analysis, Princeton University Press, 1970. https://doi.org/10.1515/9781400873173
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A Nonsmooth Version of Newton's Method II: global convergence of the generalized-Jacobian Newton method on a ball, with an error estimateResearch Paper

Motivation

Many problems in optimization and equilibrium modelling reduce to a system of equations F(x)=0F(x) = 0F(x)=0 with F:Rn→RnF : \mathbb{R}^n \to \mathbb{R}^nF:Rn→Rn that is continuous and locally Lipschitz but not differentiable. Complementarity problems rewritten through the min or Fischer–Burmeister functions, Karush–Kuhn–Tucker systems of nonlinear programs, and the gradients of augmented Lagrangians all have this form. Newton's method xk+1=xk−F′(xk)−1F(xk)x^{k+1} = x^k - F'(x^k)^{-1}F(x^k)xk+1=xk−F′(xk)−1F(xk) cannot be applied verbatim, because F′(xk)F'(x^k)F′(xk) need not exist.

Qi and Sun (Math. Programming 58 (1993) 353–367) replaced the Jacobian by an arbitrary element of Clarke's generalized Jacobian and proved that the resulting method converges under a condition they called semismoothness, extending Mifflin's notion (SIAM J. Control Optim. 15 (1977)) from functionals to maps. The paper has two convergence results. Theorem 3.2 is local: near a semismooth root with nonsingular generalized Jacobian the method converges superlinearly. Theorem 3.3, the target of this mission, is global in the Newton–Kantorovich sense: explicit constants on a ball SSS around the starting point guarantee that the iteration never leaves SSS, that FFF has exactly one zero in SSS, and that the iterates converge to it with a computable error bound. The authors describe it as "an extension of the classical Newton-Kantorovich theorem" (p. 361), which is stated for smooth maps in Ortega and Rheinboldt's monograph.

Timeline.

  • 1948: Kantorovich proves semilocal convergence of Newton's method for smooth operators in Banach spaces.
  • 1975–1983: Clarke introduces the generalized gradient and generalized Jacobian of a locally Lipschitz map (Optimization and Nonsmooth Analysis, Wiley 1983).
  • 1977: Mifflin defines semismooth functionals.
  • 1990: Pang proves convergence of a B-derivative Newton method under a strong Fréchet derivative at the solution.
  • 1993: Qi and Sun (this paper) prove local and global convergence of the generalized-Jacobian Newton method for semismooth maps.

Setting

Work in Rn\mathbb{R}^nRn with the Euclidean norm ∥⋅∥\|\cdot\|∥⋅∥; for a linear map VVV, ∥V∥\|V\|∥V∥ is the induced operator norm. Let F:Rn→RnF : \mathbb{R}^n \to \mathbb{R}^nF:Rn→Rn be locally Lipschitz. Write DFD_FDF​ for the set of points where FFF is differentiable and JF(y)JF(y)JF(y) for the derivative at y∈DFy \in D_Fy∈DF​.

  • The generalized Jacobian of FFF at xxx is
∂F(x)=co{lim⁡i→∞JF(xi):xi→x, xi∈DF}.\partial F(x) = \mathrm{co}\Big\{\lim_{i\to\infty} JF(x_i) : x_i \to x,\ x_i \in D_F\Big\}.∂F(x)=co{i→∞lim​JF(xi​):xi​→x, xi​∈DF​}.
  • The directional derivative is F′(x;h)=lim⁡t↓0 (F(x+th)−F(x))/tF'(x;h) = \lim_{t\downarrow 0}\,(F(x+th)-F(x))/tF′(x;h)=limt↓0​(F(x+th)−F(x))/t.
  • FFF is semismooth at xxx if it is Lipschitz near xxx and, for every hhh, Vh′V h'Vh′ has a limit as V∈∂F(x+th′)V \in \partial F(x+th')V∈∂F(x+th′), h′→hh' \to hh′→h, t↓0t \downarrow 0t↓0. Semismoothness implies that F′(x;h)F'(x;h)F′(x;h) exists.
  • A run of the nonsmooth Newton method (3.2) from x0x^0x0 is a pair of sequences (xk)(x^k)(xk), (Vk)(V_k)(Vk​) with Vk∈∂F(xk)V_k \in \partial F(x^k)Vk​∈∂F(xk) and Vk(xk+1−xk)=−F(xk)V_k(x^{k+1} - x^k) = -F(x^k)Vk​(xk+1−xk)=−F(xk) for all kkk; any element of ∂F(xk)\partial F(x^k)∂F(xk) may be chosen.

In Lean these are NonsmoothNewton.Global.clarkeJac, dirDeriv, SemismoothAt and IsNewtonRun, over EuclideanSpace ℝ (Fin n).

Fix x0x^0x0, r≥0r \ge 0r≥0, the closed ball S={x:∥x−x0∥≤r}S = \{x : \|x - x^0\| \le r\}S={x:∥x−x0∥≤r}, and constants β,γ,δ\beta, \gamma, \deltaβ,γ,δ with α=β(γ+δ)\alpha = \beta(\gamma+\delta)α=β(γ+δ).

Formalization targets

Goal: Theorem 3.3 (global convergence)

Assume FFF is semismooth at every point of SSS and, for all x,y∈Sx, y \in Sx,y∈S and V∈∂F(x)V \in \partial F(x)V∈∂F(x): VVV is nonsingular,

∥V−1∥≤β,∥V(y−x)−F′(x;y−x)∥≤γ∥y−x∥,∥F(y)−F(x)−F′(x;y−x)∥≤δ∥y−x∥,\|V^{-1}\| \le \beta,\qquad \|V(y-x) - F'(x;y-x)\| \le \gamma\|y-x\|,\qquad \|F(y)-F(x)-F'(x;y-x)\| \le \delta\|y-x\|,∥V−1∥≤β,∥V(y−x)−F′(x;y−x)∥≤γ∥y−x∥,∥F(y)−F(x)−F′(x;y−x)∥≤δ∥y−x∥,

with α<1\alpha < 1α<1 and β∥F(x0)∥≤r(1−α)\beta\|F(x^0)\| \le r(1-\alpha)β∥F(x0)∥≤r(1−α). Then every run of (3.2) from x0x^0x0 stays in SSS, every VkV_kVk​ is nonsingular, FFF has a unique zero x∗x^*x∗ in SSS, xk→x∗x^k \to x^*xk→x∗, and

∥xk−x∗∥≤α1−α ∥xk−xk−1∥,k=1,2,…(3.4)\|x^k - x^*\| \le \frac{\alpha}{1-\alpha}\,\|x^k - x^{k-1}\|,\qquad k = 1, 2, \dots \tag{3.4}∥xk−x∗∥≤1−αα​∥xk−xk−1∥,k=1,2,…(3.4)

Milestones (steps of the proof, p. 360)

  1. The first step: ∥x1−x0∥≤β∥F(x0)∥≤r(1−α)\|x^1 - x^0\| \le \beta\|F(x^0)\| \le r(1-\alpha)∥x1−x0∥≤β∥F(x0)∥≤r(1−α), so x1∈Sx^1 \in Sx1∈S.
  2. One-step contraction: for consecutive Newton points with xk−1,xk∈Sx^{k-1}, x^k \in Sxk−1,xk∈S, ∥xk+1−xk∥≤α∥xk−xk−1∥\|x^{k+1} - x^k\| \le \alpha\|x^k - x^{k-1}\|∥xk+1−xk∥≤α∥xk−xk−1∥.
  3. All iterates remain in SSS, with ∥xk+1−xk∥≤rαk(1−α)\|x^{k+1} - x^k\| \le r\alpha^k(1-\alpha)∥xk+1−xk∥≤rαk(1−α).
  4. A run that stays in SSS and converges has uniformly bounded ∥Vk∥\|V_k\|∥Vk​∥, and its limit is a zero of FFF.
  5. FFF has at most one zero in SSS.

Significance

The theorem certifies, from data checkable on a single ball, that a solution exists, where it is, that it is unique there, and how far the current iterate is from it; (3.4) is an a-posteriori stopping criterion. It holds for every choice of Vk∈∂F(xk)V_k \in \partial F(x^k)Vk​∈∂F(xk), which is what implementations need, since they compute one element of ∂F\partial F∂F and not the whole set. The result underlies the global and semilocal analysis of semismooth Newton methods for complementarity problems, variational inequalities and nonsmooth KKT systems, a line that continued through the 1990s and 2000s.

The theorem is proved on paper; no machine-checked version is known. The platform has no Newton–Kantorovich theorem, smooth or nonsmooth, and no Clarke generalized Jacobian. A complete formalization would supply both, and the definitions layer here (generalized Jacobian, one-sided directional derivative, semismoothness, Newton runs) is shared with the two companion missions on Qi and Sun's local convergence theorem and on semismoothness of augmented Lagrangian gradients.

Difficulty

The Newton map is set-valued: xk+1x^{k+1}xk+1 depends on the choice of VkV_kVk​, so the Banach fixed-point theorem for a single contraction does not apply directly, and the argument must hold for every sequence of choices. The contraction estimate needs both consecutive steps to start inside SSS, so containment in SSS and the geometric decay of the steps must be established together. Identifying the limit as a zero requires a uniform bound on ∥Vk∥\|V_k\|∥Vk​∥, which is not a hypothesis: it has to come from local Lipschitz continuity through the structure of the generalized Jacobian. Uniqueness uses an element V∗∈∂F(x∗)V^* \in \partial F(x^*)V∗∈∂F(x∗), whose existence rests on Rademacher's theorem. Finally, the directional derivative in the hypotheses is only meaningful because semismoothness makes it exist.

Formalization scope

The space is EuclideanSpace ℝ (Fin n), so the norm is Euclidean, as in the paper (p. 356), and ∥V−1∥\|V^{-1}\|∥V−1∥ is the operator norm. Local Lipschitzness is global (LocallyLipschitz F), the standing assumption of Section 3. Conventions:

  • ∂F(x)\partial F(x)∂F(x) is the convex hull of limits of fderiv along sequences in DFD_FDF​; no closure is taken (the limit set is compact for locally Lipschitz FFF).
  • "VVV nonsingular, ∥V−1∥≤β\|V^{-1}\| \le \beta∥V−1∥≤β" is the existence of a two-sided inverse WWW with ∥W∥≤β\|W\| \le \beta∥W∥≤β; Ring.inverse is not used.
  • F′(x;h)F'(x;h)F′(x;h) is dirDeriv, a limUnder along t→0+t \to 0^+t→0+, used only at points of SSS, where semismoothness makes the limit exist.
  • The run is a relation, not a function; every choice of VkV_kVk​ is covered, and nonsingularity of each VkV_kVk​ is a conclusion.
  • The radius condition r≥0r \ge 0r≥0 is an explicit hypothesis. Without it, r<0r < 0r<0 and β<0\beta < 0β<0 would satisfy all other hypotheses vacuously while x0∉Sx^0 \notin Sx0∈/S.
  • The paper's third inequality sits under "for any V∈∂F(x)V \in \partial F(x)V∈∂F(x)"; it is stated without VVV, which is equivalent because ∂F(x)≠∅\partial F(x) \ne \emptyset∂F(x)=∅.
  • (3.4) is stated at index k+1k+1k+1 for k≥0k \ge 0k≥0, avoiding natural-number subtraction.
  • The paper's statements contain no o(⋅)o(\cdot)o(⋅) or O(⋅)O(\cdot)O(⋅); all constants are explicit and fixed before the quantifiers over points of SSS.

The goal is the full four-part conclusion: containment, existence, uniqueness, and convergence with (3.4). A formalization that proves only that the iterates converge to some zero, or that treats ∂F(x)\partial F(x)∂F(x) as possibly empty so that the hypotheses become vacuous, is not the theorem. The hypotheses are satisfiable by genuinely nonsmooth maps, e.g. F(x)=x+110∣x∣−cF(x) = x + \tfrac{1}{10}|x| - cF(x)=x+101​∣x∣−c on R\mathbb{R}R with a ball containing the kink.

A complete development needs: nonemptiness and local boundedness of the generalized Jacobian (Rademacher's theorem, available in Mathlib as LipschitzWith.ae_differentiableAt); geometric-series and Cauchy-sequence arguments in a complete space. The generalized-Jacobian facts are reusable well beyond this mission. Contributions of any of the milestones, or of these general facts as separate lemmas, are welcome.

Selected references

  • L. Qi, J. Sun, A nonsmooth version of Newton's method, Mathematical Programming 58 (1993) 353–367. https://doi.org/10.1007/BF01581275
  • F. H. Clarke, Optimization and Nonsmooth Analysis, Wiley, New York, 1983. https://doi.org/10.1137/1.9781611971309
  • R. Mifflin, Semismooth and semiconvex functions in constrained optimization, SIAM J. Control Optim. 15 (1977) 959–972. https://doi.org/10.1137/0315061
  • J. M. Ortega, W. C. Rheinboldt, Iterative Solution of Nonlinear Equations in Several Variables, Academic Press, 1970. https://doi.org/10.1137/1.9780898719468
  • J.-S. Pang, Newton's method for B-differentiable equations, Mathematics of Operations Research 15 (1990) 311–341. https://doi.org/10.1287/moor.15.2.311
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Worst-Case Performance Bounds for Simple One-Dimensional Packing Algorithms 4: First-Fit Decreasing Uses at Most 71/60 L* + 5 Bins When No Item Exceeds 1/2Research Paper

Motivation

Bin packing asks how to place a list of items with sizes in (0,1](0,1](0,1] into as few unit-capacity bins as possible. It models the cutting of stock material, the packing of files onto tracks of a disc and the assignment of jobs to machines with a common deadline. Deciding the optimum is NP-hard, so in practice simple rules are used, and the question is how far they can stray from the optimum in the worst case.

Johnson, Demers, Ullman, Garey and Graham (SIAM J. Comput. 3(4), 1974) gave the first sharp worst-case bounds for the four classical rules. For First-Fit Decreasing (FFD), the rule that sorts the items into nonincreasing order and then places each into the first bin with room, they announced the bound FFD(L)≤119L∗+4FFD(L)\le\frac{11}{9}L^*+4FFD(L)≤911​L∗+4, whose full proof in Johnson's thesis exceeds 75 pages. To show the method, Section 4 of the paper proves a simpler bound in detail: when no item exceeds 1/21/21/2, FFD uses at most 7160L∗+5\frac{71}{60}L^*+56071​L∗+5 bins. That result is the subject of this mission.

Timeline:

  • 1973: D. S. Johnson's MIT thesis, Near-optimal bin packing algorithms, contains the complete proofs of the 11/911/911/9 and 71/6071/6071/60 bounds.
  • 1974: Johnson, Demers, Ullman, Garey and Graham publish the 71/6071/6071/60 bound for lists in (0,1/2](0,1/2](0,1/2] (Theorem 4.1) with a proof that is complete except for parts of two lemmas, and show by example that 71/6071/6071/60 cannot be lowered.
  • 1985: B. S. Baker gives a shorter proof of the 11/911/911/9 bound for FFD (J. Algorithms 6, 1985).
  • 2007: G. Dósa determines the tight additive constant 6/96/96/9 in the 11/911/911/9 bound (ESCAPE 2007, LNCS 4614).

