Abstract
A C-coloured graph is a graph, that is possibly directed, where the edges are coloured with colours from the set C. Clique-width is a complexity measure for C-coloured graphs, for finite sets C. Rank-width is an equivalent complexity measure for undirected graphs and has good algorithmic and structural properties. It is in particular related to the vertex-minor relation. We discuss some possible extensions of the notion of rank-width to C-coloured graphs. There is not a unique natural notion of rank-width for C-coloured graphs. We define two notions of rank-width for them, both based on a coding of C-coloured graphs by \({\mathbb{F}}^{*}\)-graphs—\(\mathbb {F}\)-coloured graphs where each edge has exactly one colour from \(\mathbb{F}\setminus \{0\},\ \mathbb{F}\) a field—and named respectively \(\mathbb{F}\) -rank-width and \(\mathbb {F}\) -bi-rank-width. The two notions are equivalent to clique-width. We then present a notion of vertex-minor for \(\mathbb{F}^{*}\)-graphs and prove that \(\mathbb{F}^{*}\)-graphs of bounded \(\mathbb{F}\)-rank-width are characterised by a list of \(\mathbb{F}^{*}\)-graphs to exclude as vertex-minors (this list is finite if \(\mathbb{F}\) is finite). An algorithm that decides in time O(n 3) whether an \(\mathbb{F}^{*}\)-graph with n vertices has \(\mathbb{F}\)-rank-width (resp. \(\mathbb{F}\)-bi-rank-width) at most k, for fixed k and fixed finite field \(\mathbb{F}\), is also given. Graph operations to check MSOL-definable properties on \(\mathbb{F}^{*}\)-graphs of bounded \(\mathbb{F}\)-rank-width (resp. \(\mathbb{F}\)-bi-rank-width) are presented. A specialisation of all these notions to graphs without edge colours is presented, which shows that our results generalise the ones in undirected graphs.
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Notes
G[X] is oriented (or undirected) if G is oriented (or undirected).
Note that symmetric and skew-symmetric matrices are σ-symmetric.
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This research is supported by the DORSO project of “Agence Nationale Pour la Recherche”.
Appendix: Proofs of Propositions 3.12 and 4.4
Appendix: Proofs of Propositions 3.12 and 4.4
If \(R\subseteq\{1,\ldots,k\}\times\{1,\ldots,k\}\times \mathbb{F}\), we let ◯ R be the composition of the functions \(add_{i,j}^{a}\) with (i,j,a)∈R. This notation is non ambiguous because \(add_{i,j}^{a}\circ add_{k,l}^{b} =add_{k,l}^{b}\circ add_{i,j}^{a}\).
Proof of Proposition 3.12.
(1) Assume \(G=\mathit{val}(t)\) for some term t in \(T(\mathcal{F}_{k}^{\mathbb{F}},\mathcal{C}_{k})\). In order to prove that is a layout of V G of \(\operatorname {cutrk}^{{\mathbb{F}}}_{G}\)-width at most k, it is enough to prove that for every subgraph H of G that is a value of a sub-term t′ of t, \(\operatorname {cutrk}^{{\mathbb{F}}}_{G}(V_{H})\leq k\). But, by the definition of operations in \(\mathcal{F}_{k}^{\mathbb{F}}\), the sub-matrix M G [V H ,V G ∖V H ] has at most k distinct rows. Thus, \(\operatorname {cutrk}^{{\mathbb{F}}}_{G}(V_{H}) =\operatorname{rk}({ M_{G}}[{V_{H}},{V_{G}\setminus V_{H}}])\leq k\).
(2) Assume \((T,\mathcal{L})\) is a layout of V G of \(\operatorname {cutrk}^{{\mathbb{F}}}_{G}\)-width k. Then, by Theorem 5.4 we can construct in time O(k 2⋅|V G |2) a term t in \(T(\mathcal{R}_{k}^{(\mathbb{F},\sigma)},\mathcal{C}_{k}^{\mathbb{F}})\) such that \(G=\mathit{val}(t)\) and . We will construct inductively, on the size of t, a term t′ in \(T(\mathcal{F}_{k'}^{\mathbb{F}},\mathcal{C}_{k'})\) with k′≤2⋅q k−1 such \(G=\mathit{val}(t')\). We let \(\beta:\mathbb{F}^{k}\to \{1,\ldots, q^{k}\}\) be a bijective function that enumerates the set of vectors in \(\mathbb{F}^{k}\) with β(O 1,k )=1. We let {2′,…,(q k)′} be a disjoint copy of the set {2,…,q k}. If \(t=\mathbf {u}\), then we let \(t':=\mathbf {\beta(u)}\). Suppose then that t=t 1⊗ M,N,P t 2. Then, we let
where R:={(β(u),β(v)′,λ)∣u⋅M⋅σ(v)T=λ}, R′:={(β(v)′,β(u),σ(λ))∣u⋅M⋅σ(v)T=λ}, h:{1,…,q k}→{1}∪{2′,…,(q k)′} is such that h(1)=1 and h(i):=i′, g:{1,…,q k}→{1,…,q k} is such that g(i):=β(β −1(i)⋅N), g′:{1}∪{2′,…,(q k)′}→{1,…,q k} is such that g′(1):=1 and g′(i′):=β(β −1(i)⋅P).
