 # Duality Gap in Interval Linear Programming

This paper deals with the problem of linear programming with inexact data represented by real closed intervals. Optimization problems with interval data arise in practical computations and they are of theoretical interest for more than forty years. We extend the concept of duality gap (DG), the difference between the primal and its dual optimal value, into interval linear programming. We consider two situations: First, DG is zero for every realization of interval parameters (the so called strongly zero DG) and, second, DG is zero for at least one realization of interval parameters (the so called weakly zero DG). We characterize strongly and weakly zero DG and its special case where the matrix of coefficients is real. We discuss computational complexity of testing weakly and strongly zero DG for commonly used types of interval linear programs and their variants with the real matrix of coefficients. We distinguish the NP-hard cases and the cases that are efficiently decidable. Based on DG conditions, we extend previous results about the bounds of the optimal value set given by Rohn. We provide equivalent statements for the bounds

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## 1 Introduction

The area of interval linear programming connects linear programming with interval analysis, which is one of approaches to deal with inexact data. Optimization problems with interval data are intensively studied for last forty years, see the survey by Hladík  or the chapters by Rohn [23, 24] for more details.

We extend the concept of duality gap (i.e., the difference between the primal and the dual optimal value) from linear programming into the setting of interval linear programming. To our best knowledge, we are the first who study thoroughly this topic in the context of interval linear programming despite the fact that duality gap is one of the basic concepts of linear programming and a very useful property to describe behavior of programs with respect to their duals. We investigate two situations. At least one particular realization of interval values has zero duality gap (weakly zero duality gap), or all realizations have zero duality gap (strongly zero duality gap).

In particular the second property, strongly zero duality gap, is very useful since it allows us to move from a primal to its dual program, e.g. it is a sufficient assumption to have an equality between optimal value sets of a primal and its dual interval linear program. Our main interest is in characterizations of weakly and strongly zero duality gap and testing their computational complexity.

We focus on interval linear programs and also on their special case — interval linear programs with the real constraint matrix (degenerated matrix). Even programs with degenerated matrix are studied  in recent years and often used in practical computation (network flows, transportation problems , etc.).

In the setting of strongly zero duality gap we obtained an equivalent characterization for the lower and the upper bound on the optimal value set. This extends previous results given by Rohn .

### 1.1 Problem formulation

Given two matrices such that , we define interval matrix as the set

 \boldmathA=[A––,¯¯¯¯A]={A∈Rm×n:A––≤A≤¯¯¯¯A},

where means element-by-element comparison of the corresponding matrices. The set of all interval matrices is denoted by

Let , and be given. We define an interval linear program (ILP111Do not confuse it with the same abbreviation ILP for Integer Linear Programming.) as a family of linear programs

 min c⊤x subj. to x∈M(A,b),

where , and is the feasible set described by linear equations and inequalities. We write it in short as

 min \boldmathc⊤x subj. to x∈M(\boldmathA,\boldmathb). (1)

For interval arithmetic and an introduction to interval analysis, see, e.g., books [1, 18].

#### Duality gap.

Duality gap is the difference of optimal values of an primal and its dual program in mathematical programming. In linear programming, duality gap is zero if and only if at least one of the primal or its dual program is feasible; otherwise it is .

###### Definition 1.

Duality gap of is said to be weakly zero if at least one scenario has zero duality gap, and strongly zero if all scenarios have zero duality gap.

### 1.2 Notations, preliminaries and state-of-the-art

We denote the center matrix of by and the radius matrix of  by . We denote by the diagonal matrix with entries .

A particular realization of interval values, i.e. a linear program with real values, is called a scenario. We denote it by , where , and . We say that ILP is weakly, resp. strongly, feasible if it is feasible for at least one scenario, resp. all scenarios. A solution which satisfies all scenarios, resp. at least one scenario, is called strong solution, resp. weak solution. An interval matrix is said to be degenerated if . We are using the term ILP with degenerated matrix which means an ILP with a real constraint matrix and an interval right hand side and an interval optimization function.