Setting

A list is a finite sequence L=(a1,…,an)L=(a_1,\dots,a_n)L=(a1​,…,an​) of real numbers in (0,1](0,1](0,1]; values may repeat. A bin has capacity 111; its level is the sum of the numbers in it. The optimum L∗L^*L∗ is the least number of bins into which the elements of LLL can be placed with no bin level exceeding 111.

First-Fit places a1,a2,…a_1,a_2,\dotsa1​,a2​,… in order into bins B1,B2,…B_1,B_2,\dotsB1​,B2​,…, each initially at level 000: aia_iai​ goes into the bin of least index whose level β\betaβ satisfies β≤1−ai\beta\le 1-a_iβ≤1−ai​. First-Fit Decreasing first arranges LLL into nonincreasing order and then runs First-Fit. FFD(L)FFD(L)FFD(L) is the number of bins it uses.

The proof uses a weight WWW on finite sets of elements. For an integer k≥1k\ge1k≥1, xxx is a kkk-piece if x∈(1k+1,1k]x\in(\frac1{k+1},\frac1k]x∈(k+11​,k1​], and a kkk-bin is a bin whose largest element is a kkk-piece. Set w1(x)=⌊1/x⌋−1w_1(x)=\lfloor 1/x\rfloor^{-1}w1​(x)=⌊1/x⌋−1. A pair (x,y)(x,y)(x,y) obeys relation kkk if xxx is a kkk-piece and kx+y≤1kx+y\le1kx+y≤1; then w2(x,y)=w1(x)+k−1kw1(y)w_2(x,y)=w_1(x)+\frac{k-1}{k}w_1(y)w2​(x,y)=w1​(x)+kk−1​w1​(y), and otherwise w2(x,y)=w1(x)+w1(y)w_2(x,y)=w_1(x)+w_1(y)w2​(x,y)=w1​(x)+w1​(y). For a partition π\piπ of XXX into one- and two-element sets, with each pair ordered (earlier, later) in the nonincreasing order,

w12(π)=∑{x}∈πw1(x)+∑(x,y)∈πw2(x,y),W(X)=min⁡πw12(π).w_{12}(\pi)=\sum_{\{x\}\in\pi}w_1(x)+\sum_{(x,y)\in\pi}w_2(x,y),\qquad W(X)=\min_\pi w_{12}(\pi).w12​(π)={x}∈π∑​w1​(x)+(x,y)∈π∑​w2​(x,y),W(X)=πmin​w12​(π).

BASIC is the set of elements of LLL that are kkk-pieces lying in a kkk-bin of the FFD packing of LLL, for some kkk; SURPLUS is the rest of LLL.

Formalization targets

Goal: Theorem 4.1

for every list L⊆(0,12]:FFD(L)≤7160L∗+5.\text{for every list } L\subseteq(0,\tfrac12]:\qquad FFD(L)\le\frac{71}{60}L^*+5 .for every list L⊆(0,21​]:FFD(L)≤6071​L∗+5.

The constants are those printed in the paper. The multiplicative constant 71/6071/6071/60 is best possible.

Milestones

  1. Lemma 3.3 (FFD part): if FFD(L)>rL∗+dFFD(L)>rL^*+dFFD(L)>rL∗+d with r,d≥1r,d\ge1r,d≥1, the list L′L'L′ of the elements of LLL exceeding (r−1)/r(r-1)/r(r−1)/r also has FFD(L′)>rL′∗+dFFD(L')>rL'^*+dFFD(L′)>rL′∗+d.
  2. Claim 4.2.1: for N≥4N\ge4N≥4 and L⊆(1N,12]L\subseteq(\frac1N,\frac12]L⊆(N1​,21​], ∑x∈BASICw1(x)≥FFD(L)−∑j=2N−1j−1j\sum_{x\in\mathrm{BASIC}}w_1(x)\ge FFD(L)-\sum_{j=2}^{N-1}\frac{j-1}{j}∑x∈BASIC​w1​(x)≥FFD(L)−∑j=2N−1​jj−1​.
  3. Claim 4.2.2: for N≥4N\ge4N≥4, L⊆(1N,12]L\subseteq(\frac1N,\frac12]L⊆(N1​,21​] and every partition π\piπ of LLL into one- and two-element sets, w12(π)≥w1(BASIC)−∑j=3N−11jw_{12}(\pi)\ge w_1(\mathrm{BASIC})-\sum_{j=3}^{N-1}\frac1jw12​(π)≥w1​(BASIC)−∑j=3N−1​j1​.
  4. Lemma 4.2: for N≥4N\ge4N≥4 and L⊆(1N,12]L\subseteq(\frac1N,\frac12]L⊆(N1​,21​], W(L)≥FFD(L)−N+2W(L)\ge FFD(L)-N+2W(L)≥FFD(L)−N+2.
  5. Subadditivity: W(X1∪⋯∪Xk)≤∑iW(Xi)W(X_1\cup\dots\cup X_k)\le\sum_i W(X_i)W(X1​∪⋯∪Xk​)≤∑i​W(Xi​).
  6. Lemma 4.3: if X⊆(17,12]X\subseteq(\frac17,\frac12]X⊆(71​,21​] and ∑x∈Xx≤1\sum_{x\in X}x\le1∑x∈X​x≤1, then W(X)≤7160W(X)\le\frac{71}{60}W(X)≤6071​.

A companion item states the Remark after Theorem 4.1: for every N≥1N\ge1N≥1 there is a list with all elements below 1/31/31/3, L∗=60NL^*=60NL∗=60N and FFD(L)=71NFFD(L)=71NFFD(L)=71N.

Significance

Theorem 4.1 shows the weighting-function method in its simplest nontrivial form: a weight whose total is within a constant of the algorithm's bin count, and which no feasible bin can exceed by more than the target ratio. The same method, with more elaborate weights, gives the 11/911/911/9 bound for FFD, and it is the model for later worst-case analyses of packing heuristics. The Remark shows that 71/6071/6071/60 is exact for items in (0,1/2](0,1/2](0,1/2], and the Corollary on p. 322 extends the analysis to the asymptotic ratio RFFDαR^\alpha_{FFD}RFFDα​ when items are bounded by α∈(8/29,1/2]\alpha\in(8/29,1/2]α∈(8/29,1/2].

The source proof is partial. The billing argument behind Claim 4.2.2 is given only when two auxiliary conditions (G1) and (G2) hold ("The more intricate argument here omitted", p. 321), and Lemma 4.3 is checked in four of about seventy-four cases ("leaving the remaining 70-odd, more or less routine, cases to the ambitious reader", p. 321). Complete details are in Johnson's thesis. The theorem itself is established. A formalization therefore gives the first complete, checked proof in a single place. The finite case analysis of Lemma 4.3 is well suited to machine checking. No machine-checked proof of any FFD bound is known to exist.

Difficulty

The obvious weight w1w_1w1​ alone fails. Claim 4.2.1 shows that w1(BASIC)w_1(\mathrm{BASIC})w1​(BASIC) covers the FFD bins, but many sets XXX of elements with sum at most 111 have w1(X)>71/60w_1(X)>71/60w1​(X)>71/60, for example two 222-pieces, a 555-piece and a 666-piece. The pair discounts of w2w_2w2​ repair Lemma 4.3, but they must then be paid for in Lemma 4.2, for every partition. That is Claim 4.2.2: a charge from each discounted pair to distinct SURPLUS elements that are no larger. The charge is straightforward only when no member of a pair obeying relation kkk lies in a bin of type k′<kk'<kk′<k. In general a pair's larger element may already have been charged by a smaller relation, and the paper omits the argument that handles this. Lemma 4.3 is elementary but has many cases, each determined by the piece types in XXX and the relations they obey.

Formalization scope

A list is L : List ℝ with IsList L (0<a≤10<a\le10<a≤1 for each element) in every statement. L∗L^*L∗ is optBins L, the least bbb such that some map from positions to Fin b has every bin sum at most 111. The First-Fit run keeps the nonempty bins as a List (List ℝ), and opens a new bin at the end exactly when no existing bin fits, which is the paper's "least jjj". The fit test is β+a≤1\beta+a\le1β+a≤1. FFD is First-Fit on sortDesc L, the mergeSort into nonincreasing order; ties do not affect the bin count. Indices are 000-based.

W(X)W(X)W(X) sorts XXX into nonincreasing order and minimises w12w_{12}w12​ over the involutions of its positions: fixed points are singletons, and a pair i<σ(i)i<\sigma(i)i<σ(i) is oriented (larger, smaller). The minimum is over a finite nonempty set, so it is attained. BASIC is a set of positions of sortDesc L, and each position's bin is its bin in the final FFD packing. In w2w_2w2​, k=⌊1/x⌋k=\lfloor1/x\rfloork=⌊1/x⌋ is the piece type of the first element. Sums ∑j=2N−1\sum_{j=2}^{N-1}∑j=2N−1​ are over Finset.Icc 2 (N - 1) with N≥4N\ge4N≥4.

The goal's range is (0,1/2](0,1/2](0,1/2]. The restriction to (1/7,1/2](1/7,1/2](1/7,1/2] belongs only to the proof, through Lemma 3.3. Stating the goal for (1/7,1/2](1/7,1/2](1/7,1/2], weakening 71/6071/6071/60 or 555, or making WWW an unattained infimum would each change the theorem. Only the FFD half of Lemma 3.3 is stated. Claim 4.2.1 is stated with Lemma 4.2's standing hypothesis N≥4N\ge4N≥4. The Remark's printed range 0<ε≤5/870<\varepsilon\le5/870<ε≤5/87 is a misprint: its FFD packing needs ε<1/174\varepsilon<1/174ε<1/174, and the companion item states only the existence claim.

Infrastructure needed: a usable API for the First-Fit run (the invariants of the fold, bin levels, the order of bins), a lemma that FFD bins receive items in nonincreasing order, and a decision procedure for Lemma 4.3's case analysis over piece types. The model file and the weight file are reusable for the 11/911/911/9 bound (mission 3 of this series) and for the bounded-α\alphaα corollaries. Contributions of proofs of Lemma 4.3 by computer-checked case enumeration, and of the missing general case of Claim 4.2.2, are especially welcome.

Selected references

  • D. S. Johnson, A. Demers, J. D. Ullman, M. R. Garey, R. L. Graham, Worst-Case Performance Bounds for Simple One-Dimensional Packing Algorithms, SIAM J. Comput. 3(4):299–325, 1974. https://doi.org/10.1137/0203025
  • D. S. Johnson, Near-Optimal Bin Packing Algorithms, Ph.D. thesis, Massachusetts Institute of Technology, 1973 (reference [8] of the paper).
  • B. S. Baker, A new proof for the first-fit decreasing bin-packing algorithm, J. Algorithms 6, 1985.
  • G. Dósa, The tight bound of first fit decreasing bin-packing algorithm is FFD(I) ≤ 11/9 OPT(I) + 6/9, ESCAPE 2007, Lecture Notes in Computer Science 4614, 2007.
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Worst-Case Performance Bounds for Simple One-Dimensional Packing Algorithms 2: First-Fit and Best-Fit with Bounded Item SizesResearch Paper

Motivation

Bin packing asks for the fewest unit-capacity bins that hold a given list of item sizes. It models cutting stock, memory allocation, file placement and the loading of trucks, and it is NP-hard, so in practice lists are packed by simple rules that look at one item at a time. The two most widely used rules are First-Fit and Best-Fit, and the question that Johnson, Demers, Ullman, Garey and Graham answered in 1974 is how far from optimal they can be in the worst case.

Their headline answer is that both rules use at most about 1710\tfrac{17}{10}1017​ times the optimal number of bins, and that 1710\tfrac{17}{10}1017​ is asymptotically attained. The lists that force this ratio use items larger than 12\tfrac1221​. When all items are known to be small, which is typical of memory and storage applications, the guarantee is much better, and this mission is about that refinement: the paper's Theorem 2.3 and its corollary, which determine the asymptotic worst-case ratio of First-Fit and Best-Fit exactly as a function of the largest allowed item size α≤12\alpha\le\tfrac12α≤21​.

Timeline. Ullman (1971) introduced the worst-case analysis of First-Fit with a 1710L∗+3\tfrac{17}{10}L^*+31017​L∗+3 bound. Garey, Graham and Ullman (1972) and Johnson's thesis (MIT, 1973) extended it to Best-Fit and to the decreasing variants. The 1974 SIAM paper collects these results; Theorem 2.3 there is the parametric bound for items of size at most α\alphaα. The additive constants in the unrestricted 1710\tfrac{17}{10}1017​ bound were sharpened over the following four decades, culminating in Dósa and Sgall's proof (2013) that FF(L)≤⌊1710L∗⌋FF(L)\le\lfloor\tfrac{17}{10}L^*\rfloorFF(L)≤⌊1017​L∗⌋.

Setting

A list is a finite sequence L=(a1,…,an)L=(a_1,\dots,a_n)L=(a1​,…,an​) of real numbers in (0,1](0,1](0,1]. Its optimum L∗L^*L∗ is the least number of bins into which the elements of LLL can be placed so that no bin contains numbers whose sum exceeds 111. The level of a bin is the sum of the numbers in it. For a real α>0\alpha>0α>0, write L⊆(0,α]L\subseteq(0,\alpha]L⊆(0,α] when every element of LLL is at most α\alphaα.

First-Fit (FFFFFF) considers bins B1,B2,…B_1,B_2,\dotsB1​,B2​,…, all initially empty, and places a1,a2,…,ana_1,a_2,\dots,a_na1​,a2​,…,an​ in that order: aia_iai​ goes into the bin BjB_jBj​ of least index whose level β\betaβ satisfies β≤1−ai\beta\le 1-a_iβ≤1−ai​. Best-Fit (BFBFBF) is the same except that, among the bins with β≤1−ai\beta\le 1-a_iβ≤1−ai​, it chooses one of largest level β\betaβ (least index among ties). FF(L)FF(L)FF(L) and BF(L)BF(L)BF(L) denote the numbers of nonempty bins at the end.

The restricted worst-case ratios are

RFFα(k)=max⁡{FF(L)L∗:L⊆(0,α], L∗=k},RBFα(k)=max⁡{BF(L)L∗:L⊆(0,α], L∗=k}.R^\alpha_{FF}(k)=\max\Big\{\frac{FF(L)}{L^*}: L\subseteq(0,\alpha],\ L^*=k\Big\},\qquad R^\alpha_{BF}(k)=\max\Big\{\frac{BF(L)}{L^*}: L\subseteq(0,\alpha],\ L^*=k\Big\}.RFFα​(k)=max{L∗FF(L)​:L⊆(0,α], L∗=k},RBFα​(k)=max{L∗BF(L)​:L⊆(0,α], L∗=k}.

