Edge-connectivity of undirected and directed hypergraphs
Edge-connectivity of undirected and directed hypergraphs
Edge-connectivity of undirected and directed hypergraphs
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48 Chapter 3. <strong>Edge</strong>-<strong>connectivity</strong> augmentation <strong>of</strong> <strong>hypergraphs</strong><br />
3.1.1 <strong>Edge</strong>-<strong>connectivity</strong> augmentation <strong>of</strong> graphs<br />
Initial deep results on the edge-<strong>connectivity</strong> augmentation <strong>of</strong> graphs are due to Lovász<br />
[55] <strong>and</strong> to Watanabe <strong>and</strong> Nakamura [71], on the minimum number <strong>of</strong> edges needed to<br />
be added to a graph to make it k-edge-connected (this is called the minimum cardinality<br />
problem). Watanabe <strong>and</strong> Nakamura gave the following characterization:<br />
Theorem 3.1 (Watanabe, Nakamura [71]). Let G0 = (V, E0) be a graph, <strong>and</strong> k ≥ 2<br />
an integer. G0 can be made k-edge-connected by adding at most γ new edges if <strong>and</strong> only if<br />
<br />
(k − dG0(Z)) ≤ 2γ for every subpartition F <strong>of</strong> V .<br />
Z∈F<br />
Not that the theorem does not hold for k = 1, but in that case even the minimum cost<br />
problem is solvable in polynomial time. For k ≥ 2 the minimum cost problem is NP-<br />
complete. Watanabe <strong>and</strong> Nakamura showed that a minimum cardinality augmentation<br />
can be obtained in polynomial time by repeatedly increasing the edge-<strong>connectivity</strong> <strong>of</strong> the<br />
graph by one using the minimum number <strong>of</strong> edges. However, this algorithm is not strongly<br />
polynomial.<br />
Frank [29] gave the first strongly polynomial algorithm for this problem. The algorithm<br />
relies on the following result concerning degree specified augmentation:<br />
Theorem 3.2. Let G0 = (V, E0) be a graph, k ≥ 2 an integer, <strong>and</strong> m : V → Z+ a degree<br />
specification such that m(V ) is even. There is a graph G such that dG(v) = m(v) for every<br />
v ∈ V <strong>and</strong> G0 + G is k-edge-connected if <strong>and</strong> only if<br />
m(X) ≥ k − dG0(X) for every ∅ = X ⊂ V .<br />
Furthermore, Frank proved in [29] that the local edge-<strong>connectivity</strong> augmentation <strong>of</strong><br />
graphs (i.e. when for every pair u, v ∈ V there is a local edge-<strong>connectivity</strong> requirement<br />
r(u, v)) can also be solved in strongly polynomial time. These pro<strong>of</strong>s use the so-called<br />
splitting-<strong>of</strong>f technique to solve the degree specified problem. Splitting <strong>of</strong>f at a given node<br />
s ∈ V means deleting edges st1 <strong>and</strong> st2, <strong>and</strong> adding a new edge t1t2. A sequence <strong>of</strong> splitting-<br />
<strong>of</strong>f operations that isolate the node s is called a complete splitting at s. The splitting-<strong>of</strong>f<br />
operation was originally introduced by Lovász [55] <strong>and</strong> subsequently developed further<br />
by Mader ([58], [59]) <strong>and</strong> others. Here we cite the result <strong>of</strong> Mader [58] on splitting-<strong>of</strong>f<br />
preserving local edge-<strong>connectivity</strong>.<br />
Theorem 3.3 (Mader [58]). Let G = (V + s, E) be a connected graph, where d(s) = 3<br />
<strong>and</strong> there is no cut-edge or loop incident to s. Then there are edges st1 ∈ E <strong>and</strong> st2 ∈ E<br />
such that for the graph G ′ = (V, E − {st1, st2} + {t1t2}), λG ′(u, v) = λG(u, v) for every<br />
u, v ∈ V .