Since different forms of ILP do not have to be equivalent (unlike in linear programming) we have to distinguish between them; see [8, 15] for detailed discussion. Dual problems in ILP straightforwardly extend dual problems in linear programming, for some results see [21, 23, 6, 27]. Basic types of (1) and their dual programs are shown in Table 1.

We denote the optimal value set of (1) as the set of optimal values of all scenarios. Formally, let

be the optimal solution of a scenario with and . Then the optimal value set is

 f(\boldmathA,\boldmathb,% \boldmathc):={f(A,b,c):A∈\boldmathA, b∈% \boldmathb, c∈\boldmathc}.

Analogously, we use for the dual optimal value set. Notice that optimal value set does not have to be an interval, it can be also disconnected. The conditions under which the optimal value function is continuous, and therefore the optimal value set connected, were addressed, e.g., in [2, 19]. We define lower and upper bounds of the optimal value set as

 f––(\boldmathA,\boldmathb,\boldmathc) :=inff(A,b,c) subj. to A∈% \boldmathA, b∈\boldmathb, c∈\boldmathc, ¯¯¯f(\boldmathA,\boldmathb,\boldmathc) :=supf(A,b,c) subj. to A∈% \boldmathA, b∈\boldmathb, c∈\boldmathc.

The lower and upper bound cases are sometimes called the best and the worst case. There always exists a scenario where the bounds are attained, implicitly in . Thanks to this fact we can use minimum and maximum, defined on the extended real axis, instead of infimum and supremum, respectively.

Computation of these extremal optimal values was studied in [2, 4, 11], among others. This problem is -hard in general [7, 22, 23], but it becomes easy for some special forms or under some stability criteria [2, 12, 14, 16].

We use commonly known relationships between optimal value sets of a primal and its dual ILP, which hold thanks to weak and strong duality in linear programming.

###### Proposition 1 (Weak duality for ILP).

It holds that

 f––(\boldmathA,\boldmathb,% \boldmathc)≥g–(\boldmathA,\boldmathb,\boldmathc) and ¯¯¯f(\boldmath% A,\boldmathb,\boldmathc)≥¯¯¯g(\boldmathA,\boldmathb,\boldmathc).
###### Proposition 2 (Strong duality for ILP).

If duality gap of (1) is strongly zero, then

 f(\boldmathA,\boldmathb,\boldmathc)=g(\boldmathA,\boldmathb,\boldmathc).

Notice that the converse implication in Proposition 2 does not hold true in general. A counterexample is shown in Example 1.

### 1.3 Our results

We introduce the concept of DG to interval linear programming. We give a full characterization of weakly zero DG in general (Prop. 3) and derive specific forms for types (A), (B) and (C) (Cor. 2, 3, 1). We obtain a full characterization of strongly zero DG in ILP with degenerated matrix in general (Thm. 1) and for types (A), (B), (C) (Cor. 9, 10, 8). We provide sufficient conditions and necessary conditions of strongly zero DG in ILP (Prop. 4, 5 and 6).

We determine the computation complexity of deciding strongly and weakly zero DG for types (A), (B) and (C), see Table 2, and their degenerated variants, see Table 3, except for strongly zero DG for type (C) ILP, which remains open.

We use duality gap to improve theorems, which determine the lower and the upper bound for the optimal value set of ILP, given by Rohn . We weaken assumptions of finality in both theorems and extend them to equivalent statements (Thm. 8, 9).

## 2 Duality Gap Characterizations

In linear programming the duality gap is not zero if and only if the primal and its dual program are infeasible. We observe that similar conditions hold in interval linear programming. We obtain a full characterization for weakly zero DG, and for strongly zero DG we have only sufficient or necessary conditions. However, for the degenerate matrix there is a full characterisation of strongly zero DG as well.