Throughout, 0<α≤120<\alpha\le\tfrac120<α≤21​ and m=⌊α−1⌋m=\lfloor\alpha^{-1}\rfloorm=⌊α−1⌋, an integer with m≥2m\ge 2m≥2 and 1m+1<α≤1m\tfrac1{m+1}<\alpha\le\tfrac1mm+11​<α≤m1​.

Formalization targets

Goal: the asymptotic ratio (Corollary of Theorem 2.3, p. 308)

lim⁡k→∞RFFα(k)=lim⁡k→∞RBFα(k)=1+1⌊α−1⌋.\lim_{k\to\infty}R^\alpha_{FF}(k)=\lim_{k\to\infty}R^\alpha_{BF}(k)=1+\frac{1}{\lfloor\alpha^{-1}\rfloor}.k→∞lim​RFFα​(k)=k→∞lim​RBFα​(k)=1+⌊α−1⌋1​.

The goal is stated as a limit, which is the stable form of the result: it is unaffected by any improvement of the additive constants below.

Theorem 2.3(i): the lower bound (p. 307)

For each k≥1k\ge1k≥1 there is a list L⊆(0,α]L\subseteq(0,\alpha]L⊆(0,α] with L∗=kL^*=kL∗=k and FF(L)≥m+1mL∗−1mFF(L)\ge\frac{m+1}{m}L^*-\frac1mFF(L)≥mm+1​L∗−m1​; likewise for BFBFBF.

Two steps of the First-Fit upper bound (p. 308)

If no element of LLL exceeds 1m\frac1mm1​, then in the First-Fit packing every bin except possibly the last contains at least mmm elements, and all but at most two bins have level at least mm+1\frac{m}{m+1}m+1m​.

Theorem 2.3(ii): the upper bounds (p. 307)

For every list L⊆(0,α]L\subseteq(0,\alpha]L⊆(0,α],

FF(L)≤m+1mL∗+2,BF(L)≤m+1mL∗+2.FF(L)\le\frac{m+1}{m}L^*+2,\qquad BF(L)\le\frac{m+1}{m}L^*+2.FF(L)≤mm+1​L∗+2,BF(L)≤mm+1​L∗+2.

Significance

The theorem gives an exact, parametric description of how the worst case of the two greedy rules improves as items shrink: the asymptotic ratio is 32\tfrac3223​ when items are at most 12\tfrac1221​, 43\tfrac4334​ when at most 13\tfrac1331​, and tends to 111 as the maximum item size tends to 000. Combined with the 1710\tfrac{17}{10}1017​ bound for unrestricted lists, it shows that the bad behaviour of First-Fit is caused entirely by items larger than 12\tfrac1221​. Such parametric bounds are the standard way bin-packing heuristics are compared in the literature on online and semi-online packing, and the construction in part (i) is a reusable template for lower-bound lists.

The paper proves the First-Fit upper bound and the lower bound (the verification of the lower-bound construction is left to the reader). The Best-Fit upper bound is stated but not proved: the paper says only that "a similar, but slightly more complicated, argument can be used". A formal proof of the goal therefore requires supplying that argument. None of these results is known to have a machine-checked proof; Mathlib contains no bin-packing development.

Difficulty

For First-Fit the upper bound is a counting argument, but it rests on a property of the run, not of the final packing: an item that went into a later bin did not fit into an earlier bin at the moment it was placed. Turning that into a statement about the final levels requires an invariant maintained through the whole sequence of placements.

The Best-Fit upper bound is harder because that property fails: Best-Fit may put a small item into a fuller, later bin while an earlier, lighter bin still has room, so a light early bin and a light later bin can coexist longer than under First-Fit. The paper gives no argument for this case.

The lower bound requires computing the exact behaviour of both algorithms on a specific interleaved list with item sizes perturbed by powers of mmm, and computing L∗L^*L∗ exactly for that list, which needs a matching lower bound on the optimum.

Formalization scope

A list is L : List ℝ with the hypothesis IsList L (every element in (0,1](0,1](0,1]); L⊆(0,α]L\subseteq(0,\alpha]L⊆(0,α] is the additional hypothesis ∀ a ∈ L, a ≤ α. L∗L^*L∗ is optBins L, a sInf in ℕ over numbers of bins admitting a feasible assignment; the hypothesis IsList makes the set nonempty. The runs ffPack L and bfPack L are folds over the list that keep the nonempty bins in the order they were opened, each with its contents; an item that fits nowhere opens a new bin at the end, which is the paper's "least jjj" over infinitely many empty bins. Comparisons are exact (classical decidability on ℝ), and FF(L)FF(L)FF(L), BF(L)BF(L)BF(L) are the lengths of the final bin lists. mmm is Nat.floor α⁻¹, cast before any division.

The ratios RFFα(k)R^\alpha_{FF}(k)RFFα​(k), RBFα(k)R^\alpha_{BF}(k)RBFα​(k) are suprema taken in ℝ≥0∞: an unbounded family would give +∞+\infty+∞, never a default value, and at k=0k=0k=0 the only admissible list is empty and the value is 000. The goal is a Tendsto … atTop (𝓝 (1 + (⌊α⁻¹⌋₊)⁻¹)) statement in ℝ≥0∞. A real-valued sSup would have returned 000 on an unbounded family and made a false bound look provable; that encoding is ruled out. The upper bounds keep the additive constant 222 and the lower bound the subtractive 1m\frac1mm1​ exactly as printed.

The two proof steps are stated under the proof's own hypothesis "no element exceeding 1/m1/m1/m", which is weaker than L⊆(0,α]L\subseteq(0,\alpha]L⊆(0,α].

A complete development needs invariants of the First-Fit and Best-Fit folds, a lower bound L∗≥∑iaiL^*\ge\sum_i a_iL∗≥∑i​ai​, and exact evaluation of both runs on the construction of part (i). Lemmas about the fold encoding of First-Fit and Best-Fit and about L∗L^*L∗ are reusable in the companion missions on the 1710\tfrac{17}{10}1017​, 119\tfrac{11}{9}911​ and 7160\tfrac{71}{60}6071​ bounds of the same paper. Contributions on the Best-Fit upper bound are especially welcome, since the source gives no proof.

Selected references

  • D. S. Johnson, A. Demers, J. D. Ullman, M. R. Garey, R. L. Graham, Worst-Case Performance Bounds for Simple One-Dimensional Packing Algorithms, SIAM Journal on Computing 3(4):299–325, 1974. https://doi.org/10.1137/0203025
  • J. D. Ullman, The Performance of a Memory Allocation Algorithm, Technical Report 100, Princeton University, 1971.
  • M. R. Garey, R. L. Graham, J. D. Ullman, Worst-Case Analysis of Memory Allocation Algorithms, Proc. 4th ACM Symposium on Theory of Computing, 143–150, 1972. https://doi.org/10.1145/800152.804907
  • D. S. Johnson, Near-Optimal Bin Packing Algorithms, PhD thesis, Massachusetts Institute of Technology, 1973. http://hdl.handle.net/1721.1/57819
  • G. Dósa, J. Sgall, First Fit Bin Packing: A Tight Analysis, Proc. 30th STACS, LIPIcs 20:538–549, 2013. https://doi.org/10.4230/LIPIcs.STACS.2013.538
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CombinatoricsOptimizationTheoretical Computer Science·Captain: mikedeng1

Worst-Case Performance Bounds for Simple One-Dimensional Packing Algorithms 1: First-Fit and Best-Fit Have Asymptotic Worst-Case Ratio 17/10Research Paper

Motivation

Bin packing asks for the fewest unit-capacity bins that hold a given list of item sizes. It is one of the first problems studied through the worst-case analysis of approximation algorithms, and it models storage allocation, paging and file placement on tracks, as well as cutting-stock problems in operations research. Deciding the optimum exactly is NP-hard, so the practical question is how badly simple rules can do. The two simplest on-line rules, First-Fit and Best-Fit, are still the baseline against which every later bin-packing heuristic is measured.

Timeline:

  • 1972. Garey, Graham and Ullman announce that First-Fit uses at most about 1.71.71.7 times the optimal number of bins (Proc. 4th ACM STOC, 1972); Johnson's thesis (MIT, 1973) develops the analysis.
  • 1974. Johnson, Demers, Ullman, Garey and Graham prove FF(L)≤1.7L∗+2FF(L)\le 1.7L^*+2FF(L)≤1.7L∗+2 and BF(L)≤1.7L∗+2BF(L)\le 1.7L^*+2BF(L)≤1.7L∗+2 for every list, and give lists with FF(L)=BF(L)>1.7L∗−8FF(L)=BF(L)>1.7L^*-8FF(L)=BF(L)>1.7L∗−8 for every optimum L∗=kL^*=kL∗=k, so the asymptotic worst-case ratio of both rules is exactly 1710\tfrac{17}{10}1017​ (SIAM J. Comput. 3(4)). This paper is the source of the mission.
  • 1976–2014. The additive constant is lowered: Garey, Graham, Johnson and Yao (1976) show FF(L)≤⌈1.7L∗⌉FF(L)\le\lceil 1.7L^*\rceilFF(L)≤⌈1.7L∗⌉, and Dósa and Sgall prove the tight bound FF(L)≤⌊1.7L∗⌋FF(L)\le\lfloor 1.7L^*\rfloorFF(L)≤⌊1.7L∗⌋ (STACS 2013) and the same bound for Best-Fit (ICALP 2014).

Setting

A list is a finite sequence L=(a1,a2,…,an)L=(a_1,a_2,\dots,a_n)L=(a1​,a2​,…,an​) of real numbers in (0,1](0,1](0,1]; values may repeat. A bin has capacity 111, and its level is the sum of the numbers in it. The optimum L∗L^*L∗ is the minimum number of bins into which the elements of LLL can be placed so that no bin contains numbers whose sum exceeds 111.

Both rules place a1,…,ana_1,\dots,a_na1​,…,an​ in this order into bins B1,B2,…B_1,B_2,\dotsB1​,B2​,…, each initially at level 000, and never move an element once placed.

  1. First-Fit (FF) places aia_iai​ into the bin BjB_jBj​ of least index whose level β\betaβ satisfies β≤1−ai\beta\le 1-a_iβ≤1−ai​.
  2. Best-Fit (BF) places aia_iai​ into a bin whose level β\betaβ satisfies β≤1−ai\beta\le 1-a_iβ≤1−ai​ and is as large as possible, taking the least index among ties.

FF(L)FF(L)FF(L) and BF(L)BF(L)BF(L) are the numbers of nonempty bins at the end. The worst-case ratio at optimum kkk is

RFF(k)=sup⁡{FF(L)L∗:L∗=k},RBF(k)=sup⁡{BF(L)L∗:L∗=k}.R_{FF}(k)=\sup\Bigl\{\frac{FF(L)}{L^*}:L^*=k\Bigr\},\qquad R_{BF}(k)=\sup\Bigl\{\frac{BF(L)}{L^*}:L^*=k\Bigr\}.RFF​(k)=sup{L∗FF(L)​:L∗=k},RBF​(k)=sup{L∗BF(L)​:L∗=k}.

The analysis also uses a weighting function W:[0,1]→[0,1]W:[0,1]\to[0,1]W:[0,1]→[0,1], piecewise linear with W(α)=65αW(\alpha)=\tfrac65\alphaW(α)=56​α on [0,16][0,\tfrac16][0,61​], 95α−110\tfrac95\alpha-\tfrac1{10}59​α−101​ on (16,13](\tfrac16,\tfrac13](61​,31​], 65α+110\tfrac65\alpha+\tfrac1{10}56​α+101​ on (13,12](\tfrac13,\tfrac12](31​,21​] and 111 on (12,1](\tfrac12,1](21​,1], and the coarseness of a bin of a completed packing: the largest 1−level⁡(B′)1-\operatorname{level}(B')1−level(B′) over the bins B′B'B′ of smaller index, and 000 for the first bin.

Formalization targets

Goal: the asymptotic ratio (Corollary of Section 2, p. 306)

lim⁡k→∞RFF(k)=1.7andlim⁡k→∞RBF(k)=1.7.\lim_{k\to\infty}R_{FF}(k)=1.7\qquad\text{and}\qquad\lim_{k\to\infty}R_{BF}(k)=1.7.k→∞lim​RFF​(k)=1.7andk→∞lim​RBF​(k)=1.7.

The goal fixes only the asymptotic ratio and leaves the additive constants free, so it is the statement that survives the later improvements of the constants.

Milestones, in the order the proof uses them

  • Claim 2.2.1 (p. 304): a bin with total size at most 111 has ∑iW(bi)≤1710\sum_i W(b_i)\le\tfrac{17}{10}∑i​W(bi​)≤1017​.
  • Claim 2.2.2 (p. 305): in an FF or BF packing, every element placed into a bin before the bin was more than half full exceeds the bin's coarseness.
  • Claim 2.2.3 (p. 305): a bin of coarseness α<12\alpha<\tfrac12α<21​ whose level exceeds 1−α1-\alpha1−α has weight at least 111.
  • Claim 2.2.4 (p. 306): a bin of coarseness α<12\alpha<\tfrac12α<21​ with weight 1−β1-\beta1−β, β>0\beta>0β>0, either holds a single element at most 12\tfrac1221​ or has level at most 1−α−59β1-\alpha-\tfrac59\beta1−α−95​β.
  • Theorem 2.2 (p. 304): FF(L)≤1.7L∗+2FF(L)\le 1.7L^*+2FF(L)≤1.7L∗+2 and BF(L)≤1.7L∗+2BF(L)\le 1.7L^*+2BF(L)≤1.7L∗+2 for every list.
  • Theorem 2.1 (p. 301): for every k≥1k\ge1k≥1 there is a list with L∗=kL^*=kL∗=k and FF(L)=BF(L)>1.7L∗−8FF(L)=BF(L)>1.7L^*-8FF(L)=BF(L)>1.7L∗−8.

A companion item, not a milestone, records the explicit list of Fig. 3 (p. 307) with L∗=10L^*=10L∗=10 and FF(L)=BF(L)=17FF(L)=BF(L)=17FF(L)=BF(L)=17.

Significance

The result fixes the worst-case behaviour of the two simplest bin-packing heuristics: neither ever uses more than about 70%70\%70% more bins than an optimal packing, and both can be forced to. The weighting-function technique introduced for this bound became the standard method for analysing bin-packing heuristics, including First-Fit Decreasing, Harmonic-type algorithms and on-line lower bounds, and the constant 1710\tfrac{17}{10}1017​ is the reference point for later on-line algorithms.

