Stochastic Machine Scheduling with Precedence Constraints 1: LP-Based Delayed List Scheduling Is a (1 + β)(1 + 1/β + max{1, (m − 1)Δ/m})-Approximation for P|r_j, prec|E[Σ w_j C_j]Research Paper
Motivation
Scheduling jobs whose processing times are not known in advance is a basic problem of production planning, project management and computing systems. In the stochastic machine scheduling model only the distribution of each processing time is known beforehand; the actual duration of a job is revealed when the job completes. A solution is then not a schedule but a scheduling policy, which decides at every point in time what to start next on the basis of what has been observed so far.
For precedence-constrained problems, constant-factor guarantees for policies were long unavailable. Möhring, Schulz and Uetz (J. ACM 1999) introduced LP relaxations with load inequalities for stochastic scheduling and obtained the first constant-factor policies for independent jobs. In the deterministic setting, Chekuri, Motwani, Natarajan and Stein (SIAM J. Comput. 2001) gave a list scheduling algorithm with deliberate idle times for . Skutella and Uetz (SIAM J. Comput. 2005) combined the two and gave the first constant-factor approximation for stochastic scheduling with precedence constraints and release dates. This mission formalizes that result.
Setting
A finite set of jobs is to be scheduled on identical parallel machines, nonpreemptively. Precedence constraints are the arcs of an acyclic digraph: an arc requires to start no earlier than completes, and is a predecessor of if a directed path leads from to . Job has a release date , before which it must not start, and a weight . Following §2 of the paper, release dates are assumed to respect the precedence constraints (Assumption 2.1: whenever is a predecessor of ).
The processing time of job is a random variable with finite mean ; the are stochastically independent. For a realization of the processing times, a feasible schedule assigns start times such that for every arc and at most jobs are in process at any time. A policy maps realizations to feasible schedules; it is nonanticipatory if what it has started by time depends only on what has been observed by . The completion time of under is .
The coefficient of variation is ; the mission assumes for all and some . With , the set function
defines the LP relaxation: minimize subject to for all , for , and .
Algorithm CMNS takes a priority list and a parameter . Whenever a machine is idle and the first job of the residual list (the jobs not yet scheduled) is available, it is scheduled. Otherwise the first available job of the residual list is deliberately delayed; idle machines accumulate deliberate idle time charged to , and once has been charged it is scheduled out of order. The critical chain of a job is traced backwards through critical predecessors (those completing last, after ); its length is .
Formalization targets
Goal: Theorem 4.1
If is an optimal LP solution, orders the jobs by nondecreasing and , then for every feasible nonanticipatory policy
Milestones
- Observation 2.4: each job is charged at most ; idle time while waits is charged to jobs before ; no deliberate idle time is uncharged.
- Lemma 2.5: the per-realization bound .
- Lemma 2.6: .
- Lemma 2.7: .
- Theorem 2.8: .
- Theorem 3.1: the load inequalities .
- §3: expected completion times of any policy are LP-feasible, so the LP optimum is a lower bound.
- Lemma 3.3: along the LP order.
- §4: in any feasible schedule, so is a lower bound for every policy.
Significance
The theorem gives a policy with a performance guarantee independent of the number of jobs for , using only the expected processing times and a bound on their coefficients of variation. For NBUE distributions () and it yields , matching the deterministic guarantee of Chekuri et al. The analysis separates cleanly into an algorithmic half (Theorem 2.8, valid for arbitrary distributions) and a polyhedral half (load inequalities and Lemma 3.3), both reused for the in-forest results of the same paper and in later work on stochastic scheduling.
The result is proved in the paper; it has no machine-checked proof. Formalizing it produces a precise definition of nonanticipatory policies and of a list scheduling algorithm with deliberate idle times in continuous time, a formal proof of the Möhring–Schulz–Uetz load inequalities, and a verified approximation guarantee for a stochastic scheduling policy.
Difficulty
Lemma 2.6 is the step where the stochastic setting departs from the deterministic one: the set of out-of-order jobs is random and correlated with the schedule, and the identity holds only because the decision to start a job out of order is taken before its processing time is revealed. Making this rigorous requires a formal notion of nonanticipation and an independence argument over a random set. On the algorithmic side, the bookkeeping of deliberate idle time, which accumulates at a rate equal to the number of idle machines, must be made precise at instants where several jobs start, including jobs of length zero. The load inequalities compare every nonanticipatory policy at once and involve second moments of the processing times, so they cannot be checked policy by policy.
Formalization scope
Jobs form a finite type; arcs are a relation whose transitive closure is irreflexive; machine capacity is the counting condition "at most jobs in process", with half-open processing intervals. Processing times may be zero. The CV bound is encoded as finite second moments, positive means and .
Algorithm CMNS is characterized by its rules: a decision order nondecreasing in time, the scheduling rule at each decision, and the condition that after the decisions at any time nothing remains to be done. A CMNS policy is a map with this property for every realization. Nonanticipation and measurability of , which the paper asserts without proof (p. 795; §5), are hypotheses. Critical chains use a fixed tie-breaking order.
Standing assumptions and added hypotheses: independence, Assumption 2.1, , and finite means appear in every statement where they are used. is assumed wherever appears (Lemma 2.7, Theorem 2.8), where the page allows with . Lemma 2.6 assumes that is a linear extension, as in the surrounding Lemma 2.5 and Theorem 2.8; with zero processing times it fails otherwise. Comparator policies have integrable completion times and, like , are measurable for the law of , which §5's requirement that every policy be universally measurable implies.
The goal is not trivialized: comparators range over every feasible nonanticipatory policy, not over list policies or the algorithm itself; is optimal over all , not merely feasible; and the expected cost of CMNS is asserted to be finite, so neither side can collapse to a default integral value.
Contributions welcome: proofs of any milestone, in particular Theorem 3.1 and Lemma 3.3, which are reusable for the companion in-forest mission, and a proof that the CMNS rules determine a unique, nonanticipatory, measurable policy.
Selected references
- M. Skutella, M. Uetz, Stochastic machine scheduling with precedence constraints, SIAM J. Comput. 34(4) (2005) 788–802. https://doi.org/10.1137/S0097539702415007
- R. H. Möhring, A. S. Schulz, M. Uetz, Approximation in stochastic scheduling: the power of LP-based priority policies, J. ACM 46(6) (1999) 924–942. https://doi.org/10.1145/331524.331530
- C. Chekuri, R. Motwani, B. Natarajan, C. Stein, Approximation techniques for average completion time scheduling, SIAM J. Comput. 31(1) (2001) 146–166. https://doi.org/10.1137/S0097539797327180
- R. H. Möhring, F. J. Radermacher, G. Weiss, Stochastic scheduling problems I: General strategies, Z. Oper. Res. 28 (1984) 193–260. https://doi.org/10.1007/BF01919323