查看“︁径宽”︁的源代码

[[图论]]中，[[图 (数学)|图]]''G''的'''径分解'''（path decomposition）是''G''的“加粗”[[道路 (图论)|路径图]]表示，<ref>{{harvtxt|Diestel|Kühn|2005}}.</ref>''G''的'''径宽'''（pathwidth）是衡量形成''G''的路径被加粗的程度。更正式地说，径分解是''G''的[[顶点 (图论)|顶点]][[子集]]序列，使每条边的端点出现在某一子集中，并使每个顶点都出现在子集连续子序列中，<ref name="rs83">{{harvtxt|Robertson|Seymour|1983}}.</ref>径宽等于这样的分解中最大集的大小减一。
径宽也叫做'''区间厚度'''（interval thickness，等于''G''的[[区间图|区间]]父图中的[[最大团]]大小减一）、'''顶点分隔数'''（vertex separation number）或'''结点搜索数'''（node searching number）。<ref>{{harvtxt|Bodlaender|1998}}.</ref>

径宽与径分解同[[树宽]]、[[树分解]]关系密切，在[[图子式]]理论中起关键作用：在[[图子式]]下封闭、不含所有[[树 (图论)|森林]]的图族可描述为径宽有界，<ref name="rs83"/>子式闭图族的[[图结构定理|一般结构理论]]中出现的“涡”（vortex）的径宽也有界。<ref name="Robertson 2003">{{harvtxt|Robertson|Seymour|2003}}.</ref>径宽与径宽有界图在[[超大规模集成电路]]设计、[[绘制 (图论)|图绘制]]、[[计算语言学]]等领域也有应用。

计算任意图的径宽、甚至精确近似径宽都是[[NP困难]]的。<ref name="npc"/><ref name="bghk92">{{harvtxt|Bodlaender|Gilbert|Hafsteinsson|Kloks|1992}}.</ref>不过，这问题是[[固定参数可解]]的：测试图的径宽是否为''k''，耗时与图的大小呈线性关系，而与''k''呈上指数关系。<ref name="bounded-tw-algs"/>另外，对[[树 (图论)|树]]之类的特殊图，径宽可在多项式时间内算得，而不依赖于''k''。{{sfnp|Bodlaender|1994}}<ref name="tree-algs"/>
对图的径分解使用[[动态规划]]，可以将图算法中很多问题在径宽有界图上高效解决。<ref name="Arnborg 1985">{{harvtxt|Arnborg|1985}}.</ref>径分解也可测量[[树宽]]有界图上动态规划算法的[[空间复杂度]]。<ref name="apt00">{{harvtxt|Aspvall|Proskurowski|Telle|2000}}.</ref>

==定义==
[[File:Pathwidth.JPG|thumb|upright=1.35|径宽为2的例图''G''，其径分解宽度为2。图像下半部是相同的图与径分解，添加了颜色以示强调。（本例改编自{{harvp|Bodlaender|1994a}}，添加了记号）]]
{{harvs | last1 = Robertson | first1 = Neil | author1-link = Neil Robertson (mathematician) | last2 = Seymour | first2 = Paul | author2-link = Paul Seymour (mathematician) | year = 1983 | txt}}在[[图子式]]系列论文的第一篇中，将图''G''的径分解定义为''G''的顶点子集<math>X_i</math>序列，满足两条属性：
# 对''G''中每条边，存在''i''使边的两端点都属于子集<math>X_i</math>；
# <math>\forall i\le j\le k,\ X_i \cap X_k \subseteq X_j.</math>
第二条性质等价于要求包含任意特定顶点的子集构成整个序列的连续子列。用系列论文后期的话来说，径分解是[[树分解]]<math>(X,\ T)</math>，其中分解的底树''T''是路径图。
径分解的宽度与树分解类似，是<math>{\rm max}_i|X_i|-1</math>，''G''的径宽是''G''的径分解的最小宽度。在径宽的大多数应用中，<math>X_i</math>的大小减不减一没什么差别，主要是为了使路径图的径宽等于1。

==其他特征==
如{{harvtxt|Bodlaender|1998}}所描述的，径宽可用许多等价方法表征。

===粘合序列===
径分解可表述为图<math>G_i</math>的序列，找到来自序列中连续图的顶点对，并将图粘合在一起，所有粘合的结果就是''G''。在径分解的第一个定义中，图<math>G_i</math>可看作是集合<math>X_i</math>的[[诱导子图]]，连续（successive）诱导子图中的两顶点被''G''中相同顶点诱导时，就会被粘在一起；反之，可以把集合<math>X_i</math>恢复为图<math>G_i</math>的顶点集。则径分解的宽度比某一图<math>G_i</math>的最大顶点数少1。<ref name="rs83"/>