The theorem is proved, and its constants have since been sharpened. No machine-checked proof of any of these results is known. This mission produces a Lean model of on-line bin packing (the optimum, the First-Fit and Best-Fit runs with their placement history, and the worst-case ratio) that the other missions of this paper and later bin-packing formalizations can reuse. It also produces formal proofs of the weighting-function bounds, of the 1.7L∗+21.7L^*+21.7L∗+2 upper bound and of the lower-bound construction.

Difficulty

The first idea, charging each bin its level, gives only FF(L)≤2L∗+1FF(L)\le 2L^*+1FF(L)≤2L∗+1: at most one bin is at most half full. The ratio 1710\tfrac{17}{10}1017​ comes from bins that are more than half full but far from full, and a bound on the total size of the elements cannot see them. No property of the final packing alone suffices: the bins that are far from full can only be controlled through the order in which the rule opened and filled them, so the argument depends on the dynamics of the run. On the lower-bound side, the natural periodic list (sizes near 16,13,12\tfrac16,\tfrac13,\tfrac1261​,31​,21​, p. 301) gives only the ratio 53\tfrac5335​; reaching 1710\tfrac{17}{10}1017​ needs a list on which both rules waste space in every medium bin, for every kkk, while L∗L^*L∗ is still known exactly.

Formalization scope

A list is L : List ℝ with the hypothesis IsList L (every element in (0,1](0,1](0,1]), and every statement assumes it. L∗L^*L∗ is optBins L, the least b : ℕ for which some assignment Fin L.length → Fin b has every bin sum at most 111. A run is a fold over the list that keeps only the nonempty bins, in index order, each with its contents in placement order. A new bin is opened at the end exactly when no nonempty bin fits, which is the paper's "least jjj" over infinitely many initially empty bins, since elements are positive. The fit test is the non-strict β+ai≤1\beta+a_i\le1β+ai​≤1, and Best-Fit breaks ties by least index. The placement history (the bin chosen for each element and that bin's level just before) is read off the run on the prefix of the list. Indices are 000-based. Coarseness is computed in the completed packing. WWW is a function ℝ → ℝ and is only ever applied to elements of (0,1](0,1](0,1]. RFF(k)R_{FF}(k)RFF​(k) and RBF(k)R_{BF}(k)RBF​(k) are suprema in the extended nonnegative reals [0,∞][0,\infty][0,∞], and the limit is taken there.

A real-valued supremum would be 000 on an empty or unbounded family, and the limit statement would then say nothing about the algorithms. The extended-real supremum rules this trivialization out. Every claim is stated for the concrete First-Fit run and the concrete Best-Fit run, not for an abstract rule with the properties used in the proof.

Claim 2.2.4 is printed with alternative (i) "m=1m=1m=1 and b1<12b_1<\tfrac12b1​<21​", which is false: First-Fit on (0.6,0.5)(0.6,0.5)(0.6,0.5) gives a counterexample. The mission states it with b1≤12b_1\le\tfrac12b1​≤21​, which is what the paper's proof establishes and what the main proof uses. The milestone text keeps the printed version.

The model definitions are reusable for any on-line bin-packing rule, since the run is parameterized by the choice rule. Contributions welcome: proofs of the milestones, general lemmas about the runs (levels stay at most 111, at most one bin is at most half full, the history determines the final packing), and the computation of L∗L^*L∗ for the explicit lists of Theorem 2.1 and Fig. 3.

Selected references

  • D. S. Johnson, A. Demers, J. D. Ullman, M. R. Garey, R. L. Graham, Worst-Case Performance Bounds for Simple One-Dimensional Packing Algorithms, SIAM Journal on Computing 3(4):299–325, 1974. https://doi.org/10.1137/0203025
  • M. R. Garey, R. L. Graham, J. D. Ullman, Worst-case analysis of memory allocation algorithms, Proc. 4th ACM STOC, 1972.
  • D. S. Johnson, Near-Optimal Bin Packing Algorithms, PhD thesis, MIT, 1973.
  • M. R. Garey, R. L. Graham, D. S. Johnson, A. C. Yao, Resource constrained scheduling as generalized bin packing, J. Combinatorial Theory Ser. A 21, 1976.
  • G. Dósa, J. Sgall, First Fit bin packing: A tight analysis, STACS 2013, LIPIcs 20:538–549. https://doi.org/10.4230/LIPIcs.STACS.2013.538
  • G. Dósa, J. Sgall, Optimal analysis of Best Fit bin packing, ICALP 2014, LNCS 8572.
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Bandit AlgorithmsMachine LearningProbability·Captain: mikedeng1

Stochastic Linear Optimization under Bandit Feedback 1: The Regret Bound of ConfidenceBallResearch Paper

Motivation

In stochastic linear optimization under bandit feedback a learner repeatedly chooses a decision xtx_txt​ from a fixed set D⊆RnD\subseteq\mathbb R^nD⊆Rn and observes only the noisy cost of that one decision, whose expectation is a fixed but unknown linear function μ⊤xt\mu^\top x_tμ⊤xt​. The model covers online routing, ad and product selection with feature vectors, and any sequential decision problem whose decision set is too large to enumerate but whose expected cost is linear in a known representation. The multi-armed bandit is the special case where DDD is the set of standard basis vectors.

Dani, Hayes and Kakade (COLT 2008) analysed the algorithm ConfidenceBall₂, a generalization of Auer's LinRel (JMLR 2002), and proved that its regret is O∗(nT)O^*(n\sqrt T)O∗(nT​) with high probability for an arbitrary compact decision set, and that this is optimal up to logarithmic factors. Their confidence-ellipsoid construction became the template for later linear bandit algorithms (OFUL, LinUCB), and the ellipsoid-plus-potential analysis is the standard argument of the field (Lattimore and Szepesvári, Bandit Algorithms, Chapters 19–20).

Timeline: Auer (2002) introduced LinRel for finite decision sets; Dani, Hayes and Kakade (2008) extended it to arbitrary compact sets with the O∗(nT)O^*(n\sqrt T)O∗(nT​) bound and a matching Ω(nT)\Omega(n\sqrt T)Ω(nT​) lower bound; Rusmevichientong and Tsitsiklis (Math. Oper. Res. 2010) studied linearly parameterized bandits with dimension-dependent regret bounds; Abbasi-Yadkori, Pál and Szepesvári (NeurIPS 2011) sharpened the confidence ellipsoids with self-normalized martingale bounds.

Setting

Fix n≥1n\ge1n≥1 and a compact decision set D⊆RnD\subseteq\mathbb R^nD⊆Rn whose standard basis e1,…,ene_1,\dots,e_ne1​,…,en​ is a barycentric spanner: each ei∈De_i\in Dei​∈D and every x∈Dx\in Dx∈D lies in the cube [−1,1]n[-1,1]^n[−1,1]n. The paper's Section 5 adopts these coordinates without loss of generality. An unknown vector μ∈Rn\mu\in\mathbb R^nμ∈Rn satisfies ∣μ⊤x∣≤1|\mu^\top x|\le1∣μ⊤x∣≤1 for x∈Dx\in Dx∈D, and x∗∈Dx^*\in Dx∗∈D minimises μ⊤x\mu^\top xμ⊤x.

On round t=1,2,…t=1,2,\dotst=1,2,… the learner plays xt∈Dx_t\in Dxt​∈D, measurable with respect to the information Ft\mathcal F_tFt​ before round ttt, and observes a loss ℓt∈[−1,1]\ell_t\in[-1,1]ℓt​∈[−1,1] with E[ℓt∣Ft]=μ⊤xt\mathbb E[\ell_t\mid\mathcal F_t]=\mu^\top x_tE[ℓt​∣Ft​]=μ⊤xt​. The regret after TTT rounds is

RT=∑t=1T(μ⊤xt−μ⊤x∗).R_T=\sum_{t=1}^T\big(\mu^\top x_t-\mu^\top x^*\big).RT​=t=1∑T​(μ⊤xt​−μ⊤x∗).

ConfidenceBall₂(D,δ)(D,\delta)(D,δ) maintains the design matrix At=I+∑τ<txτxτ⊤A_t=I+\sum_{\tau<t}x_\tau x_\tau^\topAt​=I+∑τ<t​xτ​xτ⊤​, the least-squares estimate μ^t=At−1∑τ<tℓτxτ\hat\mu_t=A_t^{-1}\sum_{\tau<t}\ell_\tau x_\tauμ^​t​=At−1​∑τ<t​ℓτ​xτ​, the radius

βt=max⁡(128 nln⁡tln⁡(t2/δ), (83ln⁡(t2/δ))2),\beta_t=\max\Big(128\,n\ln t\ln(t^2/\delta),\ \big(\tfrac83\ln(t^2/\delta)\big)^2\Big),βt​=max(128nlntln(t2/δ), (38​ln(t2/δ))2),

and the confidence ellipsoid Bt2={ν:(ν−μ^t)⊤At(ν−μ^t)≤βt}B^2_t=\{\nu:(\nu-\hat\mu_t)^\top A_t(\nu-\hat\mu_t)\le\beta_t\}Bt2​={ν:(ν−μ^​t​)⊤At​(ν−μ^​t​)≤βt​}. It plays the optimistic decision xt∈argmin⁡x∈Dmin⁡ν∈Bt2ν⊤xx_t\in\operatorname{argmin}_{x\in D}\min_{\nu\in B^2_t}\nu^\top xxt​∈argminx∈D​minν∈Bt2​​ν⊤x. The analysis uses the width wt=xt⊤At−1xtw_t=\sqrt{x_t^\top A_t^{-1}x_t}wt​=xt⊤​At−1​xt​​, the error Zt=(μ^t−μ)⊤At(μ^t−μ)Z_t=(\hat\mu_t-\mu)^\top A_t(\hat\mu_t-\mu)Zt​=(μ^​t​−μ)⊤At​(μ^​t​−μ), and the noise ηt=ℓt−μ⊤xt\eta_t=\ell_t-\mu^\top x_tηt​=ℓt​−μ⊤xt​.

Formalization targets

Goal: Theorem 2, ConfidenceBall₂ bullet (corrected)

For 0<δ<10<\delta<10<δ<1 with n≤β1n\le\beta_1n≤β1​ and noise ∣ηt∣≤1|\eta_t|\le1∣ηt​∣≤1,

Pr⁡(∀T≥1, RT≤8nTβTln⁡(T+1))≥1−δ.\Pr\Big(\forall T\ge1,\ R_T\le\sqrt{8nT\beta_T\ln(T+1)}\Big)\ge1-\delta.Pr(∀T≥1, RT​≤8nTβT​ln(T+1)​)≥1−δ.

A single event covers every horizon, so the bound is anytime.

Milestones

  • Lemma 8. If μ∈Bt2\mu\in B^2_tμ∈Bt2​ then rt≤2min⁡(βtwt,1)r_t\le2\min(\sqrt{\beta_t}w_t,1)rt​≤2min(βt​​wt​,1).
  • Lemma 10. det⁡At+1=∏τ=1t(1+wτ2)\det A_{t+1}=\prod_{\tau=1}^t(1+w_\tau^2)detAt+1​=∏τ=1t​(1+wτ2​).
  • Lemma 9 (corrected). ∑τ=1tmin⁡(wτ2,1)≤2nln⁡(t+1)\sum_{\tau=1}^t\min(w_\tau^2,1)\le2n\ln(t+1)∑τ=1t​min(wτ2​,1)≤2nln(t+1).
  • Theorem 6 (corrected). If μ∈Bt2\mu\in B^2_tμ∈Bt2​ for all t≤Tt\le Tt≤T, then ∑t≤Trt2≤8nβTln⁡(T+1)\sum_{t\le T}r_t^2\le8n\beta_T\ln(T+1)∑t≤T​rt2​≤8nβT​ln(T+1).
  • Theorem 4 (Freedman). Pr⁡(∑Xi≥a, V≤v)≤exp⁡(−a2/(2v+2ab/3))\Pr(\sum X_i\ge a,\ V\le v)\le\exp(-a^2/(2v+2ab/3))Pr(∑Xi​≥a, V≤v)≤exp(−a2/(2v+2ab/3)) for martingale differences bounded above by bbb.
  • Lemma 12. Zt≤n+2∑τ<tητxτ⊤(μ^τ−μ)1+wτ2+∑τ<tητ2wτ21+wτ2Z_t\le n+2\sum_{\tau<t}\eta_\tau\frac{x_\tau^\top(\hat\mu_\tau-\mu)}{1+w_\tau^2}+\sum_{\tau<t}\eta_\tau^2\frac{w_\tau^2}{1+w_\tau^2}Zt​≤n+2∑τ<t​ητ​1+wτ2​xτ⊤​(μ^​τ​−μ)​+∑τ<t​ητ2​1+wτ2​wτ2​​.
  • Lemma 14. Pr⁡(∀t, ∑τ<tMτ≤βt/2)≥1−δ\Pr(\forall t,\ \sum_{\tau<t}M_\tau\le\beta_t/2)\ge1-\deltaPr(∀t, ∑τ<t​Mτ​≤βt​/2)≥1−δ.
  • Theorem 5 (Confidence). Pr⁡(∀t, μ∈Bt2)≥1−δ\Pr(\forall t,\ \mu\in B^2_t)\ge1-\deltaPr(∀t, μ∈Bt2​)≥1−δ.

Significance

The result gives a regret bound for linear bandits over an arbitrary compact decision set that depends on the dimension nnn rather than on ∣D∣|D|∣D∣, holds uniformly over horizons, and requires no gap between the best and second-best decision. With the paper's lower bound it shows that the price of bandit feedback, compared with full information, is a factor Θ∗(n)\Theta^*(\sqrt n)Θ∗(n​). The two components, a confidence theorem for a least-squares ellipsoid under martingale noise and a deterministic potential argument on log⁡det⁡At\log\det A_tlogdetAt​, are reused in the analysis of most optimistic linear and generalized-linear bandit algorithms.

The theorem has a published proof but, to our knowledge, no machine-checked one. The platform already has the elliptical potential lemma (BanditAlgorithm.elliptical_potential_lemma, Lattimore–Szepesvári Lemma 19.4), the matrix determinant lemma and the Woodbury identity, which cover the linear-algebra layer; the LinUCB regret theorem there (BanditAlgorithm.linear_bandit_linucb_regret_bound) is pathwise given confidence, for a different algorithm, so the probabilistic half is new. Formalization also settles the printed constants, three of which need correction (below).

Difficulty

The deterministic half is linear algebra. The difficulty is the confidence theorem. Hoeffding–Azuma applied to ∑τMτ\sum_\tau M_\tau∑τ​Mτ​ would need a deterministic step bound, and the natural one gives only a T3/4T^{3/4}T3/4 regret. The step sizes of MtM_tMt​ are bounded in terms of the random widths wtw_twt​, so the argument must control the conditional variances pathwise and apply Freedman's inequality, whose event {V≤v}\{V\le v\}{V≤v} is random. The escape indicator EtE_tEt​, which switches the martingale off after the first failure of confidence, is what makes the variance bound hold on every path, and the induction that turns Lemma 14 into Theorem 5 must be carried out on a single event for all ttt simultaneously. Freedman's inequality itself is not in Mathlib.

