Abstract
In our paper, we consider the following general problems: check feasibility, count the number of feasible solutions, find an optimal solution, and count the number of optimal solutions in \({{\,\mathrm{\mathcal {P}}\,}}\cap {{\,\mathrm{\mathbb {Z}}\,}}^n\), assuming that \({{\,\mathrm{\mathcal {P}}\,}}\) is a polyhedron, defined by systems \(A x \le b\) or \(Ax = b,\, x \ge 0\) with a sparse matrix A. We develop algorithms for these problems that outperform state-of-the-art ILP and counting algorithms on sparse instances with bounded elements in terms of the computational complexity. Assuming that the matrix A has bounded elements, our complexity bounds have the form \(s^{O(n)}\), where s is the minimum between numbers of non-zeroes in columns and rows of A, respectively. For \(s = o\bigl (\log n \bigr )\), this bound outperforms the state-of-the-art ILP feasibility complexity bound \((\log n)^{O(n)}\), due to Reis & Rothvoss (in: 2023 IEEE 64th Annual symposium on foundations of computer science (FOCS), IEEE, pp. 974–988). For \(s = \phi ^{o(\log n)}\), where \(\phi \) denotes the input bit-encoding length, it outperforms the state-of-the-art ILP counting complexity bound \(\phi ^{O(n \log n)}\), due to Barvinok et al. (in: Proceedings of 1993 IEEE 34th annual foundations of computer science, pp. 566–572, https://doi.org/10.1109/SFCS.1993.366830, 1993), Dyer, Kannan (Math Oper Res 22(3):545–549, https://doi.org/10.1287/moor.22.3.545, 1997), Barvinok, Pommersheim (Algebr Combin 38:91–147, 1999), Barvinok (in: European Mathematical Society, ETH-Zentrum, Zurich, 2008). We use known and new methods to develop new exponential algorithms for Edge/Vertex Multi-Packing/Multi-Cover Problems on graphs and hypergraphs. This framework consists of many different problems, such as the Stable Multi-set, Vertex Multi-cover, Dominating Multi-set, Set Multi-cover, Multi-set Multi-cover, and Hypergraph Multi-matching problems, which are natural generalizations of the standard Stable Set, Vertex Cover, Dominating Set, Set Cover, and Maximum Matching problems.
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Notes
The notation \(\phi = {{\,\textrm{size}\,}}(A,b,c)\) denotes the input bit-encoding length.
For simplicity reasons, we assume that \({{\,\mathrm{\mathcal {P}}\,}}\) is bounded here. The unbounded case can be easily handled, see the proof of Theorem 3, e.g.
Saying "integrally equivalent" we mean that the sets of integer solutions of both systems are connected by a bijective unimodular map.
The words "modulo polyhedra with lines" mean that the sum can contain additional terms of the form \([{{\,\mathrm{\mathcal {M}}\,}}]\), where \({{\,\mathrm{\mathcal {M}}\,}}\) is a polyhedron with lines.
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Acknowledgements
Section 2 was prepared within the framework of the Basic Research Program at the National Research University Higher School of Economics (HSE). Sections 2.2 and 3 were prepared under financial support of Russian Science Foundation Grant No. 21-11-00194. Additionally, the authors would thank the anonymous reviewers who offered important comments that significantly improved our work.