We show that there is a difference between weakly and strongly zero DG. The problem in Example 1 below has weakly zero DG but not strongly zero DG. If we change to and to we obtain an ILP which does not even have weakly zero DG. For and we obtain an ILP which has strongly zero DG. Moreover, Example 1 provide an ILP with all possible combinations of feasibility and infeasibility of both the primal ILP and the dual ILP.

###### Example 1.

Let us have the following primal and its dual ILP where and .

 min  x1−\boldmathcx2 subj. to x1≤\boldmathb,−x2≤−1,x1,x2≥0 max  \boldmathby1−y2 subj. to y1≤1,−y2≤−\boldmathc,y1,y2≤0.

Depending on the selection of and the ILP contains scenaria where

1. both, the primal and the dual LP are infeasible: for

2. the primal unbounded and the dual LP infeasible: for

3. the dual unbounded and the primal LP infeasible: for , ,

4. both, the primal and the dual LP are feasible: for

The DG is not zero in the first case and zero in remaining cases. Thus, DG is weakly zero but it is not strongly zero. Optimal value set, however, is the same for both the primal and the dual ILP,

 f(\boldmathA,\boldmathb,\boldmathc)=g(\boldmathA,\boldmathb,\boldmathc)={−∞}∪[0,1]∪{∞}.

.

### 2.1 Weakly zero duality gap

We can easily observe the following full characterization of weakly zero DG.

###### Proposition 3.

DG is weakly zero if and only if the primal or the dual ILP is weakly feasible.

###### Proof.

DG is weakly zero if and only if there can not exist a scenario with an infeasible dual as well as primal program. That happens if and only if at least one of the primal or the dual ILP is weakly feasible. ∎

The following statement is a nice direct consequence of the Proposition 3 and two facts. First, the dual of type (C) is also of type (C). Second, an interval system of type (C) is weakly feasible if and only if the system is feasible [24, 28].

###### Corollary 1.

Type (C) has weakly zero DG if and only if at least one of the linear systems

 A––x≤¯¯b,x≥0 or A––⊤y≤¯¯c,y≤0

is feasible.

Using weak feasibility characterisations of type (A)  and type (B) [10, 24] systems we obtain similar characterisations also for type (A) and (B) ILP. However, since they are mutually dual and the weak feasibility for type (B) is expressed by an exponential reduction, we obtain more complicated characterisations. Unless there is no hope for characterization by a constant number of linear systems or any polynomial-time solvable characterisation due to -hardness of testing weakly zero DG (see section 3, Theorem 2).

###### Corollary 2.

Type (A) has weakly zero DG if and only if at least one of the following conditions holds:

• the linear system is feasible,

• there exists such that the linear system is feasible.

###### Corollary 3.

Type (B) has weakly zero DG if and only if at least one of the following conditions holds:

• there exist such that the linear system is feasible.

• the linear system is feasible.

Based on the characterizations, we obtain the following reductions for the particular types of ILP problems.

###### Corollary 4.

A type (A), (B) and (C) ILP has weakly zero DG if and only if it has weakly zero DG, respectively, with

1. for type (A),

2. for type (B),

3. , , for type (C).

### 2.2 Strongly zero duality gap

We can easily observe the following propositions for strongly zero DG.

###### Proposition 4.

DG is strongly zero if the primal program or its dual counterpart is strongly feasible.

###### Proof.

Since the primal or the dual ILP is strongly feasible there exist a feasible solution for all scenarios. Thus there can not be a scenario with an infeasible primal and an infeasible dual program, i.e., DG is strongly zero. ∎

The proposition above does not hold as an equivalence in general because an ILP can contain just only instances with primal unbounded system and dual infeasible system, and vice versa; see Example 2. That ILP has strongly zero DG, but neither primal nor dual program are strongly feasible.

###### Example 2.

Let us have a following primal and its dual program.

 min −y2 subj. to [−1,1]y1−y2=1,y1,y2≥0 max  x subj. to [−1,1]x≤0,−x≤−1

It depends on the choice of a value from the interval . For the primal program is infeasible and the dual unbounded, or vice versa for .