Formalization scope

Vectors are Fin n → ℝ, matrices Matrix (Fin n) (Fin n) ℝ, rounds are indexed t=1,2,…t=1,2,\dotst=1,2,… in ℕ. The spanner is the standard basis, as in Section 5 of the paper (the algorithm is equivariant under the linear change of coordinates). The probability model is a probability space with a general filtration (Ft)(\mathcal F_t)(Ft​); xtx_txt​ is Ft\mathcal F_tFt​-measurable and ℓt\ell_tℓt​ is Ft+1\mathcal F_{t+1}Ft+1​-measurable. The argmin is encoded as a joint minimiser over D×Bt2D\times B^2_tD×Bt2​, which admits every tie-break and is required on every outcome; measurability of xtx_txt​ is a hypothesis, not derived from the selection. The optimum x∗x^*x∗ is a hypothesis (x∗∈Dx^*\in Dx∗∈D, minimising), not an sInf.

Corrections of the printed statements, each labelled in the item's Formalization Note:

  1. ln⁡(T+1)\ln(T+1)ln(T+1) for ln⁡T\ln TlnT in Lemma 9, Theorem 6 and Theorem 2. The printed bounds are false at T=1T=1T=1 (with n=1n=1n=1, D=[−1,1]D=[-1,1]D=[−1,1], μ>0\mu>0μ>0, the tie-break x1=1x_1=1x1​=1 gives R1=2μ>0R_1=2\mu>0R1​=2μ>0 against a bound of 000); the proof of Lemma 9 gives 2ln⁡det⁡At+1≤2nln⁡(t+1)2\ln\det A_{t+1}\le2n\ln(t+1)2lndetAt+1​≤2nln(t+1).
  2. n≤β1=(83ln⁡(1/δ))2n\le\beta_1=(\tfrac83\ln(1/\delta))^2n≤β1​=(38​ln(1/δ))2 is added to Theorems 5 and 2: the proof of Theorem 5 claims Z1≤n<β1Z_1\le n<\beta_1Z1​≤n<β1​, which fails for δ\deltaδ near 111. Theorem 6 takes the proof's "1<β11<\beta_11<β1​" as the hypothesis β1≥1\beta_1\ge1β1​≥1.
  3. ∣ℓt−μ⊤xt∣≤1|\ell_t-\mu^\top x_t|\le1∣ℓt​−μ⊤xt​∣≤1 is added to Lemma 14, Theorems 5 and 2: Section 5.2 uses ∣ηt∣≤1|\eta_t|\le1∣ηt​∣≤1, while the model gives only ∣ηt∣≤2|\eta_t|\le2∣ηt​∣≤2. It holds when costs lie in [0,1][0,1][0,1].
  4. Theorem 5's "δ>0\delta>0δ>0" is stated with 0<δ<10<\delta<10<δ<1; Lemma 10's index typo (wtw_twt​ for wτw_\tauwτ​) and Theorem 4's ∑i=1n\sum_{i=1}^n∑i=1n​ (for TTT) are corrected.

A regret bound for an arbitrary decision sequence under the assumption μ∈Bt2\mu\in B^2_tμ∈Bt2​ for all ttt is Theorem 6, not the goal; the goal carries the ConfidenceBall₂ selection rule, the conditional-mean and measurability hypotheses, and δ\deltaδ as the algorithm's own parameter. The hypotheses are jointly satisfiable, for example by a finite DDD with a fixed tie-break and i.i.d. costs in [0,1][0,1][0,1].

Needed infrastructure: Freedman's inequality for a filtration (reusable across all of bandit theory), the potential lemma (available), and measurability of the algorithm's statistics. Contributions of alternative proofs of Theorem 5, for example via self-normalized bounds, are welcome.

Selected references

  • V. Dani, T. P. Hayes, S. M. Kakade, Stochastic Linear Optimization under Bandit Feedback, COLT 2008. http://colt2008.cs.helsinki.fi/papers/80-Dani.pdf
  • P. Auer, Using Confidence Bounds for Exploitation-Exploration Trade-offs, JMLR 3, 2002. https://www.jmlr.org/papers/v3/auer02a.html
  • D. A. Freedman, On Tail Probabilities for Martingales, Annals of Probability 3(1), 1975. https://doi.org/10.1214/aop/1176996452
  • B. Awerbuch, R. Kleinberg, Adaptive Routing with End-to-End Feedback, STOC 2004. https://doi.org/10.1145/1007352.1007367
  • P. Rusmevichientong, J. N. Tsitsiklis, Linearly Parameterized Bandits, Mathematics of Operations Research 35(2), 2010. https://doi.org/10.1287/moor.1100.0446
  • Y. Abbasi-Yadkori, D. Pál, Cs. Szepesvári, Improved Algorithms for Linear Stochastic Bandits, NeurIPS 2011. https://arxiv.org/abs/1102.2670
  • T. Lattimore, Cs. Szepesvári, Bandit Algorithms, Cambridge University Press, 2020. https://doi.org/10.1017/9781108571401
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CombinatoricsOptimizationProbability+1·Captain: mikedeng1

Approximation Techniques for Average Completion Time Scheduling I: Best-α on One Machine with Release DatesResearch Paper

Motivation

Minimizing the average completion time of jobs that arrive over time is one of the basic objectives of machine scheduling: it measures how long, on average, a job waits in the system. On a single machine with release dates and no preemption (written 1∣rj∣∑Cj1|r_j|\sum C_j1∣rj​∣∑Cj​), the problem is strongly NP-hard, so research has focused on approximation algorithms whose guarantees are stated against every feasible schedule.

The standard route runs through the preemptive relaxation. When jobs may be interrupted and resumed, the shortest-remaining-processing-time rule (SRPT) produces an optimal schedule, and its value is a lower bound for every nonpreemptive schedule. The question is how to turn that preemptive schedule into a nonpreemptive one without losing too much.

Timeline:

  • 1995, Phillips, Stein and Wein (WADS 1995, pp. 86–97): order the jobs by their SRPT completion times and schedule them nonpreemptively in that order. This gives a 2-approximation. Later 2-approximations are by Hoogeveen and Vestjens (IPCO 1996), Stougie (1995), and Goemans (SODA 1997). Hoogeveen and Vestjens also showed that deterministic on-line algorithms cannot beat 2.
  • 2001, Chekuri, Motwani, Natarajan and Stein (SIAM J. Comput. 31(1)): order by α\alphaα-points instead of completion times, choose α\alphaα at random, and take the best α\alphaα off-line. This gives the e/(e−1)≈1.58e/(e-1)\approx1.58e/(e−1)≈1.58 bound for Best-α\alphaα that is the goal of this mission, and an optimal randomized on-line algorithm.
  • 1999, Afrati et al. (FOCS 1999): a polynomial-time approximation scheme for 1∣rj∣∑wjCj1|r_j|\sum w_jC_j1∣rj​∣∑wj​Cj​. This settled the approximability of the problem, but the resulting algorithms are far from simple.

Setting

An instance has nnn jobs J0,…,Jn−1J_0,\dots,J_{n-1}J0​,…,Jn−1​. Job JjJ_jJj​ has a processing time pj>0p_j>0pj​>0, a release date rj≥0r_j\ge0rj​≥0, and, where the objective is weighted, a weight wj>0w_j>0wj​>0. There is one machine.

A nonpreemptive schedule assigns each job a start time Sj≥rjS_j\ge r_jSj​≥rj​ such that the intervals [Sj,Sj+pj)[S_j,S_j+p_j)[Sj​,Sj​+pj​) are pairwise disjoint. Its completion times are Cj=Sj+pjC_j=S_j+p_jCj​=Sj​+pj​.

A preemptive schedule PPP specifies, for each time ttt, which job runs at ttt, if any. Job JjJ_jJj​ runs only at times t≥max⁡(0,rj)t\ge\max(0,r_j)t≥max(0,rj​), receives exactly pjp_jpj​ units of processing in total, and finishes by some finite time. Its completion time CjPC^P_jCjP​ is the first time by which all of JjJ_jJj​ has been processed. For α∈(0,1]\alpha\in(0,1]α∈(0,1], its α\alphaα-point CjP(α)C^P_j(\alpha)CjP​(α) is the first time by which αpj\alpha p_jαpj​ units have been processed.

For a job JiJ_iJi​, TiT_iTi​ denotes the idle time of PPP before CiPC^P_iCiP​. xijx_{ij}xij​ denotes the fraction of JjJ_jJj​ processed before CiPC^P_iCiP​. The paper writes SiP(β)S^P_i(\beta)SiP​(β) for the set of jobs with xij=βx_{ij}=\betaxij​=β, and also for their total processing time.

One-machine list scheduling in a given order runs the jobs nonpreemptively in that order. Each job starts at the later of its release date and the completion of the previous job in the list. An α\alphaα-schedule is list scheduling in nondecreasing order of the α\alphaα-points CjP(α)C^P_j(\alpha)CjP​(α). CjαC^\alpha_jCjα​ denotes the completion times of an α\alphaα-schedule.

Random-α\alphaα draws α\alphaα from a distribution on (0,1](0,1](0,1] and outputs the α\alphaα-schedule. Best-α\alphaα outputs the α\alphaα-schedule of smallest total completion time min⁡α∑jCjα\min_\alpha\sum_j C^\alpha_jminα​∑j​Cjα​.

Formalization targets

Goal: Corollary 2.7

Let PPP be optimal among preemptive schedules for ∑jCj\sum_j C_j∑j​Cj​. Then there is α∈(0,1]\alpha\in(0,1]α∈(0,1] such that every α\alphaα-schedule derived from PPP satisfies

∑jCjα  ≤  ee−1∑jCjfor every feasible nonpreemptive schedule (Cj)j.\sum_j C^\alpha_j\;\le\;\frac{e}{e-1}\sum_j C_j\qquad\text{for every feasible nonpreemptive schedule } (C_j)_j .j∑​Cjα​≤e−1e​j∑​Cj​for every feasible nonpreemptive schedule (Cj​)j​.

Since Best-α\alphaα returns a schedule no worse than this α\alphaα-schedule, Best-α\alphaα is an e/(e−1)e/(e-1)e/(e−1)-approximation.

Milestones

  1. The calculus behind the constant. For f(α)=eα/(e−1)f(\alpha)=e^\alpha/(e-1)f(α)=eα/(e−1) and every β∈(0,1]\beta\in(0,1]β∈(0,1],
∫0β1+α−ββf(α) dα=1e−1.\int_0^\beta\frac{1+\alpha-\beta}{\beta}f(\alpha)\,d\alpha=\frac1{e-1}.∫0β​β1+α−β​f(α)dα=e−11​.
  1. Lemma 2.2: CiP=Ti+∑0<β≤1βSiP(β)C^P_i=T_i+\sum_{0<\beta\le1}\beta S^P_i(\beta)CiP​=Ti​+∑0<β≤1​βSiP​(β).
  2. Lemma 2.3: Ciα≤Ti+(1+α)∑β≥αSiP(β)+∑β<αβSiP(β)C^\alpha_i\le T_i+(1+\alpha)\sum_{\beta\ge\alpha}S^P_i(\beta)+\sum_{\beta<\alpha}\beta S^P_i(\beta)Ciα​≤Ti​+(1+α)∑β≥α​SiP​(β)+∑β<α​βSiP​(β).
  3. Lemma 2.5: if α\alphaα has density fff on (0,1](0,1](0,1], then E[Ciα]≤(1+δ)CiPE[C^\alpha_i]\le(1+\delta)C^P_iE[Ciα​]≤(1+δ)CiP​ with δ=max⁡0<β≤1∫0β1+α−ββf(α) dα\delta=\max_{0<\beta\le1}\int_0^\beta\frac{1+\alpha-\beta}{\beta}f(\alpha)\,d\alphaδ=max0<β≤1​∫0β​β1+α−β​f(α)dα.
  4. Theorem 2.6, for the weighted objective with PPP optimal among preemptive schedules: the expected approximation ratio of Random-α\alphaα is at most 222 for uniform α\alphaα, at most 1.81.81.8 for α=1\alpha=1α=1 w.p. 3/53/53/5 and α=1/2\alpha=1/2α=1/2 w.p. 2/52/52/5, and at most e/(e−1)e/(e-1)e/(e−1) for the density eα/(e−1)e^\alpha/(e-1)eα/(e−1).

Companion statements, not milestones:

  • the upper bound of Theorem 2.1, ∑jCjα≤(1+1/α)∑jCjP\sum_jC^\alpha_j\le(1+1/\alpha)\sum_jC^P_j∑j​Cjα​≤(1+1/α)∑j​CjP​;
  • the existence of an optimal preemptive schedule.

Significance

The e/(e−1)e/(e-1)e/(e−1) bound shows that conversion from the preemptive relaxation can beat the factor 2 of the natural ordering. It does so by exploiting that no single instance is bad for many values of α\alphaα at once. The α\alphaα-point technique was also used with LP relaxations, for example by Goemans (SODA 1997) and by Schulz and Skutella. The randomized version is an optimal randomized on-line algorithm for 1∣rj∣∑Cj1|r_j|\sum C_j1∣rj​∣∑Cj​. Lemma 2.3 is a statement about any preemptive schedule, so it applies wherever a good preemptive or fractional schedule is available.

All results of the mission are proved in the paper, except that the proof of Theorem 2.6, part 2 is omitted there. No machine-checked proof of them is known. A complete development would give a verified model of preemptive one-machine schedules, α\alphaα-points and list scheduling, together with the averaging argument over α\alphaα. These are reusable for the later results of the same paper and for the α\alphaα-point literature.

Difficulty

The obvious argument bounds each job's α\alphaα-schedule completion time directly against its preemptive completion time. That argument loses a factor 1+1/α1+1/\alpha1+1/α (Theorem 2.1), which is at least 2 for every fixed α\alphaα. The improvement needs Lemma 2.3. There the charge to each job depends on how much of it was done by CiPC^P_iCiP​ relative to α\alphaα, and the idle time TiT_iTi​ is not inflated at all. Proving Lemma 2.3 requires reasoning about a preemptive schedule as a measure on time, and about how moving pieces of jobs changes completion times. A proof that treats the preemptive schedule as a finite list of pieces must first show that nothing is lost by this discretization.

The averaging step needs the expectation over α\alphaα to be an honest integral. The map α↦Ciα\alpha\mapsto C^\alpha_iα↦Ciα​ must be shown integrable, which requires a fixed rule for ties between equal α\alphaα-points.

