Flow Games with Public Arcs: the Least Core and the Nucleolus
Pith reviewed 2026-06-26 06:09 UTC · model grok-4.3
The pith
Flow games with public arcs have their least core characterized and nucleolus computed in polynomial time when the core is non-empty.
A machine-rendered reading of the paper's core claim, the machinery that carries it, and where it could break.
Core claim
The authors characterize the least core of flow games with public arcs and give a polynomial-time algorithm to compute the nucleolus when the core is non-empty.
What carries the argument
The flow game with public arcs, in which a coalition's value equals the maximum flow value obtainable from its private arcs together with all public arcs.
If this is right
- The least core allocations satisfy explicit linear inequalities derived from the max-flow values of coalitions.
- When the core is non-empty the nucleolus can be found by solving a sequence of linear programs in polynomial time.
- These solution concepts directly yield fair divisions of the grand-coalition flow value among players who control arcs.
- The characterizations allow verification of candidate allocations without enumerating all coalitions.
- The results apply to any network whose value function is defined by maximum flows augmented by public arcs.
Where Pith is reading between the lines
- The same characterizations might be tested on variants where public arcs have limited capacities.
- The polynomial algorithm could be adapted to compute the nucleolus even when the core is empty by relaxing the initial feasibility step.
- Similar techniques may carry over to other cooperative games whose values are defined by optimization problems rather than simple additive payoffs.
- Applications in supply chains could be checked by constructing explicit public-arc instances from real logistics data and comparing the computed nucleolus to observed cost-sharing rules.
Load-bearing premise
Public arcs can be used freely by any coalition without capacity conflicts or additional costs.
What would settle it
A concrete flow network with public arcs in which an allocation claimed to lie in the least core violates one of the derived characterizing conditions, or in which the nucleolus algorithm runs slower than polynomial time on a family of instances with non-empty cores.
Figures
read the original abstract
We study flow games with public arcs, an extension of classical cooperative flow games that allows players to use public resources. In these games, a coalition corresponds to a set of arcs, while certain arcs, called public arcs, can be used freely by any coalition. The value of a coalition is the maximum flow value achievable using the arcs controlled by the coalition along with the public arcs. These games have significant applications in financial, communication, and supply-chain networks. We investigate two solution concepts, the least core and the nucleolus. Both solution concepts provide principled ways to allocate the value of the grand coalition among individual players. We provide characterizations of the least core of these games. We also give a polynomial-time algorithm to compute the nucleolus when the core is non-empty.
Editorial analysis
A structured set of objections, weighed in public.
Referee Report
Summary. The manuscript extends classical cooperative flow games by adding public arcs that any coalition may use freely when computing its max-flow value. The authors characterize the least core of the resulting TU game and present a polynomial-time algorithm for the nucleolus whenever the core is nonempty. Applications to financial, communication, and supply-chain networks are noted.
Significance. The extension models shared public resources in networks in a natural way and yields standard cooperative-game solution concepts. The polynomial-time nucleolus algorithm (when the core is nonempty) is a concrete algorithmic contribution, as nucleolus computation is NP-hard in general TU games. The paper therefore supplies both structural characterizations and an efficient computational procedure.
minor comments (3)
- [Abstract] The abstract states that characterizations of the least core are provided; the introduction or §3 should explicitly reference the theorem numbers that contain these characterizations so readers can locate them immediately.
- [§2] Notation for the set of public arcs (denoted P in the model) is introduced without a small illustrative network; adding a one-paragraph example early in §2 would improve readability without lengthening the paper.
- [§4] The complexity claim for the nucleolus algorithm is stated as polynomial; the running-time bound (e.g., O(|V|·|E|^2) or similar) should be stated explicitly in the theorem that presents the algorithm.
Simulated Author's Rebuttal
We thank the referee for the careful reading and positive evaluation of the manuscript. The report recommends minor revision but lists no specific major comments. We will address any minor editorial or presentational issues in the revised version.