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Appendices
Appendix A: Proof of Theorem 10
Proof
Fix a parameter r and let \({{\,\mathrm{\mathcal {I}}\,}}= \{-r, \dots , r\}\). For \(a \in {{\,\mathrm{\mathcal {A}}\,}}\), denote \({{\,\mathrm{\mathcal {H}}\,}}_a = \{x \in {{\,\mathrm{\mathcal {I}}\,}}^n :a^\top x = 0\}\), and let
Consider a polynomial \(f :{{\,\mathrm{\mathbb {R}}\,}}^n \rightarrow {{\,\mathrm{\mathbb {R}}\,}}\) given by the formula
Clearly, f is a homogeneous polynomial with \(\deg (f) = |{{{\,\mathrm{\mathcal {A}}\,}}}| = m\). Let \({{\,\mathrm{\mathcal {R}}\,}}= \{ x \in {{\,\mathrm{\mathcal {I}}\,}}^{n} :f(x) = 0\}\) be the roots of f inside \({{\,\mathrm{\mathcal {I}}\,}}^{n}\). Note that \({{\,\mathrm{\mathcal {R}}\,}}= \bigcup _{a \in {{\,\mathrm{\mathcal {A}}\,}}} {{\,\mathrm{\mathcal {H}}\,}}_a\) and \({{\,\mathrm{\mathcal {N}}\,}}= {{\,\mathrm{\mathcal {I}}\,}}^n \setminus {{\,\mathrm{\mathcal {R}}\,}}\). Due to the known Schwartz–Zippel lemma, \(|{{{\,\mathrm{\mathcal {R}}\,}}}| \le \deg (f) \cdot |{{{\,\mathrm{\mathcal {I}}\,}}}|^{n-1} = m \cdot (2r+1)^{n-1}\). Therefore, \(|{{{\,\mathrm{\mathcal {N}}\,}}}| \ge (2 r + 1)^n - m \cdot (2 r + 1)^{n-1} = (2 r + 1)^{n-1} \cdot (2 r + 1 - m)\), and consequently
Assign \(r:= m\). After that, the previous inequality becomes \(\frac{|{{{\,\mathrm{\mathcal {N}}\,}}}|}{|{{{\,\mathrm{\mathcal {I}}\,}}^n}|} > 1/2\). Now, to find a vector z that can satisfy the claims
-
1.
\(a^\top z \not = 0\), for any \(a \in {{\,\mathrm{\mathcal {A}}\,}}\);
-
2.
\(\Vert z\Vert _{\infty } \le m\);
we uniformly sample points z inside \({{\,\mathrm{\mathcal {I}}\,}}^n\). With a probability at least 1/2 it will satisfy the first claim. The second claim is satisfied automatically. Therefore, the expected number of sampling iterations is O(1). The arithmetic complexity of a single iteration is clearly bounded by \(O(n \cdot m)\), which completes the proof. \(\square \)
Appendix B: Proof of the Lemma 2
1.1 A recurrent formula for the generating function of a group polyhedron
Let \({{\,\mathrm{\mathcal {G}}\,}}\) be an arbitrary finite Abelian group and \(g_1,\dots ,g_n \in {{\,\mathrm{\mathcal {G}}\,}}\). Let additionally \(r_i = |{\langle g_i \rangle }|\) be the order of \(g_i\), for \(i \in \{1, \dots , n\}\), and \(r_{\max } = \max _{i} \{r_i\}\). For \(g' \in {{\,\mathrm{\mathcal {G}}\,}}\) and \(k \in \{1, \dots , n\}\), let \({{\,\mathrm{\mathcal {M}}\,}}(k,g')\) be the solutions set of the following system:
Consider the formal power series \( {{\,\mathrm{\mathfrak {f}}\,}}_k(g';{{\,\mathrm{\textbf{x}}\,}}) = \sum \limits _{z \in {{\,\mathrm{\mathcal {M}}\,}}(k,g') \cap {{\,\mathrm{\mathbb {Z}}\,}}^k} {{\,\mathrm{\textbf{x}}\,}}^z. \) For \(k = 1\), we clearly have
If such s does not exist, we put \({{\,\mathrm{\mathfrak {f}}\,}}_1(g';{{\,\mathrm{\textbf{x}}\,}}):= 0\). Clearly, the series \({{\,\mathrm{\mathfrak {f}}\,}}_1(g';{{\,\mathrm{\textbf{x}}\,}})\) absolutely converges to the corresponding right-hand side function for any \(x_1 \in {{\,\mathrm{\mathbb {C}}\,}}\) with \(|{x_1^{r_1}}| < 1\). For any value of \(x_k \in {{\,\mathrm{\mathbb {Z}}\,}}_{\ge 0}\), the system (B1) can be rewritten as
Hence, for \(k \ge 1\), we have
where the numerator is a polynomial with coefficients \(\epsilon _{i_1,\dots ,i_k} \in \{0,1\}\) and degree at most \((r_1 - 1) \dots (r_k - 1)\). Since a sum of absolutely convergent series is absolutely convergent, it follows from the induction principle that the series \({{\,\mathrm{\mathfrak {f}}\,}}_k(g';{{\,\mathrm{\textbf{x}}\,}})\) absolutely converges to the right-hand side of the formula (B4) when \(|{x_i^{r_i}}| < 1\) for each \(i \in \{1, \dots , k\}\).