Formalization scope

  • Model. Jobs are Fin n, time is real, pj>0p_j>0pj​>0 and rj≥0r_j\ge0rj​≥0. The paper admits pj=0p_j=0pj​=0 only in its tightness instances.
    • A preemptive schedule is a function σ:R→\sigma:\mathbb R\toσ:R→ Option (Fin n) (none = idle). Each job's run set is measurable, lies in [max⁡(0,rj),∞)[\max(0,r_j),\infty)[max(0,rj​),∞), is bounded above, and has Lebesgue measure pjp_jpj​.
    • Completion times and α\alphaα-points are infima of nonempty sets that are bounded below.
    • TiT_iTi​ is the measure of the idle set in [0,CiP)[0,C^P_i)[0,CiP​).
    • The paper's sums over β\betaβ are sums over jobs, weighted by the fraction xijx_{ij}xij​.
  • List scheduling is strict: jobs never overtake the list order, and the machine is free from time 000.
    • Lemma 2.3, Theorem 2.1, Theorem 2.6.2 and the goal hold for every tie-break among equal α\alphaα-points.
    • The expectations (Lemma 2.5, Theorem 2.6.1 and 2.6.3) use the tie-break by job index. They assert integrability as part of the conclusion.
  • Optimality. "Approximation ratio ccc" is stated as an inequality against every feasible nonpreemptive schedule, never against an infimum.
    • The optimality of PPP among preemptive schedules is the paper's standing assumption for its upper bounds (p. 151). It appears as a hypothesis of Theorem 2.6 and of the goal.
    • The lemmas hold for arbitrary PPP and do not carry it.
    • An existence statement shows the hypothesis can be met.
  • Lemma 2.5's δ\deltaδ is replaced by any upper bound of the integrals over β∈(0,1]\beta\in(0,1]β∈(0,1]. This is equivalent, and it avoids assuming that the maximum is attained.
  • Not stated:
    • the running time O(n2)O(n^2)O(n2) of Best-α\alphaα and the optimality of SRPT;
    • the tightness parts of Theorem 2.1 and Corollary 2.4, and the lower bounds of Theorem 2.9, which use zero-length jobs;
    • the on-line Theorem 2.8, which needs a model of on-line algorithms.
  • Trivializing formalization ruled out. Dropping the optimality of PPP from the goal would turn it into a statement about arbitrary preemptive schedules, which is Lemma 2.5, not Corollary 2.7. Comparing against ∑jCjP\sum_jC^P_j∑j​CjP​ instead of every nonpreemptive schedule would likewise remove the content of the corollary.

Contributions are welcome at every level. The calculus milestone and Lemma 2.2 are good first targets.

Selected references

  • C. Chekuri, R. Motwani, B. Natarajan, C. Stein, Approximation Techniques for Average Completion Time Scheduling, SIAM J. Comput. 31(1):146–166, 2001. https://doi.org/10.1137/S0097539797327180
  • C. Phillips, C. Stein, J. Wein, Scheduling jobs that arrive over time, Proc. 4th Workshop on Algorithms and Data Structures (WADS), 1995, pp. 86–97 (reference [25] of the paper; no link verified).
  • J. A. Hoogeveen, A. P. A. Vestjens, Optimal on-line algorithms for single-machine scheduling, Proc. 5th IPCO, 1996, pp. 404–414 (reference [21]; no link verified).
  • M. X. Goemans, Improved approximation algorithms for scheduling with release dates, Proc. 8th ACM-SIAM SODA, 1997, pp. 591–598 (reference [12]; no link verified).
  • F. Afrati et al., Approximation schemes for minimizing average weighted completion time with release dates, Proc. 40th FOCS, 1999 (reference [2]; no link verified).
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Generalization Bounds in the Predict-then-Optimize Framework II: Margin-Based Generalization Bound for the SPO Loss under the Strength PropertyResearch Paper

Motivation

In the predict-then-optimize paradigm a model first predicts the cost vector of a linear optimization problem from contextual features, and the prediction is then fed to an optimization solver that returns a decision. Examples include routing with predicted travel times and portfolio choice with predicted returns. The quality of a prediction is judged by the decision it produces. The Smart Predict-then-Optimize (SPO) loss of Elmachtoub and Grigas (Management Science 2022) measures exactly that: the excess cost of acting on the prediction instead of on the true cost vector.

El Balghiti, Elmachtoub, Grigas and Tewari (arXiv:1905.11488v3) ask when a model with small empirical SPO loss also has small expected SPO loss. The SPO loss is non-convex and discontinuous, so standard Lipschitz-contraction arguments do not apply to it directly. Their Section 4 introduces a margin version of the SPO loss, in the spirit of the margin theory of Koltchinskii and Panchenko (Ann. Statist. 2002) for classification. They show that it is Lipschitz under a geometric condition on the feasible region, and derive a generalization bound in terms of the multivariate Rademacher complexity of the hypothesis class. This mission formalizes that bound.

Setting

Decisions live in Rd\mathbb R^dRd with a norm ∥⋅∥\|\cdot\|∥⋅∥; cost vectors are linear functionals with the dual norm ∥c∥∗=max⁡∥w∥≤1c⊤w\|c\|_*=\max_{\|w\|\le1}c^\top w∥c∥∗​=max∥w∥≤1​c⊤w. The feasible region S⊆RdS\subseteq\mathbb R^dS⊆Rd is nonempty, compact and convex, and throughout Section 4 it is not a singleton. An optimization oracle w∗w^*w∗ maps each cost vector ccc to some minimizer w∗(c)∈arg⁡min⁡w∈Sc⊤ww^*(c)\in\arg\min_{w\in S}c^\top ww∗(c)∈argminw∈S​c⊤w. The SPO loss of a prediction c^\hat cc^ against the realized cost ccc is

ℓSPO(c^,c)=c⊤w∗(c^)−c⊤w∗(c),\ell_{\rm SPO}(\hat c,c)=c^\top w^*(\hat c)-c^\top w^*(c),ℓSPO​(c^,c)=c⊤w∗(c^)−c⊤w∗(c),

and the linear optimization gap is ωS(c)=max⁡w∈Sc⊤w−min⁡w∈Sc⊤w\omega_S(c)=\max_{w\in S}c^\top w-\min_{w\in S}c^\top wωS​(c)=maxw∈S​c⊤w−minw∈S​c⊤w, with ωS(C)=sup⁡c∈CωS(c)\omega_S(\mathcal C)=\sup_{c\in\mathcal C}\omega_S(c)ωS​(C)=supc∈C​ωS​(c) and ρ2(C)=sup⁡c∈C∥c∥2\rho_2(\mathcal C)=\sup_{c\in\mathcal C}\|c\|_2ρ2​(C)=supc∈C​∥c∥2​ for the set C\mathcal CC of possible true costs.

A cost vector is degenerate if min⁡w∈Sc^⊤w\min_{w\in S}\hat c^\top wminw∈S​c^⊤w has more than one optimal solution; C∘\mathcal C^\circC∘ is the set of degenerate costs. The distance to degeneracy is νS(c^)=inf⁡c∈C∘∥c−c^∥∗\nu_S(\hat c)=\inf_{c\in\mathcal C^\circ}\|c-\hat c\|_*νS​(c^)=infc∈C∘​∥c−c^∥∗​. The region SSS has the strength property with parameter μ>0\mu>0μ>0 if

c^⊤(w−w∗(c^))≥μ νS(c^)2 ∥w−w∗(c^)∥2for all w∈S and all c^.\hat c^\top\big(w-w^*(\hat c)\big)\ge\frac{\mu\,\nu_S(\hat c)}{2}\,\|w-w^*(\hat c)\|^2\qquad\text{for all }w\in S\text{ and all }\hat c .c^⊤(w−w∗(c^))≥2μνS​(c^)​∥w−w∗(c^)∥2for all w∈S and all c^.

For γ>0\gamma>0γ>0 the γ\gammaγ-margin SPO loss ℓSPOγ(c^,c)\ell^\gamma_{\rm SPO}(\hat c,c)ℓSPOγ​(c^,c) equals ℓSPO(c^,c)\ell_{\rm SPO}(\hat c,c)ℓSPO​(c^,c) when νS(c^)>γ\nu_S(\hat c)>\gammaνS​(c^)>γ and νS(c^)γℓSPO(c^,c)+(1−νS(c^)γ)ωS(c)\frac{\nu_S(\hat c)}{\gamma}\ell_{\rm SPO}(\hat c,c)+\big(1-\frac{\nu_S(\hat c)}{\gamma}\big)\omega_S(c)γνS​(c^)​ℓSPO​(c^,c)+(1−γνS​(c^)​)ωS​(c) otherwise. It dominates the SPO loss.

Data (x,c)(x,c)(x,c) are drawn from a distribution D\mathcal DD on features X\mathcal XX and costs in C\mathcal CC, and H\mathcal HH is a class of prediction functions f:X→Rdf:\mathcal X\to\mathbb R^df:X→Rd. The SPO risk is RSPO(f)=ED[ℓSPO(f(x),c)]R_{\rm SPO}(f)=\mathbb E_{\mathcal D}[\ell_{\rm SPO}(f(x),c)]RSPO​(f)=ED​[ℓSPO​(f(x),c)] and the empirical margin risk is R^SPOγ(f)=1n∑iℓSPOγ(f(xi),ci)\hat R^\gamma_{\rm SPO}(f)=\frac1n\sum_i\ell^\gamma_{\rm SPO}(f(x_i),c_i)R^SPOγ​(f)=n1​∑i​ℓSPOγ​(f(xi​),ci​). The multivariate empirical Rademacher complexity is R^n(H)=Eσ[sup⁡f∈H1n∑iσi⊤f(xi)]\hat{\mathfrak R}^n(\mathcal H)=\mathbb E_{\boldsymbol\sigma}\big[\sup_{f\in\mathcal H}\frac1n\sum_i\boldsymbol\sigma_i^\top f(x_i)\big]R^n(H)=Eσ​[supf∈H​n1​∑i​σi⊤​f(xi​)] with i.i.d. Rademacher vectors σi∈{±1}d\boldsymbol\sigma_i\in\{\pm1\}^dσi​∈{±1}d, and Rn(H)\mathfrak R^n(\mathcal H)Rn(H) is its expectation over the sample.

Formalization targets

Goal: Theorem 4, second display (pp. 19–20)

In the ℓ2\ell_2ℓ2​ set-up, under the strength property with μ>0\mu>0μ>0 and for fixed γ>0\gamma>0γ>0, for every δ>0\delta>0δ>0, with probability at least 1−δ1-\delta1−δ over an i.i.d. sample of size nnn, for all f∈Hf\in\mathcal Hf∈H:

RSPO(f)≤R^SPOγ(f)+(22ρ2(C)+22μ ωS(C)γμ)Rn(H)+ωS(C)log⁡(1/δ)2n.R_{\rm SPO}(f)\le\hat R^\gamma_{\rm SPO}(f)+\Big(\frac{2\sqrt2\rho_2(\mathcal C)+2\sqrt2\mu\,\omega_S(\mathcal C)}{\gamma\mu}\Big)\mathfrak R^n(\mathcal H)+\omega_S(\mathcal C)\sqrt{\frac{\log(1/\delta)}{2n}} .RSPO​(f)≤R^SPOγ​(f)+(γμ22​ρ2​(C)+22​μωS​(C)​)Rn(H)+ωS​(C)2nlog(1/δ)​​.

Milestones

  1. Theorem 3(a): ∥w∗(c^1)−w∗(c^2)∥≤∥c^1−c^2∥∗μmin⁡{νS(c^1),νS(c^2)}\|w^*(\hat c_1)-w^*(\hat c_2)\|\le\frac{\|\hat c_1-\hat c_2\|_*}{\mu\min\{\nu_S(\hat c_1),\nu_S(\hat c_2)\}}∥w∗(c^1​)−w∗(c^2​)∥≤μmin{νS​(c^1​),νS​(c^2​)}∥c^1​−c^2​∥∗​​.
  2. Theorem 3(b): the same Lipschitz-like bound for ℓSPO(⋅,c)\ell_{\rm SPO}(\cdot,c)ℓSPO​(⋅,c), with an extra factor ∥c∥∗\|c\|_*∥c∥∗​.
  3. Theorem 3(c): ℓSPOγ(⋅,c)\ell^\gamma_{\rm SPO}(\cdot,c)ℓSPOγ​(⋅,c) is ∥c∥∗+μ ωS(c)γμ\frac{\|c\|_*+\mu\,\omega_S(c)}{\gamma\mu}γμ∥c∥∗​+μωS​(c)​-Lipschitz for the dual norm.
  4. Eq. (7) with C=2C=\sqrt2C=2​ (Maurer's vector contraction inequality): for LLL-Lipschitz Φi\Phi_iΦi​ on Euclidean Rd\mathbb R^dRd,
Eσ[sup⁡f∈H1n∑iσiΦi(f(xi))]≤2L R^n(H).\mathbb E_\sigma\Big[\sup_{f\in\mathcal H}\frac1n\sum_i\sigma_i\Phi_i(f(x_i))\Big]\le\sqrt2L\,\hat{\mathfrak R}^n(\mathcal H).Eσ​[f∈Hsup​n1​i∑​σi​Φi​(f(xi​))]≤2​LR^n(H).
  1. Theorem 4, first display: for any fixed sample with costs in C\mathcal CC,
R^γSPOn(H)≤(2ρ2(C)+2μ ωS(C)γμ)R^n(H).\hat{\mathfrak R}^n_{\gamma\rm SPO}(\mathcal H)\le\Big(\frac{\sqrt2\rho_2(\mathcal C)+\sqrt2\mu\,\omega_S(\mathcal C)}{\gamma\mu}\Big)\hat{\mathfrak R}^n(\mathcal H).R^γSPOn​(H)≤(γμ2​ρ2​(C)+2​μωS​(C)​)R^n(H).

Theorem 3 is stated for a general norm, as in the paper. Eq. (7), Theorem 4 and the goal are Euclidean. The paper's Theorem 5 (p. 20), a version of the goal uniform over γ∈(0,γˉ]\gamma\in(0,\bar\gamma]γ∈(0,γˉ​], is not part of this mission.

Significance

The bound replaces the loss-class complexity of the SPO loss, which is controlled only through combinatorial dimensions (Natarajan dimension in the polyhedral case, Section 3 of the paper), by the multivariate Rademacher complexity of H\mathcal HH itself. For norm-bounded linear hypothesis classes this complexity has mild, even logarithmic, dependence on the dimensions ppp and ddd (Section 4.4). The result applies to every feasible region with the strength property. By Section 5 of the paper these include strongly convex sets and polytopes, where νS\nu_SνS​ can also be computed. When most predictions stay far from degeneracy, R^SPOγ≈R^SPO\hat R^\gamma_{\rm SPO}\approx\hat R_{\rm SPO}R^SPOγ​≈R^SPO​ and the bound is much sharper than the combinatorial one. It is also a strict generalization of margin bounds for binary classification (Example 7).

