Relationship between optimal k-distance dominating sets in a weighted graph and its spanning trees
Introduction
We consider here a generalized form of the optimal k-hop dominating set problem. Let be a weighted graph with two or more nodes, where each link has a weight . A subset of nodes is called a k-distance dominating set, in short, a k-ddset if each node y in G has distance dist from some node . Here, dist is the shortest length of a path in G connecting the nodes u and v (in short, an uv-path) based on the link lengths . We say D is an optimal k-ddset if is the smallest among all k-ddsets. If each , then the optimal k-ddset problem becomes the optimal k-hop dominating set problem. We refer the reader to [2] for the literature review and the many applications of k-ddset. We study here the relationship between optimal k-ddset of a general connected graph and those of its spanning trees.
Let = ; clearly, . We say x dominates y or, equivalently, y is dominated by x if . More generally, for , we write and for we say S dominates y. In particular, a set of nodes D is a k-ddset if and only if . For a disconnected graph G, a k-ddset of G is the union of a k-ddset for each of its connected components.
Let denote an optimal k-ddset of a weighted graph G. If , where , then every k-ddset of is a k-ddset of G. Thus, . In particular, for every spanning tree T in G, we have . If the deletion of the links from G does not increase dist for any node pair and, more generally, if dist in G implies dist in , then in G is the same as in for each node x and hence G and have the k-ddsets and thus . (Note that such a situation does not arise when for each for some .) In particular, throwing away links which have does not affect the k-ddsets of G; more generally, if , then we can throw away the link without affecting the k-ddsets.
For an xy-path , where and are the intermediate nodes, we denote its length by , where and .
Theorem 1 For each optimal k-ddset D of a connected graph G, there is a spanning tree of G such that D is an optimal k-ddset of .
Proof For the moment, let be an arbitrary k-ddset of G. First, we show the construction of the tree . We use the optimality of D for G at the very end to show that D is also an optimal k-ddset of . We partition V into m disjoint subsets , such that the subgraph of G on is connected and is an optimal k-ddset of for each i. Let = dist for and = min {}. For each , because D is a k-ddset of G. Fix a node , let i be the smallest index such that . Let be a shortest -path of length , where and . Clearly, each for . We first show that each . Clearly, . If possible, suppose for some q, we have and is the smallest index such that . This means + dist + dist, a contradiction, and therefore we have . Now, if , then as before we get and hence . This contradicts the choice of i for y and thus for each node . We now let each = { or and i is the smallest index such that }. The argument above shows that if and then there is an -path in G such that all intermediate nodes in are also in . Thus, the subgraph of G on is connected. Now we build the spanning tree . First, choose a spanning tree of the subgraph on , rooted at , such that the -path in for each is a shortest path of length ; let be the links in . Because the sets form a partition of V, the links do not contain any cycle. We now add other links of G to to form a spanning tree of G. Clearly, D is a k-ddset of . Finally, if D is not an optimal k-ddset of , then it has a k-ddset such that . This implies is a k-ddset of G, a contradiction if D is an optimal k-ddset of G. This completes the proof. □
Example 1 Fig. 1(i) shows a weighted connected graph G. For , no contains all the vertices and thus an optimal k-ddset has size ≥2. One of the many optimal 4-ddsets here is ; the node b with any of also gives an optimal 4-ddset. For , Fig. 1(ii) shows the tree of shortest-paths from a to the nodes and the tree of shortest-paths from f to the nodes , which is disjoint from . We can obtain a spanning tree for which D is an optimal 4-ddset as shown in Fig. 1(ii), which consists of , and the link .
Corollary 1 If is a spanning tree of G as in Theorem 1, then every optimal k-ddset of is an optimal k-ddset of G.
Proof Follows immediately from the argument in the last part of the proof of Theorem 1. □
We briefly mention the notion of an optimal k-ddset for a given exclusion-set of nodes , where we want to find an optimal k-ddset in G which is disjoint from X. Here, although we do not need to dominate the nodes in X we may need them to form paths from to nodes in . Thus, we cannot find by simply considering the subgraph of G on the nodes . Typically, the optimal will be larger than the optimal . We show below how to convert an exclusion-set version of the optimal k-ddset problem to the standard (unconstrained) form. If and there is at least one yz-path = , such that all its intermediate nodes are in X, then let = min, where we take if . In particular, is undefined if and only if and does not exist. Let be the reduced graph with the nodes and the links . We take the link-weight in if the latter is defined and, otherwise, . It is clear that the distance between any two nodes in is the same in G and in . Thus, the k-ddsets of G with the exclusion-set X are exactly the same as the k-ddsets of , and hence the same is true from the optimal k-ddsets.
Example 2 For the graph G in Fig. 1(i) and , is the same as and s an optimal 4-ddset of and is also an optimal 4-ddset of G which is disjoint from X. If we choose , then equals plus the link with weight and is an optimal 4-ddset of and is also an optimal 4-ddset of G which is disjoint from X.
Section snippets
Conclusion
Our main result in Theorem 1 might be useful in finding a heuristic for an optimal k-distance dominating set in a general weighted graph G, which is known to be an NP-complete problem [1] even when all link-weights . The first step in such a heuristic would be to create a spanning tree T of shortest paths from a node x. One can choose the node x such that max is minimum, and this can be done by first finding dist for all node-pairs. Next, we would determine an
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