Graph Bandwidth

In graph theory, the graph bandwidth problem is to label the vertices of a graph with distinct integers so that the quantity $\max\$ is minimized ( is the edge set of ).
The problem may be visualized as placing the vertices of a graph at distinct integer points along the ''x''-axis so that the length of the longest edge is minimized. Such placement is called linear graph arrangement, linear graph layout or linear graph placement.

The weighted graph bandwidth problem is a generalization wherein the edges are assigned weights and the cost function to be minimized is $\max\$.

In terms of matrices, the (unweighted) graph bandwidth is the minimal bandwidth of a symmetric matrix which is an adjacency matrix of the graph.
The bandwidth may also be defined as one less than the maximum clique size in a proper interval supergraph of the given graph, chosen to minimize its clique size .

Cyclically interval graphs

For fixed $k$ define for every $i$ the set
$I_k(i) := [i, i+k+1)$. $G_k(n)$ is the corresponding interval graph formed from
the intervals $I_k(1), I_k(2), ... I_k(n)$. These are exactly the proper interval
graphs of graphs having bandwidth $k$. These graphs called be
cyclically interval graphs because the intervals can be assigned to layers
$L_1, L_2, ... L_$ in cyclically order, where the intervals of a layer doesn't
intersect.

Therefore, one see the relation to the pathwidth. Pathwidth restricted graphs are minor closed but
the set of subgraphs of cyclically interval graphs are not. This follows from the fact, that thrinking
degree 2 vertices may increase the bandwidth.

Alternate adding vertices on edges can decrease the bandwidth. Hint: The last problem is known as
topologic bandwidth. An other graph measure related through the bandwidth is the
bisection bandwidth.

Bandwidth formulas for some graphs

For several families of graphs, the bandwidth $\varphi(G)$ is given by an explicit formula.

The bandwidth of a path graph ''P''_''n'' on ''n'' vertices is 1, and for a complete graph ''K''_''m'' we have $\varphi(K_n)=n-1$. For the complete bipartite graph ''K''_''m'',''n'',

:$\varphi(K_) = \lfloor (m-1)/2\rfloor+n$, assuming $m \ge n\ge 1,$

which was proved by Chvátal. As a special case of this formula, the star graph $S_k = K_$ on ''k'' + 1 vertices has bandwidth $\varphi(S_) = \lfloor (k-1)/2\rfloor+1$.

For the hypercube graph $Q_n$ on $2^n$ vertices the bandwidth was determined by to be
:$\varphi(Q_n)=\sum_^ \binom.$

Chvatálová showed that the bandwidth of the ''m'' × ''n'' square grid graph $P_m \times P_n$, that is, the Cartesian product of two path graphs on $m$ and $n$ vertices, is equal to min.

Bounds

The bandwidth of a graph can be bounded in terms of various other graph parameters. For instance, letting χ(''G'') denote the chromatic number of ''G'',

: $\varphi(G) \ge \chi(G) - 1;$

letting diam(''G'') denote the diameter of ''G'', the following inequalities hold:

:$\lceil (n-1)/\operatorname(G) \rceil \le \varphi(G) \le n - \operatorname(G),$

where $n$ is the number of vertices in $G$.

If a graph ''G'' has bandwidth ''k'', then its pathwidth is at most ''k'' , and its tree-depth is at most ''k'' log(''n''/''k'') . In contrast, as noted in the previous section, the star graph ''S''_''k'', a structurally very simple example of a tree, has comparatively large bandwidth. Observe that the pathwidth of ''S''_''k'' is 1, and its tree-depth is 2.

Some graph families of bounded degree have sublinear bandwidth: proved that if ''T'' is a tree of maximum degree at most ∆, then

:$\varphi(T) \le \frac.$

More generally, for planar graphs of bounded maximum degree at most ''∆'', a similar bound holds (cf. ):

:$\varphi(G) \le \frac.$

Computing the bandwidth

Both the unweighted and weighted versions are special cases of the quadratic bottleneck assignment problem.
The bandwidth problem is NP-hard, even for some special cases.Garey–Johnson: GT40 Regarding the existence of efficient
approximation algorithms, it is known that the bandwidth is NP-hard to approximate within any constant, and this even holds when the input graphs are restricted to caterpillar trees with maximum hair length 2 .
For the case of dense graphs, a 3-approximation algorithm was designed by .
On the other hand, a number of polynomially-solvable special cases are known."Coping with the NP-Hardness of the Graph Bandwidth Problem", Uriel Feige, ''Lecture Notes in Computer Science'', Volume 1851, 2000, pp. 129-145, A heuristic algorithm for obtaining linear graph layouts of low bandwidth is the Cuthill–McKee algorithm. Fast multilevel algorithm for graph bandwidth computation was proposed in.

Applications

The interest in this problem comes from some application areas.

One area is sparse matrix/band matrix handling, and general algorithms from this area, such as Cuthill–McKee algorithm, may be applied to find approximate solutions for the graph bandwidth problem.

Another application domain is in electronic design automation. In standard cell design methodology, typically standard cells have the same height, and their placement is arranged in a number of rows. In this context, graph bandwidth problem models the problem of placement of a set of standard cells in a single row with the goal of minimizing the maximal propagation delay (which is assumed to be proportional to wire length).

See also

*Cutwidth and pathwidth, different NP-complete optimization problems involving linear layouts of graphs.

References

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*{{Cite journal
, last1 = Karpinski , first1 = Marek
, last2 = Wirtgen , first2 = Jürgen
, last3 = Zelikovsky , first3 = Aleksandr
, title = An Approximation Algorithm for the Bandwidth Problem on Dense Graphs
, journal = Electronic Colloquium on Computational Complexity
, volume = 4 , number = 17
, year = 1997
, url = http://eccc.hpi-web.de/report/1997/017/

External links

Minimum bandwidth problem
in: Pierluigi Crescenzi and Viggo Kann (eds.), ''A compendium of NP optimization problems.'' Accessed May 26, 2010.

Graph algorithms
Combinatorial optimization
NP-hard problems
Graph invariants