===区间厚度===
[[File:Interval graph.svg|thumb|upright=1.25|径宽为2的[[区间图]]，而4个最大团ABC、ACD、CDE、CDF的大小为3。]]
任意图''G''的径宽等于含''G''（以''G''为子图）的[[区间图]]的最小团数减一。<ref>{{harvtxt|Bodlaender|1998}}, Theorem 29, p. 13.</ref>即，对''G''的每种径分解，都能找到''G''的区间子图；对''G''的每个区间父图，都能找到''G''的径分解，使分解的宽度比区间图团数小1。

假设给出了''G''的径分解。则可将分解的结点表为直线上的点（按路径顺序），并将每个顶点''v''表示为以这些点为端点的闭区间。这样，包含''v''的径分解结点就对应''v''在区间中的代表点。''G''顶点形成的区间[[导出子图|交图]]是包含''G''的区间图，其最大团由包含代表点的区间集给出，大小比''G''的径宽大1。

设''G''是某区间图的子图，团数<math>p+1</math>，则''G''有宽''p''的径分解，其结点由区间图的[[最大团]]给出。例如，图中的区间图及其区间表示的径分解有5个结点，分别对应5个最大团ABC、ACD、CDE、CDF、FG；最大团大小为3，这径分解的宽度为2。
径宽与区间厚度之间的等价关系同树宽与[[弦图]]（给定图是弦图的子图）的最小团数（减一）的等价关系非常相似。区间图是弦图的特例，弦图可表为共同树的子树的交图，这类似于区间图是路径子径的交图。

===顶点分隔数===
设图''G''的顶点是[[全序关系|线性有序]]的。则，''G''的顶点分隔数是满足下列条件的最小数''s''：对顶点''v''，最多''s''个顶点在排序中先于''v''，但有''v''或更靠后的顶点相邻。
''G''的顶点分隔数是''G''的任意线性排序的最小顶点分隔数。顶点分隔数由{{harvtxt|Ellis|Sudborough|Turner|1983}}定义，等于''G''的径宽。<ref>{{harvtxt|Kinnersley|1992}}; {{harvtxt|Bodlaender|1998}}, Theorem 51.</ref>
这源于前述的与区间图团数的等价关系：若''G''是区间图''I''的子图，并以所有区间端点都分离的方式表示（如图所示），则''I''的区间左端点排序的顶点分隔数比''I''的团数小1。反过来，从''G''的线性排序可推导出一种区间表示：顶点''v''的区间左端点是其在排序中的位置，右端点是''v''在排序中最后一个邻居的位置。

===结点搜索数===
图上的结点搜索策略是[[追逃对策]]的一种形式，当中一组搜索者合作追踪藏在图中的逃犯。搜索者被置于图的顶点上，逃犯可能在任意边上，位置与移动对搜索者不可见。每个回合中，搜索者的部分或全部可从顶点移动到另一顶点（任意移动，不必沿边），逃犯可以沿不经过搜索者顶点的任意路径移动。逃犯所在边的两端点都被搜索者占据时，就被抓获。图的结点搜索数是必然能抓到逃犯的最少搜索者数。如{{harvtxt|Kirousis|Papadimitriou|1985}}所示，图的结点搜索数等于其区间厚度。搜索者的最优策略是不断移动搜索者，使他们在连续回合中形成具有最小顶点分隔数的线性排序的分隔集。

==界==
[[File:Caterpillar tree.svg|thumb|[[毛虫树]]，径宽为1的最大图。]]
径宽为''k''的''n''顶点图至多有<math>k(n-k+\frac{k-1}{2})</math>条边，是最大''k''径宽图（即径宽为''k''、无论怎样添加边都必改变径宽的图）的边数。径宽为''k''的最大图要么是''k''径图要么是''k''毛虫图，它们是两种特殊的''k''树。''k''树是恰有<math>n-k</math>个[[最大团]]（含<math>k+1</math>个顶点）的[[弦图]]；在本身不是<math>(k+1)</math>团的''k''树中，每个最大团要么将图分隔成多个部分，要么包含单个叶顶点（只属于一个最大团的顶点）。''k''径图是至少有两叶的''k''树，''k''毛虫图是可分割维''k''径与一组''k''叶的''k''树，其中每片叶还与''k''径中的独立''k''团相邻。径宽为1的最大图是[[毛虫树]]。<ref>{{harvtxt|Proskurowski|Telle|1999}}.</ref>