###### Proposition 5.

If the optimal value sets and are connected and it holds that

• the primal or the dual ILP is weakly feasible, and

• at least one, the primal or the dual ILP, does not contain both: an infeasible and an unbounded scenario.

then DG is strongly zero.

###### Proof.

Note that the assumption (i) is equal to

 f(\boldmathA,\boldmathb,\boldmathc)≠{∞} or g(\boldmathA,\boldmathb,\boldmathc)≠{−∞},

and the assumption (ii) is equal to

 f(\boldmathA,\boldmathb,\boldmathc)⊉R∪{∞} or g(\boldmathA,\boldmathb,\boldmathc)⊉R∪{−∞}.

We prove the proposition by contradiction. Suppose that DG is not strongly zero, thus, there exists a scenario with an infeasible both the primal and the dual program. Therefore and . Since the optimal value sets satisfy (i) and they are connected, there exists a scenario and a real optimal value such that or . We obtain from strong duality in linear programming. Since the optimal value sets are connected, we have and . Now, we can reuse strong duality for the remaining real optimal values in and . This together with connectivity leads to a contradiction with (ii). ∎

The assumption (ii) in Proposition 5 cannot be omitted, see Example 3. Optimal value sets of the primal and the dual ILP are equal to the extended real axis in this example and still there is a scenario with infeasible dual and also infeasible primal program.

###### Example 3.

Let be the following ILP

 Primal ILP: min [−1,1]x subj. to [0,1]x≤[−1,1] Dual ILP: max [−1,1]y subj. to [0,1]y=[−1,1],y≤0 Optimal value sets: f(\boldmathA,\boldmathb,% \boldmathc) =g(\boldmathA,\boldmathb,% \boldmathc)=R∪{±∞}

The ILP contains some scenaria with zero duality gap, e.g.,  and some scenaria with non-zero duality gap, e.g.,  DG is not strongly zero even though optimal value sets are equal.

We have also a necessary condition for strongly zero DG. It gives us conditions for type (A), (B) and (C) ILP problems checkable in polynomial time. Thus, we can certify effectively that there is no strongly zero DG in that situations.

###### Proposition 6.

If an ILP has strongly zero DG, then

• the primal ILP is weakly feasible or the dual ILP is strongly feasible, and

• the primal ILP is strongly feasible or the dual ILP is weakly feasible.

###### Proof.

We prove it by contradiction. Since one of the primal or the dual ILP is infeasible for each scenario and the other one is not strongly feasible, there exist a scenario with both, the primal and the dual LP infeasible. Thus DG of this scenario is not zero which is a contradiction with strongly zero DG. ∎

The assumptions (i) and (ii) from Proposition 6 are not sufficient to ensure that ILP has strongly zero DG (see Example 1 where an ILP and its dual are weakly feasible). Proposition 6 gives us together with characterisations of weak and strong feasibility of an interval system [12, 24, 17, 25] polynomially verifiable necessary conditions for strongly zero DG.

###### Corollary 5.

If a type (A) ILP has strongly zero DG, then at least one of the linear systems

 A––x≤¯¯b,−¯¯¯¯Ax≤−b–,x≥0 or ¯¯¯¯A⊤y1−A––⊤y2≤c–,y1,y2≥0

is feasible.

###### Corollary 6.

If a type (B) ILP has strongly zero DG, then at least one of the linear systems

 ¯¯¯¯Ax1−A––x2≤b–,x1,x2≥0 or ¯¯¯¯A⊤y≤¯¯c,A––⊤y≥c–,y≤0

is feasible.

###### Corollary 7.

If a type (C) ILP has strongly zero DG, then at least one of the linear systems

 A––x≤¯¯b,x≥0 or A––⊤y≤c–,y≤0

is feasible, and also one of the linear systems

 ¯¯¯¯Ax≤b–,x≥0 or ¯¯¯¯A⊤y≤¯¯c,y≤0

is feasible.

The full characterization of strongly zero DG remains open.

