Anti-Factor is FPT Parameterized by Treewidth and List Size (but Counting is Hard)

Summary

In the general AntiFactor problem, a graph $G$ and, for every vertex $v$ of $G$, a set $X_\subseteq \mathbb{N}$ of forbidden degrees is given. The task is to find a set $S$ of edges such that the degree of $v$ in $S$ is \emph{not} in the set $X_v$. Standard techniques (dynamic programming plus fast convolution) can be used to show that if $M$ is the largest forbidden degree, then the problem can be solved in time $O*((M+2)^k)$ if a tree decomposition of width $k$ is given. However, significantly faster algorithms are possible if the sets $X_v$ are sparse: our main algorithmic result shows that if every vertex has at most $x$ forbidden degrees (we call this special case AntiFactor_x), then the problem can be solved in time $O*((x+1)^{O(k)})$. That is, AntiFactor_x is fixed-parameter tractable parameterized by treewidth $k$ and the maximum number $x$ of excluded degrees. Our algorithm uses the technique of representative sets, which can be generalized to the optimization version, but (as expected) not to the counting version of the problem. In fact, we show that #AntiFactor_1 is already #W[1]-hard parameterized by the width of the given decomposition. Moreover, we show that, unlike for the decision version, the standard dynamic programming algorithm is essentially optimal for the counting version. Formally, for a fixed nonempty set $X$, we denote by X-AntiFactor the special case where every vertex $v$ has the same set $X_v=X$ of forbidden degrees. We show the following lower bound for every fixed set $X$: if there is an $\epsilon>0$ such that #X-AntiFactor can be solved in time $O*((\max X+2-\epsilon)^k)$ given a tree decomposition of width $k$, then the Counting Strong Exponential-Time Hypothesis (#SETH) fails.