By Hiroshi Nagamochi

ISBN-10: 0521878640

ISBN-13: 9780521878647

Algorithmic points of Graph Connectivity is the 1st entire ebook in this primary inspiration in graph and community idea, emphasizing its algorithmic points. as a result of its broad purposes within the fields of verbal exchange, transportation, and creation, graph connectivity has made large algorithmic growth less than the impact of the speculation of complexity and algorithms in glossy computing device technology. The ebook includes a variety of definitions of connectivity, together with edge-connectivity and vertex-connectivity, and their ramifications, in addition to comparable subject matters corresponding to flows and cuts. The authors comprehensively speak about new techniques and algorithms that permit for speedier and extra effective computing, comparable to greatest adjacency ordering of vertices. protecting either easy definitions and complex subject matters, this e-book can be utilized as a textbook in graduate classes in mathematical sciences, corresponding to discrete arithmetic, combinatorics, and operations learn, and as a reference booklet for experts in discrete arithmetic and its functions.

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**Extra info for Algorithmic aspects of graph connectivity**

**Sample text**

The next theorem, known as the max-flow min-cut theorem, is fundamental because it can provide many efficient algorithms for solving connectivity problems. The proof of this theorem will be given in the next subsection after introducing a maximum flow algorithm. 8 ([63, 72]). For an edge-weighted digraph G with a source s and a sink t, the following relation holds: max{v( f ) | (s, t)-flows f } = min{d(X ; G) | (s, t)-cuts X }. Recall that the local edge-connectivity λ(s, t; G) between two vertices s and t is defined to be min{d(X ; G) | (s, t)-cuts X }.

I) κ(s, t) internally vertex-disjoint (s, t)-paths and a minimum (s, t)-vertex cut in G can be found in O(n 1/2 m) time. (ii) Let k ≥ 1 be a given integer. Whether κ(s, t) ≥ k holds or not can be tested in O(km) time. 4 Computing Connectivities 39 vertex-disjoint (s, t)-paths and a minimum (s, t)-vertex cut in G can be found in O(km) time. Proof. When a given graph is undirected, we redefine G to be the digraph obtained by replacing each edge with two oppositely oriented edges. 17(ii). 13(iii).

Note that a vertex u ∗ is chosen in line 8 at most d(u ∗ ; G) − 1 times since |E(u ∗ ; G) − B| decreases by 1 after executing lines 7–13. Hence, line 4 (resp. line 5) is executed n (resp. u ∗ ∈V d(u ∗ ; G) = O(m)) times. Therefore, GRAPHSEARCH runs in O(m + n) time and space. 2 Algorithms and Complexities 19 If a vertex v ∈ V − S is chosen in line 4, then no other vertex in V − S is chosen until Q becomes empty; that is, all vertices reachable from v become scanned. Then a tree in (V, F) contains a vertex r ∈ R and it is a spanning tree of the component containing r .