Punctuality and idleness in just-in-time scheduling
Introduction
Just-in-time (JIT) scheduling problems form a well studied class of multicriteria scheduling problems. Indeed, these models in which earliness is penalized are very useful to represent practical problems where perishable goods have to be delivered or where storage costs cannot be disregarded.
Most of these problems are based on the two following criteria that are related to the presence of a due date di for each task i of the instance:
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the tardiness Ti = max(0, Ci − di) where Ci denotes the completion time of i,
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the earliness Ei = max(0, di − Ci).
While JIT scheduling problems have been widely studied in the case where the earliness and tardiness criteria are aggregated into a single criterion, T’kindt and Billaut [22, Chapter 6] observed that the multicriteria JIT scheduling problems with more than two criteria have not been well studied in the literature. In this paper, we will consider a JIT scheduling problem in which we will consider the punctuality costs (subsuming earliness criterion and tardiness criterion) and the idleness criterion. In a feasible schedule, idleness periods are time intervals in which a worker or a machine processes no activity. The presence of idleness periods is a well-known consequence of the fact that the punctuality cost functions are not non-decreasing, or, according to the scheduling theory terminology, the criteria are non-regular. For example, in a classical earliness–tardiness problem with two tasks i and j with unit processing times and due dates such that dj > di + 1, the minimization of the criterion Ei + Ti leads to a schedule in which both tasks complete at their due date. Therefore, the time interval [di, dj − 1) is idle since no task is processed in between di and dj − 1. In practical situations, workers may be assigned other tasks to perform during the idleness periods but generally, the presence of—too much—idleness in a schedule is negatively perceived since it often means that some non-multifunctional workers are being paid but are producing nothing. A possible approach in order to minimize the idleness in a schedule, is to introduce a regular secondary criterion such as the makespan Cmax = maxiCi or the flowtime . For example, Fry et al. [5] consider the minimization of a linear combination of the earliness, tardiness and flowtime. This modeling approach may be unsatisfying because it tends to favor earliest schedules. On the contrary, when the workday is defined as the time interval starting with the first task and completing with the completion time of the last task, a good policy may be to postpone the start of the workday in order to decrease the workday length and to reduce the idle time. In our approach in this paper, we will explicitly consider each possible idleness period between consecutive tasks.
The problem of finding an optimal sequence for the earliness/tardiness problem is NP-complete even for a common due date [8], [10]. There are however some special cases where the sequence can be found in polynomial cases. They are listed in the book of T’kindt and Billaut [22, Chapter 6]. In most of these problems, the due date is common for all the tasks—see also the survey of Gordon et al. [7]. Polynomial cases for problems with distinct due date (but equal processing times) were studied by Garey et al. [6] and by Verma and Dessouky [24]. The recent paper of Hassin and Shani [9] presents some generalization of these polynomial algorithms for early/tardy scheduling. Other just-in-time scheduling problems that model assembly lines [18] have also been presented and can efficiently be solved as assignment problems [17], [15], [16].
Much research effort was devoted to the case where the tasks form a chain, that is they are already sequenced in order to be processed (on a single machine). This paper also focuses on this special problem. This problem typically models a situation in which a tour to deliver customers has been build and the best timing for the deliveries is searched for. More generally, this problem is very important because most scheduling algorithms first rank the tasks by the mean of either a (meta)heuristic or an enumeration scheme arid next determine the optimal—if possible—timing for the sequenced tasks. For the single machine problem with earliness/tardiness penalties, we can refer to several branch-and-bound algorithms by Kim and Yano [13], Hoogeveen and van de Velde [11] and Sourd and Kedad-Sidhoum [20], heuristic algorithms by James and Buchanan [12] and Wan and Yen [25]. Also, Ventura and Radhakrishnan [23] and Sourd and Kedad-Sidhoum [20] present algorithms to make feasible some unfeasible solutions of relaxed problems.