由于径分解是树分解的特例，径宽不小于[[树宽]]，且不大于[[割宽]]，即在图顶点的最优线性排列中，前后顶点组之间割边的最小数。这是因为，顶点分隔数即前后顶点组的邻接数不大于割边数。<ref>{{harvtxt|Korach|Solel|1993}}, Lemma 3 p.99; {{harvtxt|Bodlaender|1998}}, Theorem 47, p. 24.</ref>出于类似原因，割宽不大于径宽乘顶点的[[度 (图论)|最大度]]。<ref>{{harvtxt|Korach|Solel|1993}}, Lemma 1, p. 99; {{harvtxt|Bodlaender|1998}}, Theorem 49, p. 24.</ref>

任意''n''顶点[[树 (图论)|森林]]都有径宽<math>O(\log n)</math>。<ref>{{harvtxt|Korach|Solel|1993}}, Theorem 5, p. 99; {{harvtxt|Bodlaender|1998}}, Theorem 66, p. 30. {{harvtxt|Scheffler|1992}}为''n''顶点森林的径宽提供了更紧的上界：<math>\log_3(2n+1)</math>。</ref>例如，对一个森林，总能找到恒定多的顶点，使得去掉它们后形成至多有<math>\frac{2n}{3}</math>个顶点的两片子森林。如此递归地分隔子森林，将分隔顶点置于两者之间，形成的线性排列具有对数顶点搜索数。此技术用于树分解时，可知，若''n''顶点图''G''的树宽为''t''，则''G''的径宽是<math>O(t\log n)</math>。<ref>{{harvtxt|Korach|Solel|1993}}, Theorem 6, p. 100; {{harvtxt|Bodlaender|1998}}, Corollary 24, p.10.</ref>由于[[外平面图]]、[[系列并行图]]、[[哈林图]]的树宽都有界，它们的径宽最多为对数的。

此外，径宽还通过[[线图]]，同[[团宽]]与[[割宽]]有关系。''G''的边在其线图<math>L(G)</math>中都有对应的顶点，当''G''中相应的两边有共同端点时，<math>L(G)</math>中的两顶点就是相邻的。当且仅当图族的线图的线性团宽（用邻接1个新顶点的操作取代了团宽的不交并操作）有界，图族的径宽有界。<ref>{{harvtxt|Gurski|Wanke|2007}}.</ref>若某3及以上个顶点的连通图的最大度为3，则其割宽等于线图的顶点分隔数。<ref>{{harvtxt|Golovach|1993}}.</ref>

[[平面图]]的径宽最多与顶点数的平方根成正比。<ref>{{harvtxt|Bodlaender|1998}}, Corollary 23, p. 10.</ref>找到具有这种宽度的径分解，一种方法是（与上述森林的对数宽径分解类似）用[[平面分隔定理]]找到<math>O(\sqrt n)</math>个顶点的集合，其将图分隔为至多有<math>\frac{2n}{3}</math>个顶点的两个子图，如此递归地分隔子图，最后将两子图的递归径分解连接起来。同样的技术也适用于类似分离器定理成立的任何一类图。<ref>{{harvtxt|Bodlaender|1998}}, Theorem 20, p. 9.</ref>与平面图一样，任何固定的子式闭图族中的图都有大小为<math>O(\sqrt n)</math>的分隔子，<ref>{{harvtxt|Alon|Seymour|Thomas|1990}}.</ref>因此此类图族中图的径宽也是<math>O(\sqrt n)</math>。对某类平面图，图的径宽与其[[对偶图]]的径宽必须在一常数因子范围内，对于双连通外平面图<ref>{{harvtxt|Bodlaender|Fomin|2002}}; {{harvtxt|Coudert|Huc|Sereni|2007}}.</ref>与多面体图<ref>{{harvtxt|Fomin|Thilikos|2007}}; {{harvtxt|Amini|Huc|Pérennes|2009}}.</ref>，这种形式的边界是已知的。2连通平面图的对偶图的径宽小于线图的径宽。<ref>{{harvtxt|Fomin|2003}}.</ref>至于在其他情形下，平面图径宽与对偶图径宽是否总相差某常数因子，仍是未知的。

在某些类的图中，径宽与树宽总相等。已证明的有[[余图]]、<ref name="bm90">{{harvtxt|Bodlaender|Möhring|1990}}.</ref>[[置换图]]、<ref name="bkk93">{{harvtxt|Bodlaender|Kloks|Kratsch|1993}}.</ref>[[可比图]]之[[补图|补]]、<ref name="hm94">{{harvtxt|Habib|Möhring|1994}}.</ref>[[区间序]]的可比图。<ref name="g95">{{harvtxt|Garbe|1995}}.</ref>

{{unsolved|数学|''n''顶点[[立方图]]的径宽上界是多少？}}
在[[立方图]]中，或更广义地在任何最大顶点度为3的图中，径宽不大于<math>\frac{n}{6}+o(n)</math>，其中''n''是顶点数。存在径宽为<math>0.082n</math>的立方图，但如何缩小这下界与上界<math>\frac{n}{6}</math>之间的差距，目前还不得而知。<ref name="fh06">{{harvtxt|Fomin|Høie|2006}}.</ref>