### 2.3 ILP with degenerated matrix

Let us consider a special case of ILP — ILP problems with degenerated matrix. These are studied and used in practical computations since the matrix of constraints often describes a fixed structure, as in transportation problems and network flows where only capacities, right hand side, and prices, the optimization function, may vary.

We show the converse implication in Proposition 4 holds for ILP problems with degenerated matrix. This gives us a full characterization of strongly zero DG for ILP problems with degenerated matrix.

###### Theorem 1.

An ILP with degenerated matrix has strongly zero DG if and only if primal or dual programs are strongly feasible.

###### Proof.

The backward implication holds according to Proposition 4.

We prove the forward implication by contradiction. Since the primal and the dual ILP are not strongly feasible, there exists a selection such that those scenario of the primal ILP is infeasible. Thus each scenario of the primal ILP is infeasible. Analogously there exists such that for each scenario the dual program is infeasible. These two selections are independent of each other. Let be a scenario of the ILP, then this scenario has both dual and primal programs infeasible, i.e., duality gap of the ILP can not be strongly zero. ∎

Theorem 1 together with the fact that a type (C) ILP is weakly feasible if and only if the system is feasible [5, 28] give us a nice consequence for type (C) using only two classic linear programs.

###### Corollary 8.

A type (C) ILP with degenerated matrix has strongly zero DG if and only if at least one of the systems and is feasible.

For completeness, we also provide characterisations for types (A) and (B). Those are directly derived using characterizations of weak and strong feasibility of an interval linear system [12, 25, 26]. Again unless there is no hope for asymptotically much better characterisations due to -hardness results for types (A) and (B) with degenerated matrix (see section 3, Theorem 5).

###### Corollary 9.

A type (A) ILP with degenerated matrix has strongly zero DG if and only if at least one of the following conditions holds:

• for each the linear system is feasible,

• the linear system is feasible.

###### Corollary 10.

A type (B) ILP with degenerated matrix has strongly zero DG if and only if at least one of the following conditions holds

• the linear system is feasible,

• for each the linear system is feasible.

Based on the above characterizations or by direct inspection, we obtain the following reductions for the particular types of ILP problems.

###### Corollary 11.

A type (A), (B) and (C) ILP with degenerated matrix has strongly zero DG if and only if it has strongly zero DG, respectively, with

1. for type (A),

2. for type (B),

3. , for type (C).

## 3 Computational Complexity

We study computational complexity of strongly and weakly zero DG. Here, we provide the proofs of the theorems summarized in the introduction, see Table 2 for general ILP problems and Table 3 for degenerated cases.

### 3.1 Weakly zero DG

We show the hardness of the decision whether DG is weakly zero.

###### Theorem 2.

Let be a type (B) ILP. It is -complete to decide whether it has weakly zero DG.

###### Proof.

We construct a polynomial-time reduction from the problem of testing strong infeasibility for an interval linear program of type (B). This problem is known to be -hard .

The ILP is strongly infeasible if and only if is strongly infeasible. Let

 min \boldmathc⊤x+u subj. to \boldmathAx≤\boldmathb,u≤1, (2) max \boldmathb⊤y+z subj. to \boldmathA⊤y=% \boldmathc,z=1,y,z≤0 (3)

be a primal and its dual program. Observe that the dual program (3) is infeasible for every scenario. It follows that the primal program (2), and also the original program, is not strongly infeasible (and therefore it is weakly feasible) if and only if it admits weakly zero DG.

To prove completeness, we use Corollary 3 which gives us a polynomial-size certificate checkable in polynomial time. The certificate is a specification of the case (either (i) or (ii)) and additionally a vector for the case (i). This specifies a linear program which can be solved, and thus the certificate checked, in linear time. ∎

Again, the same result holds for type (A) ILP as well since type (A) and (B) are mutually dual. Thus, we can use the same reduction to prove -hardness. The completeness follows from Corollary 2, provided a similar certificate as in the last proof.

###### Theorem 3.

Let be a type (C) ILP. It is polynomial-time solvable to decide whether it has weakly zero DG.