Circularity Check
No significant circularity detected
full rationale
The paper defines flow games with public arcs by extending the standard max-flow value of a coalition to include freely usable public arcs, then directly applies the standard definitions of the least core and nucleolus from cooperative game theory to the resulting TU game. The claimed characterizations and polynomial-time algorithm (when the core is nonempty) are presented as consequences of this construction without any self-referential fitting, self-citation chains, or renaming of inputs as outputs. No load-bearing step reduces to its own inputs by construction, and the abstract and described approach remain self-contained against external benchmarks in cooperative game theory.
Axiom & Free-Parameter Ledger
axioms (1)
- domain assumption The value of a coalition is the maximum flow achievable using the arcs controlled by the coalition along with the public arcs.
Reference graph
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as the linear program obtained by replacing the inequalities in the linear program (P 1), and letϵ ′ 1 be the optimal objective function value of (P ′ 1). We prove that ϵ1 =ϵ ′ 1, andP 1(ϵ1) =P ′ 1(ϵ′ 1). Letx∈P 1(ϵ1). By Lemma 2,x(e)≥0,∀e∈N. Letf∈ F. LetS f ={e∈N|f(e) = 1}. IfS f ⊊N, thenx(f)−c(f)≥x(S f)−v(S f)≥ϵ 1. If Sf =N, thenx(f) =x(N) =v(N), and si...
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This shows thatP ′ 1(ϵ′ 1)⊆P 1(ϵ′
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Therefore, we have shown thatϵ 1 =ϵ ′
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[31]
17 A.3 Proof of Lemma 5 Proof.Let (π, y) be an optimal solution of the dual program (3)
SinceP 1(ϵ1)⊆P ′ 1(ϵ1) andP ′ 1(ϵ′ 1)⊆P 1(ϵ′ 1), we obtainP 1(ϵ1) =P ′ 1(ϵ′ 1). 17 A.3 Proof of Lemma 5 Proof.Let (π, y) be an optimal solution of the dual program (3). For eache∈E, define σ(e) = x(e)− π(∂ −e)−π(∂ +e) +y(e) , e∈N, − π(∂ −e)−π(∂ +e) +y(e) , e∈N 0. By dual feasibility,σ(e)≥0 andy(e)≤0,∀e∈E. Since (π, y) is dual optimal,gis optimal for...
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[32]
, kthen 21:returnx
= 0 fori= 1, . . . , kthen 21:returnx. 22:end if 23:end if 24:end loop Claim 1.If the algorithm returnsx, thenxis a relative interior point ofP 1(ϵ1). Proof.Letxbe the vector output by the algorithm, and letf∈ F x. We prove thatfis a universal flow. Lety∈P 1(ϵ1). According to step 20, we havea i(f) = 0 fori= 1, . . . , k; therefore,f∈span(F). LetF={f 1, ....
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[33]
Ify∈P ′ 1(ϵ′ 1), then for anyS⊆N, we have (y,0)(S) =y(S\ {e i})≥v ′(S\ {e i}) +ϵ ′ 1 =v(S) +ϵ ′ 1
be the least core of (N ′, v′). Ify∈P ′ 1(ϵ′ 1), then for anyS⊆N, we have (y,0)(S) =y(S\ {e i})≥v ′(S\ {e i}) +ϵ ′ 1 =v(S) +ϵ ′ 1. Thus,ϵ 1 ≥ϵ ′
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[34]
Therefore,ϵ ′ 1 ≥ϵ 1
Conversely, ifz∈P 1(ϵ1) andz(e i) = 0, then for anyS⊆N ′, we have z(S) =z(S∪ {e i})≥v(S∪ {e i}) +ϵ 1 =v ′(S) +ϵ 1. Therefore,ϵ ′ 1 ≥ϵ 1. In summary, we haveϵ 1 =ϵ ′ 1 andP ′ 1(ϵ′
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[35]
Letx= (x ′,0)
={y|(y,0)∈P 1(ϵ1)}. Letx= (x ′,0). Sincex(e i) = 0 andxis an extreme point ofP 1(ϵ1), it follows thatx ′ is an extreme point ofP ′ 1(ϵ′ 1). By induction,ϵ ′ 1 = 1 k′ −1 andk ′x′ is the convex hull of characteristic vectors of minimum cuts constrained toN ′. Ifk=k ′, thenϵ 1 =ϵ ′ 1 = 1 k −1. Since minimum cuts constrained toN ′ are also minimum cuts constr...
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