1.2 The group \({{\,\mathrm{\mathcal {G}}\,}}\), induced by the SNF, of A
Recall that \(A \in {{\,\mathrm{\mathbb {Z}}\,}}^{n \times n}\), \(0 < \Delta = |{\det (A)}|\), and \(h_1, \dots , h_n\) are the columns of \(A^*:= \Delta \cdot A^{-1}\). The vector \(c \in {{\,\mathrm{\mathbb {Z}}\,}}^n\) is chosen, such that \(\langle c, h_i \rangle > 0\), for each \(i \in \{1, \dots , n\}\), and \(\psi = \max _i |{ \langle c, h_i \rangle }|\). Additionally, let \(S = P A Q\) be the SNF of A, where \(P,Q \in {{\,\mathrm{\mathbb {Z}}\,}}^{n \times n}\) are unimodular, and \(\sigma = S_{n n}\).
Let us consider the sets \({{\,\mathrm{\mathcal {M}}\,}}(k,g')\), induced by the group system (B1) with \({{\,\mathrm{\mathcal {G}}\,}}= {{\,\mathrm{\mathbb {Z}}\,}}^{n}/S{{\,\mathrm{\mathbb {Z}}\,}}^n\) and \(g_i = P_{* i} \bmod S{{\,\mathrm{\mathbb {Z}}\,}}^n\). Note that \(r_i \le \sigma \), for each \(i \in \{1, \dots , n\}\). Additionally, let us consider a new formal series, defined by
which can be derived from the series \({{\,\mathrm{\mathfrak {f}}\,}}_k(g';{{\,\mathrm{\textbf{x}}\,}})\) by the monomial substitution \(x_i \rightarrow {{\,\mathrm{\textbf{x}}\,}}^{-h_i}\). For \({\hat{{{\,\mathrm{\mathfrak {f}}\,}}}}_k(g';{{\,\mathrm{\textbf{x}}\,}})\), the formulae (B2), (B3) and (B4) become:
Clearly, here the absolute convergence takes place for the values of \({{\,\mathrm{\textbf{x}}\,}}\) with \(|{{{\,\mathrm{\textbf{x}}\,}}^{- r_i h_i}}| < 1\), for each \(i \in \{1, \dots , k\}\). Let us consider now the formal series
which can be derived from \({\hat{{{\,\mathrm{\mathfrak {f}}\,}}}}_k(g';{{\,\mathrm{\textbf{x}}\,}})\) by the substitution \(x_i \rightarrow e^{\tau \cdot c_i}\). For \({{\,\mathrm{\mathfrak {g}}\,}}_k(g'; \tau )\), the formulae (B5), (B6), and (B7) become:
Since the series \({\hat{{{\,\mathrm{\mathfrak {f}}\,}}}}_k(g';{{\,\mathrm{\textbf{x}}\,}})\) absolutely converges, when \(|{{{\,\mathrm{\textbf{x}}\,}}^{- r_i h_i}}| < 1\), for each \(i \in \{1, \dots , k\}\), the new one converges, for any \(\tau > 0\). Since \(\langle c,h_i \rangle \in {{\,\mathrm{\mathbb {Z}}\,}}_{\not =0}\), for each i, the number of terms \(e^{-\langle c, \cdot \rangle \cdot \tau }\) is bounded by \(2 \cdot k \cdot \sigma \cdot \psi + 1\). So, after combining similar terms, the numerator’s length becomes \(O(k \cdot \sigma \cdot \psi )\). In other words, there exist coefficients \(\epsilon _i \in {{\,\mathrm{\mathbb {Z}}\,}}_{\ge 0}\), such that
The formulae (B8), (B9), and (B11) coincide with the desired formulae (17), (18), and (19). So, the proof of Lemma 2 is finished.
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Gribanov, D., Shumilov, I., Malyshev, D. et al. Faster algorithms for sparse ILP and hypergraph multi-packing/multi-cover problems. J Glob Optim (2024). https://doi.org/10.1007/s10898-024-01379-z
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DOI: https://doi.org/10.1007/s10898-024-01379-z