###### Proof.

The proof follows from Corollary 1. It suffices to solve two classical linear programs. ∎

Moreover, testing weakly zero DG of any type with degenerated matrix is polynomial-time solvable.

###### Theorem 4.

Let be a type (A), type (B) or type (C) ILP with degenerated matrix. It is polynomial-time solvable to decide whether it has weakly zero DG.

###### Proof.

Since testing weak feasibility of types (A), (B) and (C) ILP with degenerated matrix is polynomial  the testing weakly zero DG is according to Proposition 3 polynomial, too. ∎

### 3.2 Strongly zero DG

We follow a similar schema of the reduction as in the weak case.

###### Theorem 5.

Let be a type (A) ILP. It is -hard to decide whether it has strongly zero DG. Moreover, the problem remains -hard even for degenerated matrix .

###### Proof.

We construct a polynomial-time reduction from the problem of testing strong feasibility for type (A) ILP. This problem is known to be -hard  even with degenerated matrix .

The interval system is strongly feasible if and only if the interval system is strongly feasible. Let

 min \boldmathc⊤x+u−2v subj. to \boldmathAx=\boldmathb,u−v=0,x,u,v≥0, (4) max \boldmathb⊤y subj. to \boldmathA⊤y≤%\boldmath$c$,z≤1,−z≤−2, (5)

be a primal and its dual program. Observe that the ILP (5) is infeasible for every scenario. It follows that the ILP (4) is strongly feasible if and only if it admits strongly zero DG. ∎

The same result holds for type (B) ILP as well since type (A) and (B) are mutually dual and then we can use the same reduction to prove -hardness. To proceed with the reduction it is necessary to observe that the minimization and the maximization ILP has the same complexity with respect to the determination of zero DG.

We remark that we cannot easily extend the hardness result to a completeness result as in the weakly zero DG. A straightforward certificate, that is a scenario which proves a non-existence of strongly zero DG, does not have to be a polynomially-large certificate because it could contain an arbitrary real value. Instead, it could be interesting to develop a characterization similar to Corollaries 2 and 3.

According to Corollary 8 it is sufficient to solve two linear programs to decide whether DG is strongly zero for a type (C) ILP with degenerated matrix. Thus, it can be decided in polynomial time.

###### Theorem 6.

Let be a type (C) ILP with degenerated matrix. It is polynomial-time solvable to decide whether it has strongly zero DG.

## 4 Improvements of Duality Theorems Using Duality Gap

We can use DG to generalize one of the basic theorems about lower and upper bounds for the optimal value set of ILP, which is a form of strong duality.

###### Theorem 7 ().

Let be a type (A) ILP. If is finite then (6) holds, if is finite then (7) holds.

 ¯¯¯f(\boldmathA,\boldmathb,\boldmathc)= max{ maxb∈\boldmathb b⊤y subj. to ∃A∈\boldmathA,∃c∈\boldmathc:A⊤y≤c}. (6) f––(\boldmathA,\boldmathb,\boldmathc)= max{ minb∈\boldmathb b⊤y subj. to ∀A∈\boldmathA,∀c∈\boldmathc% :A⊤y≤c}. (7)

Notice that equations (6) and (7) can be equivalently written as

 ¯¯¯f(\boldmathA,\boldmathb,\boldmathc)= max⎧⎨⎩ maxb∈\boldmathb{b⊤y} subj. to y∈⋃A∈\boldmathA,c∈\boldmathc{y:A⊤y≤c}⎫⎬⎭, f––(\boldmathA,\boldmathb,\boldmathc)= max⎧⎨⎩ minb∈\boldmathb{b⊤y} subj. to y∈⋂A∈\boldmathA,c∈\boldmathc{y:A⊤y≤c}⎫⎬⎭.

We show that the assumption of finiteness in Theorem 7 can be weakened. We also obtain a full characterization of and and show that strongly zero DG is a sufficient assumption to have the equalities (6) and (7).