It is a straightforward induction to check that \(G=\mathit{val}(t')\) and that . □
Proof of Proposition 4.4.
(1) Assume \(G=\mathit{val}(t)\) for some term t in \(T(\mathcal{F}_{k}^{\mathbb{F}},\mathcal{C}_{k})\). In order to prove that is a layout of V G of \(\operatorname {bicutrk}^{{\mathbb{F}}}_{G}\)-width at most k, it is enough to prove that for every subgraph H of G that is a value of a sub-term t′ of t, \(\operatorname {bicutrk}^{{\mathbb{F}}}_{G}(V_{H})\leq2k\). But, by the definition of operations in \(\mathcal{F}_{k}^{\mathbb{F}}\), the sub-matrices M G [V H ,V G ∖V H ] and M G [V G ∖V H ,V H ] have at most k distinct rows. Thus, \(\operatorname {bicutrk}^{{\mathbb{F}}}_{G}(V_{H}) =\operatorname{rk}({ M_{G}}[{V_{H}},{V_{G}\setminus V_{H}}]) +\operatorname{rk}({ M_{G}}[{V_{G}\setminus V_{H}},{V_{H}}]) \leq2k\).
(2) Assume \((T,\mathcal{L})\) is a layout of V G of \(\operatorname {bicutrk}^{{\mathbb{F}}}_{G}\)-width k. Then, by Theorem 5.4 we can construct in time O(k 2⋅|V G |2) a term t in \(T(\mathcal{BR}_{k}^{\mathbb{F}},\mathcal{BC}_{k}^{\mathbb{F}})\) such that \(G=\mathit{val}(t)\) and . We will construct inductively, on the size of t, a term t′ in \(T(\mathcal{F}_{k'}^{\mathbb{F}},\mathcal{C}_{k'})\) with k′≤2⋅q k−1 such \(G=\mathit{val}(t')\). For each pair (k 1,k 2) with k 1+k 2≤k, we let \(\alpha_{k_{1},k_{2}}:\mathbb{F}^{k_{1}}\times \mathbb{F}^{k_{2}}\to\{1,\ldots,q^{k_{1}+k_{2}}\}\) be a bijective function that enumerates the set of pairs of vectors in \(\mathbb{F}^{k_{1}}\times \mathbb{F}^{k_{2}}\) with \(\alpha_{k_{1},k_{2}}((O_{1,k_{1}},O_{1,k_{2}}))=1\). We let {2′,…,(q k)′} be a disjoint copy of the set {2,…,q k}.
If \(t=\mathbf {u\cdot v}\), then we let \(t':=\mathbf {\alpha_{1,1}((u,v))}\). Suppose now that \(t=t_{1}\otimes_{M_{1},M_{2},N_{1},N_{2},P_{1},P_{2}} t_{2}\) with M 1,M 2,N 1,N 2,P 1,P 2 being respectively k 1×ℓ 1, k 2×ℓ 2, \(k_{1}\times k'_{1}\), \(k_{2}\times k'_{2}\), \(\ell_{1}\times k'_{1}\) and \(\ell_{2}\times k'_{2}\)-matrices. Then, we let
where \(R:= \{(i,j',c)\mid i=\alpha_{k_{1},k_{2}}((u_{1},u_{2})),j=\alpha_{\ell_{1},\ell_{2}}((v_{1},v_{2}))\ \textrm{and}\ u_{1}\cdot M_{1}\cdot v_{1}^{T}=c\}\), \(R':= \{(j',i,c)\mid j=\alpha_{\ell_{1},\ell_{2}}((v_{1},v_{2})),i=\alpha_{k_{1},k_{2}}((u_{1},u_{2})),\ \textrm{and}\ u_{2}\cdot M_{2}\cdot v_{2}^{T}=c\}\), h:{1,…,q k}→{1}∪{2′,…,(q k)′} is such that h(1)=1 and h(i):=i′, g:{1,…,q k}→{1,…,q k} is such that if \(\alpha_{k_{1},k_{2}}^{-1}(i)=(u_{1},u_{2})\), then \(g(i) :=\alpha_{k'_{1},k'_{2}}((u_{1}\cdot N_{1},u_{2}\cdot N_{2}))\), g′:{1}∪{2′,…,(q k)′}→{1,…,q k} is such that g′(1):=1 and if \(\alpha_{\ell_{1},\ell_{2}}^{-1}(i) =(v_{1},v_{2})\), then \(g'(i') := \alpha_{k'_{1},k'_{2}}((v_{1}\cdot P_{1},v_{2}\cdot P_{2}))\).
An easy induction shows that \(G=\mathit{val}(t')\) and that . □
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Kanté, M.M., Rao, M. The Rank-Width of Edge-Coloured Graphs. Theory Comput Syst 52, 599–644 (2013). https://doi.org/10.1007/s00224-012-9399-y
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DOI: https://doi.org/10.1007/s00224-012-9399-y