The theorem is proved in the paper, which imports two external tools without proof: the Rademacher generalization bound of Bartlett and Mendelson, applied to the margin loss, and Maurer's inequality. To our knowledge none of these results has a machine-checked proof. The mission produces a checked proof of the margin bound and a Lean statement of Maurer's inequality. It also formalizes the strength property and the Lipschitz estimates of Theorem 3, which the companion missions on strongly convex sets and polytopes rely on.

Difficulty

The SPO loss is discontinuous in c^\hat cc^ at degenerate predictions. The standard route, scalar Ledoux–Talagrand contraction applied to the loss class, therefore fails at the first step. It would fail even for a Lipschitz loss, because it relates the loss class only to a scalar class, and H\mathcal HH is vector valued. Lipschitz continuity of the margin loss needs the oracle to be stable away from C∘\mathcal C^\circC∘. Convexity and compactness of SSS alone do not give that: for an ℓp\ell_pℓp​ ball with 2<p<∞2<p<\infty2<p<∞ the strength property fails for every μ>0\mu>0μ>0 (p. 14). The vector contraction inequality of Maurer (2016) is a nontrivial probabilistic inequality, and its constant 2\sqrt22​ must not depend on the dimension ddd. The final concentration step is McDiarmid's inequality for a supremum over a possibly uncountable class, which in a formal proof needs measurability of that supremum.

Formalization scope

The decision space is a finite-dimensional real normed space E. Cost vectors and predictions are continuous linear functionals, StrongDual ℝ E, whose operator norm is the paper's dual norm. In the ℓ2\ell_2ℓ2​ statements E = EuclideanSpace ℝ (Fin d), where the dual norm is Euclidean. Every statement carries the standing assumptions: SSS nonempty, compact, convex and not a singleton, an arbitrary oracle (no tie-breaking rule), and μ>0\mu>0μ>0, γ>0\gamma>0γ>0. The Lipschitz-like bounds of Theorem 3(a)–(b) are stated multiplied out, because the paper reads 1/01/01/0 as +∞+\infty+∞. Expectations over signs are finite averages over sign patterns. ωS(C)\omega_S(\mathcal C)ωS​(C) and ρ2(C)\rho_2(\mathcal C)ρ2​(C) are suprema over a nonempty bounded C\mathcal CC containing the cost almost surely. "With probability at least 1−δ1-\delta1−δ" is the statement that the outer Dn\mathcal D^nDn-measure of the failure event is at most δ\deltaδ.

Added hypotheses, all disclosed in the statements: the multivariate Rademacher sums are bounded above (almost surely in the goal) and R^n(H)\hat{\mathfrak R}^n(\mathcal H)R^n(H) is integrable, since otherwise Lean's junk value 000 would replace an infinite complexity and make the bound false rather than vacuous. Hypotheses fff and ℓSPO(f(x),c)\ell_{\rm SPO}(f(x),c)ℓSPO​(f(x),c) measurable, and the uniform deviation and margin Rademacher suprema a.e.-measurable, are also added; the paper is silent on measurability. A singleton SSS would make C∘\mathcal C^\circC∘ empty and the strength property hold for free; this is excluded explicitly, so the strength property is not vacuous.

A complete development needs the Bartlett–Mendelson symmetrization bound for bounded losses, McDiarmid's inequality, Maurer's inequality, and the Lipschitz and distance-to-degeneracy facts of Section 4.1. Maurer's inequality and the multivariate Rademacher complexity are reusable across vector-valued learning theory. Proofs of any milestone, and of Maurer's inequality in particular, are welcome.

Selected references

  • O. El Balghiti, A. N. Elmachtoub, P. Grigas, A. Tewari, Generalization Bounds in the Predict-then-Optimize Framework, Mathematics of Operations Research, 2023; preprint arXiv:1905.11488v3, 2022. https://arxiv.org/abs/1905.11488
  • A. N. Elmachtoub, P. Grigas, Smart "Predict, then Optimize", Management Science 68(1), 2022. https://doi.org/10.1287/mnsc.2020.3922
  • A. Maurer, A Vector-Contraction Inequality for Rademacher Complexities, Algorithmic Learning Theory (ALT), 2016. https://arxiv.org/abs/1605.00251
  • P. L. Bartlett, S. Mendelson, Rademacher and Gaussian Complexities: Risk Bounds and Structural Results, Journal of Machine Learning Research 3, 2002. https://www.jmlr.org/papers/v3/bartlett02a.html
  • V. Koltchinskii, D. Panchenko, Empirical Margin Distributions and Bounding the Generalization Error of Combined Classifiers, Annals of Statistics 30(1), 2002. https://doi.org/10.1214/aos/1015362183
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CombinatoricsOptimizationTheoretical Computer Science·Captain: mikedeng1

Local Search Heuristics for k-Median and Facility Location Problems III: Add-Drop-Swap Local Search for Uncapacitated Facility Location Has Locality Gap 3Research Paper

Motivation

The uncapacitated facility location (UFL) problem is one of the basic models of location theory and operations research: a firm chooses which warehouses, plants or servers to open, paying a fixed cost for each open site and a service cost for every client according to its distance to the nearest open site. It is also a standard test case for approximation algorithms.

Local search is the simplest of these and the one most used in practice: start from any set of open facilities and repeatedly add, drop or exchange one facility while this lowers the cost. The question is how bad a solution can be when no such move helps. Arya, Garg, Khandekar, Meyerson, Munagala and Pandit (SIAM J. Comput. 33(3), 2004) answered it for UFL with an exact constant.

Timeline. Korupolu, Plaxton and Rajaraman (SODA 1998, J. Algorithms 2000) analysed local search with add, drop and swap moves and proved a locality gap of at most 5; their analysis contains the service cost bound restated here as Lemma 4.1. Charikar and Guha (FOCS 1999) proved a locality gap of 3 for a different local search, in which one facility is added and any number are dropped. Arya et al. (STOC 2001; journal version 2004) proved that the add/drop/swap neighbourhood itself has locality gap at most 3, and gave an instance showing that 3 cannot be improved (§4.3).

Setting

A metric instance consists of a finite set CCC of clients, a finite set FFF of facilities, and a distance ddd on C∪FC \cup FC∪F that is nonnegative, symmetric and satisfies the triangle inequality. The cost of serving client jjj by facility iii is cji=d(j,i)c_{ji} = d(j,i)cji​=d(j,i); the distance cii′c_{ii'}cii′​ between two facilities is also available. Each facility i∈Fi \in Fi∈F has an opening cost fi≥0f_i \ge 0fi​≥0.

A solution is a nonempty set S⊆FS \subseteq FS⊆F of open facilities. Every client is served by its nearest open facility, so

costf(S)=∑i∈Sfi,costs(S)=∑j∈Cmin⁡i∈Scji,cost(S)=costf(S)+costs(S).\mathrm{cost}_f(S) = \sum_{i \in S} f_i, \qquad \mathrm{cost}_s(S) = \sum_{j \in C} \min_{i \in S} c_{ji}, \qquad \mathrm{cost}(S) = \mathrm{cost}_f(S) + \mathrm{cost}_s(S).costf​(S)=i∈S∑​fi​,costs​(S)=j∈C∑​i∈Smin​cji​,cost(S)=costf​(S)+costs​(S).

The neighbourhood of SSS is the set of solutions reachable by adding one facility, dropping one facility, or swapping one open facility for another:

B(S)={S+{s′}}∪{S−{s}∣s∈S}∪{S−{s}+{s′}∣s∈S}.\mathcal B(S) = \{S + \{s'\}\} \cup \{S - \{s\} \mid s \in S\} \cup \{S - \{s\} + \{s'\} \mid s \in S\}.B(S)={S+{s′}}∪{S−{s}∣s∈S}∪{S−{s}+{s′}∣s∈S}.

SSS is locally optimum if cost(S)≤cost(S′)\mathrm{cost}(S) \le \mathrm{cost}(S')cost(S)≤cost(S′) for every S′∈B(S)S' \in \mathcal B(S)S′∈B(S). The locality gap is the supremum, over all instances, of the ratio between the cost of a worst local optimum and the cost of a global optimum.

The proofs use the following notation, which appears in the milestones but not in the goal. Fix a second solution OOO and nearest-facility assignments σS:C→S\sigma_S : C \to SσS​:C→S, σO:C→O\sigma_O : C \to OσO​:C→O; write Sj=cjσS(j)S_j = c_{j\sigma_S(j)}Sj​=cjσS​(j)​, Oj=cjσO(j)O_j = c_{j\sigma_O(j)}Oj​=cjσO​(j)​, NS(s)=σS−1(s)N_S(s) = \sigma_S^{-1}(s)NS​(s)=σS−1​(s), NO(o)=σO−1(o)N_O(o) = \sigma_O^{-1}(o)NO​(o)=σO−1​(o) and Nso=NO(o)∩NS(s)N^o_s = N_O(o) \cap N_S(s)Nso​=NO​(o)∩NS​(s). A facility s∈Ss \in Ss∈S captures o∈Oo \in Oo∈O if ∣Nso∣>12∣NO(o)∣|N^o_s| > \tfrac12 |N_O(o)|∣Nso​∣>21​∣NO​(o)∣; sss is good if it captures no facility of OOO and bad otherwise. The proof of the facility cost bound uses a permutation π\piπ of the clients that maps each NO(o)N_O(o)NO​(o) onto itself, moves every client of a non-capturing block NsoN^o_sNso​ out of that block (Property 3.1), and fixes every client of a capturing block that it would map into the same block.

Formalization targets

Goal: Theorem 4.3

cost(S)≤3⋅cost(O)for every locally optimum S and every solution O.\mathrm{cost}(S) \le 3 \cdot \mathrm{cost}(O) \quad \text{for every locally optimum } S \text{ and every solution } O.cost(S)≤3⋅cost(O)for every locally optimum S and every solution O.

This is the locality gap bound of Theorem 4.3 (p. 557) in its strongest printed form: OOO is any solution, not only an optimal one.

Milestones

  1. Lemma 4.1 (service cost), p. 554: costs(S)≤costf(O)+costs(O)\mathrm{cost}_s(S) \le \mathrm{cost}_f(O) + \mathrm{cost}_s(O)costs​(S)≤costf​(O)+costs​(O).
  2. The refined mapping π\piπ of the proof of Lemma 4.2, p. 555: such a permutation exists for any two assignments.
  3. Inequality (5), p. 555: the drop move for a good facility sss,
−fs+∑j∈NS(s), π(j)≠j(Oj+Oπ(j)+Sπ(j)−Sj)+2∑j∈NS(s), π(j)=jOj≥0.-f_s + \sum_{j \in N_S(s),\ \pi(j) \neq j} (O_j + O_{\pi(j)} + S_{\pi(j)} - S_j) + 2 \sum_{j \in N_S(s),\ \pi(j) = j} O_j \ge 0.−fs​+j∈NS​(s), π(j)=j∑​(Oj​+Oπ(j)​+Sπ(j)​−Sj​)+2j∈NS​(s), π(j)=j∑​Oj​≥0.
  1. Inequality (6), pp. 555–556: the swap of a bad facility sss with the facility ooo it captures that is nearest to it.
  2. Inequality (8), p. 556: for a bad facility sss capturing the set P⊆OP \subseteq OP⊆O, the analogue of (5) with ∑o′∈Pfo′−fs\sum_{o' \in P} f_{o'} - f_s∑o′∈P​fo′​−fs​ in place of −fs-f_s−fs​.
  3. Lemma 4.2 (facility cost), p. 555: costf(S)≤costf(O)+2⋅costs(O)\mathrm{cost}_f(S) \le \mathrm{cost}_f(O) + 2 \cdot \mathrm{cost}_s(O)costf​(S)≤costf​(O)+2⋅costs​(O).

A companion item, not a milestone, states the bound in the proof of Theorem 4.4 with α=2\alpha = \sqrt2α=2​: a local optimum of the instance with facility costs 2fi\sqrt2 f_i2​fi​ costs at most (1+2) cost(O)(1+\sqrt2)\,\mathrm{cost}(O)(1+2​)cost(O) in the original instance.

Significance

The result. Theorem 4.3 shows that the simplest local search for metric UFL is within a factor 3 of optimal at every local optimum, with no LP and no rounding, and the tight example of §4.3 shows the analysis cannot be improved for this neighbourhood. Because Lemmas 4.1 and 4.2 hold against every solution OOO, scaling the facility costs before running local search trades the two bounds against each other and gives the 1+2+ϵ1 + \sqrt2 + \epsilon1+2​+ϵ guarantee of Theorem 4.4. The same capture-and-reassign technique is used for k-median (§3) and capacitated facility location (§5).

Formalizing it. The theorem is proved on paper; no machine-checked proof of it or of any locality gap bound for facility location is known to this mission. A formal development would check the reassignment arguments, which are stated case by case in the paper, and would produce reusable Lean infrastructure for metric facility location instances, nearest-facility costs and neighbourhood-based local optimality.

Difficulty

The service cost bound is routine; the facility cost bound is where the work lies. The natural first idea, closing a facility s∈Ss \in Ss∈S and sending each of its clients to the facility of SSS nearest to that client's optimal facility, fails when sss serves most of the clients of some o∈Oo \in Oo∈O: the nearest facility of SSS to ooo may be sss itself, so the client has nowhere to go. The proof separates good facilities, which can be dropped, from bad ones, which must be swapped with a captured facility, and pays for the clients that cannot be moved through the distance between sss and its nearest captured facility. The combinatorial core is the construction of a permutation within each NO(o)N_O(o)NO​(o) that avoids every non-capturing block and has fixed points only where they are unavoidable.

Formalization scope

Clients and facilities are finite types Cl and Fa. The distance is a real-valued function on Cl ⊕ Fa that is nonnegative, symmetric and satisfies the triangle inequality; d(x,x)=0d(x,x) = 0d(x,x)=0 is not assumed, since the paper neither states nor uses it. Opening costs are a function f : Fa → ℝ with 0 ≤ f i, and demands are unit, as in the paper.

Solutions are nonempty Finsets. The service cost is ∑jmin⁡i∈Scji\sum_j \min_{i \in S} c_{ji}∑j​mini∈S​cji​ (Finset.inf') and is defined only for nonempty sets, so no junk value for ∅\emptyset∅ enters. Accordingly the drop move is considered only when a facility remains open; with at least one client, ∅\emptyset∅ cannot serve anyone and is not a solution. Local optimality is required for all moves of B(S)\mathcal B(S)B(S): every added facility, every dropped facility and every swap, not only the moves used in the proof. The goal is stated as the multiplied-out inequality cost(S)≤3 cost(O)\mathrm{cost}(S) \le 3\,\mathrm{cost}(O)cost(S)≤3cost(O) for every nonempty OOO, never as a ratio, since cost(O)\mathrm{cost}(O)cost(O) may be 000.