This problem in which only the punctuality criterion is considered has been already studied in the literature. When the punctuality cost is equal to the weighted deviation αiEi + βiTi (αi, βi ⩾ 0), the problem can be formulated as a linear program [4] and this formulation is still valid while all the punctuality cost functions are convex and piecewise linear. However, this problem can be more efficiently solved by a direct combinatorial algorithm based on the blocks of adjacent tasks in the earliness–tardiness case [6], [3], [21] and in the more general case where the cost functions are convex [2]. More recently, Sourd [19] has shown that, by a dynamic programming approach, the problem is still polynomial when the punctuality cost functions are not assumed to be convex (but piecewise linear). The complexity of this algorithm depends on the number of segments.
The present paper is a continuation of the work presented in [19]. In contrast to it, the approach adopted in this paper is multicriteria in the sense that the sum of the punctuality costs on the one hand and the sum of the idleness costs on the other hand are separately considered. The algorithm proposed here computes the costs of all the Pareto optimal schedules by a dynamic programming approach. Dynamic programming (DP) has already been used to compute the set of Pareto optimal solutions. For example, Klamroth and Wiecek [14] survey several DP approaches to compute the set of Pareto optimal solutions for the Knapsack problem. However, to the best of our knowledge, our approach is original in a methodological view since the proposed recursive scheme deals with an infinite number of states that can be compactly represented by two-dimensional piecewise linear functions. Similarly, the returned set of Pareto optimal schedules contains an infinite number of schedules that can be represented by a one-dimensional piecewise linear function with a finite number of segments. Under some conditions, it is shown that the number of segments is polynomial.
Section 2 introduces the problem and the notations. In Section 3, the DP algorithm is presented to solve the general problem. Section 4 focuses on the special case where we consider the idleness length instead on idleness costs: a special data structure is described in order to have a polynomial algorithm and a polynomial output. An example is given in Section 5, with some remarks in order to have an efficient implementation.
Section snippets
The problem
The problem is to find the start times of n sequenced tasks 1, 2, … , n that is task j can start only after task j − 1 is completed. In a feasible schedule, Sj and Cj respectively denote the start time and the end time of task j. In order to have simpler equations in the following section, we assume that the processing time of each activity is a constant pj, so that we have that Cj = Sj + pj. However, all that is presented in this paper can be generalized in the more general context where Sj is a
General case
Let Pk(i, t) be the subproblem in which
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the set of tasks is the subset {1, … , k},
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the sum of the idleness costs between these k tasks is i and
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task k completes at time t.
Total idleness and punctuality costs
In this section, we study the special case where the total idleness cost is equal to the sum of the lengths of all the idleness periods in the schedule, which is called the total idleness. In other words, for each k, we take wk(t) = t. In this section, we write instead of . Therefore, the recursive relationship (2) becomesWe also observe that i is now always non-negative.
The aim of this section is to show that, at each step of the DP
Example
We illustrate the algorithm on an instance with 4 tasks such that p1 = p2 = p3 = p4 = 0. The punctuality cost functions are depicted in Fig. 6 and mathematically formulated as follows:The abscissas of the breakpoints are b1 = 7, b2 = 12, b3 = 16, b4 = 19, b5 = 20 and b6 = 24, that is we have q = 6 according to the notation introduced in the preceding section.
Fig. 7 depicts the two-dimensional functions after each transformation T1 or T3,
Conclusion
In this paper, we have presented an algorithm to compute the punctuality costs in function of the idleness costs in a scheduling problem with irregular cost functions. In a methodological view, the algorithm is based on a dynamic programming procedure, in which there are an infinite number of states. However, these states can be efficiently represented by piecewise linear functions. In the case where the idleness cost simply corresponds to the idleness length, a special data structure has been
Acknowledgments
This paper would not have been written without an initiating discussion with Patrice Perny. The two anonymous referees helped to improve the presentation and the clarity of the paper.
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