###### Theorem 8.

Let be a type (A) ILP. Then

 ¯¯¯f(\boldmathA,\boldmathb,\boldmathc)= max{( maxb∈\boldmathb b⊤y) subj. to ∃A∈\boldmathA,∃c∈\boldmathc% :A⊤y≤c} (8)

if and only if the ILP satisfies at least one of the conditions:

• it has strongly zero DG,

• , i.e., the dual ILP has an unbounded scenario.

###### Proof.

Let us denote and . We show (8) says that . We have

 ¯¯¯g = maxA∈\boldmathA,b∈\boldmathb,c∈\boldmathc{( max b⊤y) subj. to A⊤y≤c} = max{( maxb∈\boldmathb b⊤y) subj. to ∃A∈\boldmathA,∃c∈\boldmathc:A⊤y≤c}.

We prove the backward implication. For ILPs which satisfy the assumption (i) we use strong duality (Proposition 2) which states =. For assumption (ii), we use weak duality (Proposition 1) which states , to show .

We prove the forward implication by contradiction. Since DG is not strongly zero, there exist a scenario with infeasible both primal and dual program. Thus . Since , we obtain . This is a contradiction (with the negation of (ii)). ∎

We are not using the properties of type (A) in the proof of Theorem 8, except of the property that there is the dual form of the given ILP in the right hand side of (8). Thus Theorem 8 with the appropriate modification:

 ¯¯¯f(\boldmathA,\boldmathb,% \boldmathc)= max{( maxb∈\boldmathb b⊤y) subj. to ∃A∈\boldmathA,∃c∈\boldmathc:y∈N(A,c)}

where is the feasible set of the dual program, holds for other types as well.

Weakly zero DG is not sufficient to fulfill equation (8), see Example 1 with changed intervals  and to and . The upper bounds of optimal value sets are and .

###### Theorem 9.

Let be a type (A) ILP. Then

 f––(\boldmathA,\boldmathb,\boldmathc)= max{( minb∈\boldmathb b⊤y) subj. to ∀A∈\boldmathA,∀c∈\boldmathc% :A⊤y≤c} (9)

if and only if the primal ILP is weakly feasible or the dual ILP is strongly feasible.

###### Proof.

According to [12, 23], we have

 f––(\boldmathA,\boldmathb,\boldmathc)= min c–Tx%  subj. to A––x≤¯¯b, −¯¯¯¯Ax≤−b–, x≥0. (10)

 g= max ¯¯bTy1−b–Ty2 subj. to A––Ty1−¯¯¯¯ATy2≤c–, y1,y2≤0, (11)

or, equivalently

 g= max α subj. to ¯¯bTy1−b–Ty2≥α, A––Ty1−¯¯¯¯ATy2≤c–, y1,y2≤0.

By substitution and , we obtain

 g= max α subj. to ¯¯bTy1−b–Ty2≤−α, ¯¯¯¯ATy2−A––Ty1≤c–, y1,y2≥0.

The constraints describe strong solutions of the corresponding interval linear inequalities, so by , we can equivalently write

 g= max α subj. to −bTy≤−α ∀b∈\boldmathb, ATy≤c ∀A∈\boldmathA,∀c∈\boldmathc,

which yields the right-hand side of (9). Equation (9) is valid if and only if there is zero duality gap between (10) and (11). That is, either the primal program (10) must be feasible (i.e., the ILP is weakly feasible), or the dual program (11) must be feasible (i.e., the dual ILP is strongly feasible). ∎

Proposition 6 can be used to obtain the following corollary.

###### Corollary 12.

If a type (A) ILP has strongly zero DG, then (9) holds.

Weakly zero DG is not sufficient to fulfill the equation (9), see the Example 4.

###### Example 4.

Let be the following type (A) ILP

 primal ILP: min [−1,0]x1 subj. to x1−x2=0,x1−x2=1,x1,x2≥0 dual ILP: max y2 subj. to y1+y2≤[−1,0],−y1−y2≤0

The primal ILP is infeasible for each scenario. Thus