In the milestones, the nearest-facility assignments σS\sigma_SσS​, σO\sigma_OσO​ are arbitrary among the nearest ones (ties broken arbitrarily), and the family of bijections π:NO(o)→NO(o)\pi : N_O(o) \to N_O(o)π:NO​(o)→NO​(o) is a single permutation of the clients with σO∘π=σO\sigma_O \circ \pi = \sigma_OσO​∘π=σO​. Inequality (5) assumes at least one client, which the paper assumes implicitly: with no clients and S={s}S = \{s\}S={s} it would read −fs≥0-f_s \ge 0−fs​≥0. The goal and Lemma 4.2 need no such assumption.

A statement that assumes local optimality only for the moves the proof uses, that fixes OOO to be a global optimum defined by hypotheses, or that allows the empty set a zero service cost would be a different theorem; none of these is used.

Needed infrastructure: sums over nearest-facility assignments and their fibers NO(o)N_O(o)NO​(o), the permutation π\piπ, and bookkeeping of the three kinds of moves. The instance, cost and local optimality definitions are reusable for other local search analyses of metric location problems. Proofs of any milestone are welcome, as are alternative proofs of the goal.

Selected references

  • V. Arya, N. Garg, R. Khandekar, A. Meyerson, K. Munagala, V. Pandit, Local Search Heuristics for k-Median and Facility Location Problems, SIAM J. Comput. 33(3):544–562, 2004. https://doi.org/10.1137/S0097539702416402
  • M. R. Korupolu, C. G. Plaxton, R. Rajaraman, Analysis of a Local Search Heuristic for Facility Location Problems, J. Algorithms 37(1):146–188, 2000. https://doi.org/10.1006/jagm.2000.1100
  • M. Charikar, S. Guha, Improved Combinatorial Algorithms for the Facility Location and k-Median Problems, FOCS 1999, 378–388. https://doi.org/10.1109/SFFCS.1999.814609
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Convex OptimizationOptimization·Captain: mikedeng1

Jointly Constrained Biconvex Programming II: The Convex-Envelope Branch-and-Bound Algorithm Converges to a Global SolutionResearch Paper

Motivation

Bilinear programs, which minimize an objective containing a term x⊤yx^\top yx⊤y over constraints on xxx and yyy, model pooling and blending in petroleum refining, location–allocation, certain dynamic production problems and many other applications (Konno 1971, surveyed in Al-Khayyal and Falk 1983, p. 274). The term x⊤yx^\top yx⊤y is not convex, so such problems can have local minima that are not global. For example, min⁡{xy:−1≤x≤2, −2≤y≤3}\min\{xy : -1 \le x \le 2,\ -2 \le y \le 3\}min{xy:−1≤x≤2, −2≤y≤3} has local solutions at (−1,3)(-1, 3)(−1,3) and (2,−2)(2, -2)(2,−2). When xxx and yyy are constrained separately, a solution lies at an extreme point of the feasible region, and vertex-enumeration and cutting-plane methods apply. When the constraints couple xxx and yyy, this property is lost.

Al-Khayyal and Falk (Math. Oper. Res. 8(2), 1983) gave a branch-and-bound algorithm for this jointly constrained case. It lower-bounds the objective on each box by the convex envelope of the bilinear term, and they proved that it converges to a global solution. The closed form of that envelope, found independently by McCormick (1976) and now called the McCormick envelope, underlies the bilinear relaxations of modern global solvers.

Timeline:

  • 1969, Falk and Soland: a branch-and-bound scheme for separable nonconvex programs using convex envelopes, the pattern this algorithm follows.
  • 1976, McCormick: convex underestimators of factorable functions, including the envelope of xyxyxy on a rectangle.
  • 1983, Al-Khayyal and Falk: the envelope of xyxyxy over a rectangle (Theorem 2), the branch-and-bound algorithm for jointly constrained biconvex programs, and a proof of its convergence.

Setting

Fix n≥1n \ge 1n≥1 and a box Ω={(x,y)∈Rn×Rn:l≤x≤L, m≤y≤M}\Omega = \{(x,y) \in \mathbb{R}^n \times \mathbb{R}^n : l \le x \le L,\ m \le y \le M\}Ω={(x,y)∈Rn×Rn:l≤x≤L, m≤y≤M} with coordinate rectangles Ωi=[li,Li]×[mi,Mi]\Omega_i = [l_i, L_i] \times [m_i, M_i]Ωi​=[li​,Li​]×[mi​,Mi​]. Problem P\mathcal PP is

min⁡ φ(x,y)=f(x)+x⊤y+g(y)subject to (x,y)∈S∩Ω,\min\ \varphi(x,y) = f(x) + x^\top y + g(y) \quad \text{subject to } (x,y) \in S \cap \Omega,min φ(x,y)=f(x)+x⊤y+g(y)subject to (x,y)∈S∩Ω,

with fff, ggg convex (and continuous) on their boxes, SSS closed and convex, and S∩Ω≠∅S \cap \Omega \neq \emptysetS∩Ω=∅. Its optimal value is v∗v^*v∗.

The convex envelope VexB h\mathrm{Vex}_B\, hVexB​h of a function hhh over a set BBB is the pointwise supremum of all convex functions that underestimate hhh on BBB. For a box BBB, the node function ψB(x,y)=f(x)+VexB x⊤y+g(y)\psi^B(x,y) = f(x) + \mathrm{Vex}_B\, x^\top y + g(y)ψB(x,y)=f(x)+VexB​x⊤y+g(y) is convex and lies below φ\varphiφ on BBB. The subproblem at node BBB, minimizing ψB\psi^BψB over S∩BS \cap BS∩B, is a convex program.

A run of the algorithm is a sequence of stages. Stage 000 has the single open node Ω\OmegaΩ. At stage kkk the Best Bound Rule selects an open node BkB_kBk​ whose subproblem value is least, and the stage point (xk,yk)(x^k, y^k)(xk,yk) is its subproblem solution. The best lower bound is vbk=ψBk(xk,yk)v_b^k = \psi^{B_k}(x^k, y^k)vbk​=ψBk​(xk,yk) and the best upper bound is Vbk=min⁡l≤kφ(xl,yl)V_b^k = \min_{l \le k} \varphi(x^l, y^l)Vbk​=minl≤k​φ(xl,yl). The selected node is then split. The algorithm picks the coordinate III with the largest gap xikyik−Vex(Bk)i xiyix^k_i y^k_i - \mathrm{Vex}_{(B_k)_i}\, x_i y_ixik​yik​−Vex(Bk​)i​​xi​yi​ and replaces the rectangle (Bk)I(B_k)_I(Bk​)I​ by the four subrectangles cut out by the point (xIk,yIk)(x^k_I, y^k_I)(xIk​,yIk​) (Figure 1 of the paper). All other rectangles are kept. The stage function ψk\psi^kψk assigns to each point of Ω\OmegaΩ the least node value ψB\psi^BψB among the open boxes containing it.

Formalization targets

Goal: convergence to a global solution

For every run,

every accumulation point (xˉ,yˉ) of (xk,yk) solves P,lim⁡kvbk=v∗=lim⁡kVbk.\text{every accumulation point } (\bar x, \bar y) \text{ of } (x^k, y^k) \text{ solves } \mathcal P, \qquad \lim_k v_b^k = v^* = \lim_k V_b^k .every accumulation point (xˉ,yˉ​) of (xk,yk) solves P,klim​vbk​=v∗=klim​Vbk​.

Milestones

In attack order:

  • Theorem 2: VexΩ xy=max⁡{mx+ly−lm, Mx+Ly−LM}\mathrm{Vex}_\Omega\, xy = \max\{mx + ly - lm,\ Mx + Ly - LM\}VexΩ​xy=max{mx+ly−lm, Mx+Ly−LM} on a rectangle.
  • Theorem 3: the envelope is exact on the rectangle's boundary.
  • The Corollary, in two parts:
    • separability, VexΩ x⊤y=∑iVexΩi xiyi\mathrm{Vex}_\Omega\, x^\top y = \sum_i \mathrm{Vex}_{\Omega_i}\, x_i y_iVexΩ​x⊤y=∑i​VexΩi​​xi​yi​;
    • exactness at points whose every coordinate pair lies on ∂Ωi\partial\Omega_i∂Ωi​.
  • Along runs: ψk≤ψk+1≤φ\psi^k \le \psi^{k+1} \le \varphiψk≤ψk+1≤φ on Ω\OmegaΩ.
  • The bound chain vb1≤vb2≤⋯≤v∗≤⋯≤Vb2≤Vb1v_b^1 \le v_b^2 \le \cdots \le v^* \le \cdots \le V_b^2 \le V_b^1vb1​≤vb2​≤⋯≤v∗≤⋯≤Vb2​≤Vb1​.
  • Termination when vbk=Vbkv_b^k = V_b^kvbk​=Vbk​.
  • The gradient bound γi\gamma_iγi​.
  • The equicontinuity estimate ∥z−w∥<ε/(nγ)⇒∣VexB x⊤y(z)−VexB x⊤y(w)∣<ε\|z - w\| < \varepsilon/(n\gamma) \Rightarrow |\mathrm{Vex}_B\, x^\top y(z) - \mathrm{Vex}_B\, x^\top y(w)| < \varepsilon∥z−w∥<ε/(nγ)⇒∣VexB​x⊤y(z)−VexB​x⊤y(w)∣<ε within every sub-box BBB.
  • The limit identity: along a convergent subsequence of stage points, vbkt→φ(xˉ,yˉ)v_b^{k_t} \to \varphi(\bar x, \bar y)vbkt​​→φ(xˉ,yˉ​).

Theorem 4 of the paper, on the envelope of ∑fi(xi)+x⊤y+∑gi(yi)\sum f_i(x_i) + x^\top y + \sum g_i(y_i)∑fi​(xi​)+x⊤y+∑gi​(yi​) with concave fi,gif_i, g_ifi​,gi​, is included as a further target.

Significance

The convergence theorem certifies that the algorithm computes the global optimum of a nonconvex problem. It is not a local search. Its ingredients carry over to spatial branch-and-bound in general: envelopes that are exact on the boundary of their box, a subdivision at the relaxation's solution, and best-bound selection. Theorem 2 and its separable extension are the building block of McCormick relaxations, used for bilinear terms throughout global optimization.

As far as is known, none of these results is formalized. The mission produces a formal model of a spatial branch-and-bound procedure with rectangular subdivision at the relaxation solution, together with the convex-envelope facts it rests on. The paper's convergence proof is informal and, as printed, passes through two claims that do not hold (see Formalization scope). A machine-checked proof of the convergence theorem would settle the result on firm ground.

Difficulty

The algorithm splits at the relaxation's solution, not at the midpoint, so the boxes of a run need not shrink to points. The usual "exhaustive subdivision" argument, in which the diameters of nested boxes tend to zero, does not apply. What makes the gap close is Theorem 3: after a split, the split point sits on the boundary of the new rectangles in the split coordinate, where the envelope is exact. That exactness has to be carried from the selected points to their accumulation points, across coordinates that may be split finitely or infinitely often. The obvious route through a continuous limit of the stage functions is not available, because the stage functions are not continuous in general.

Formalization scope

Vectors are Fin n → ℝ, points are pairs in (Fin n → ℝ) × (Fin n → ℝ), and boxes are four bound vectors, degenerate boxes allowed. The convex envelope is the paper's definition, the real supremum of values of convex minorants, and is used only at points of convex boxes. The McCormick closed form is Theorem 2, a target, and is not built into any definition. A run is a predicate on four sequences: open nodes as a multiset of boxes, selected node, branching index, stage point. Stages are numbered from 000 and runs are infinite: the stopping test is ignored, so a run stopped by the paper is a prefix of one. The optional pruning of p. 278 is omitted, and ties are arbitrary. The optimal value enters through IsMinOn, not through an infimum. The Euclidean distance on R2n\mathbb{R}^{2n}R2n is written out explicitly.

Hypotheses and corrections relative to the page:

  • Continuity of fff and ggg on their boxes is added; the paper uses it without stating it. n>0n > 0n>0 is assumed. The box form of convexity (p. 276) is used.
  • Corollary, second clause (p. 276): "for all (x,y)∈∂Ω(x,y) \in \partial\Omega(x,y)∈∂Ω" is false for n≥2n \ge 2n≥2 (take Ω1=Ω2=[0,2]2\Omega_1 = \Omega_2 = [0,2]^2Ω1​=Ω2​=[0,2]2, x=y=(0,1)x = y = (0,1)x=y=(0,1)). It is stated for points with every (xi,yi)∈∂Ωi(x_i, y_i) \in \partial\Omega_i(xi​,yi​)∈∂Ωi​.
  • Well-definedness of the stage function (p. 277) is false from stage 3 on. Two open boxes can share a point at which their node functions differ, and the stage function then jumps. It is not a target. The stage function takes the minimum over the open boxes containing a point, and the continuity asserted on p. 279 is not formalized. The piecewise convexity asserted there is formalized as convexity of each open node function on its box.
  • Equicontinuity (p. 282): the display ∣Hikj(xi,yi)−Hikj(ui,vi)∣≤∣xiyi−uivi∣|H_i^{kj}(x_i,y_i) - H_i^{kj}(u_i,v_i)| \le |x_i y_i - u_i v_i|∣Hikj​(xi​,yi​)−Hikj​(ui​,vi​)∣≤∣xi​yi​−ui​vi​∣ is false, and so is equicontinuity of the stage functions on all of Ω\OmegaΩ. The estimate is stated within each sub-box, with the paper's δ=ε/(nγ)\delta = \varepsilon/(n\gamma)δ=ε/(nγ).

Two trivializations are excluded. The goal is not a statement about an arbitrary sequence of boxes and points whose gap tends to zero: it quantifies over runs of the algorithm as defined, and a separate well-posedness item, run_exists, asserts that runs exist for every instance. Theorem 2 is about the supremum of convex minorants, not about a function defined by the closed form.

Reusable beyond this mission: the convex envelope and its bilinear closed form, and the box-splitting model. Contributions welcome: proofs of the envelope theorems, a proof of run_exists, and a convergence proof that avoids the false intermediate claims.

Selected references

  • F. A. Al-Khayyal and J. E. Falk, Jointly Constrained Biconvex Programming, Mathematics of Operations Research 8(2):273–286, 1983. https://doi.org/10.1287/moor.8.2.273
  • J. E. Falk and R. M. Soland, An Algorithm for Separable Nonconvex Programming Problems, Management Science 15(9):550–569, 1969. https://doi.org/10.1287/mnsc.15.9.550
  • G. P. McCormick, Computability of Global Solutions to Factorable Nonconvex Programs: Part I — Convex Underestimating Problems, Mathematical Programming 10:147–175, 1976. https://doi.org/10.1007/BF01580665
  • H. Konno, Bilinear Programming: Part II. Applications of Bilinear Programming, Technical Report 71-10, Operations Research House, Stanford University, 1971 (reference [10] of Al-Khayyal and Falk; no online copy known). https://doi.org/10.1287/moor.8.2.273
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