==计算径分解==
确定给定图的径宽是否大于''k''的问题是[[NP完全]]的（''k''也是输入）。<ref name="npc">{{harvtxt|Kashiwabara|Fujisawa|1979}}; {{harvtxt|Ohtsuki|Mori|Kuh|Kashiwabara|1979}}; {{harvtxt|Lengauer|1981}}; {{harvtxt|Arnborg|Corneil|Proskurowski|1987}}.</ref>计算任意''n''顶点图径宽的最坏情形的最优时间边界为<math>O(2^nn^c)</math>，''c''是常数。<ref>{{harvtxt|Fomin|Kratsch|Todinca|Villanger|2008}}.</ref>不过，已经有几种算法可在径宽较小、输入图类别有限或近似的情形下更高效地计算径分解。

===固定参数可解===
径宽是[[固定参数可解]]的：对任意常数''k''，都可测试径宽是否大于''k''，若不大于''k''，则在线性时间内找到宽''k''的径分解。<ref name="bounded-tw-algs"/>一般来说，这类算法分两阶段运行。第一阶段，假设图的径宽为''k''，以找到并非最优的径分解或树分解，宽度可作为''k''的函数而变为约束。第二阶段，对这分解运用[[动态规划]]算法，以找到最优分解。然而，已知的这类算法的时间界限是<math>k^2</math>的指数级，除了最小的''k''外，都是不切实际的。<ref>{{harvtxt|Downey|Fellows|1999}}, p.12.</ref>对于<math>k=2</math>的情形，{{harvtxt|de Fluiter|1997}}给出了基于2径宽图的结构分解的精确限行时间算法。

===特殊图类===
{{harvp|Bodlaender|1994}}调查了计算各种特殊图类的径宽的复杂性。若图''G''是有界度图、<ref name="ms88">{{harvtxt|Monien|Sudborough|1988}}.</ref>[[平面图]]、<ref name="ms88"/>有界度平面图、<ref name="ms88"/>[[弦图]]、<ref>{{harvtxt|Gustedt|1993}}.</ref>弦多米诺、<ref>{{harvtxt|Kloks|Kratsch|Müller|1995}}. 弦多米诺是顶点都属于至多2个最大团的弦图。</ref>[[可比图]]之[[补图|补]]、<ref name="hm94"/>[[二分图|二分]][[距离遗传图]]<ref name="kbmk">{{harvtxt|Kloks|Bodlaender|Müller|Kratsch|1993}}.</ref>，确定图''G''的径宽是否最大是''k''的问题仍是NP完全的。对于包含二分距离遗传图的图族（二分图、弦二分图、距离遗传图、[[循环图]]之类），也是NP完全的。<ref name="kbmk"/>

不过，对于树与森林，径宽可在线性时间内算得。<ref name="tree-algs">{{harvtxt|Möhring|1990}}; {{harvtxt|Scheffler|1990}}; {{harvtxt|Ellis|Sudborough|Turner|1994}}; {{harvtxt|Peng|Ho|Hsu|Ko|1998}}; {{harvtxt|Skodinis|2000}}; {{harvtxt|Skodinis|2003}}; {{harvtxt|Coudert|Huc|Mazauric|2012}}.</ref>对树宽有界图族（[[系列并行图]]、[[外平面图]]、[[哈林图]]）<ref name="bounded-tw-algs">{{harvtxt|Bodlaender|1996}}; {{harvtxt|Bodlaender|Kloks|1996}}</ref>、[[裂图]]<ref>{{harvtxt|Kloks|Bodlaender|1992}}; {{harvtxt|Gustedt|1993}}.</ref>、弦图之补<ref>{{harvtxt|Garbe|1995}}将此成果归功于Ton Kloks的博士论文（1993）；Garbe对区间序的可比图的多项式时间算法推广了结果，而弦图属于此类可比图。</ref>、[[置换图]]<ref name="bkk93"/>、[[余图]]<ref name="bm90"/>、[[圆弧图]]<ref>{{harvtxt|Suchan|Todinca|2007}}.</ref>、区间序的可比图<ref name="g95"/>、[[区间图]]，也可在多项式时间内计算出来。这种情形下，径宽比覆盖图的区间表示中所有点的最大区间数小1。

===近似算法===
将图的径宽近似到加常数范围内，是NP难的。<ref name="bghk92"/>
已知[[近似率]]最佳的多项式时间近似算法是<math>O((\log n)^{3/2})</math>。<ref>{{harvtxt|Feige|Hajiaghayi|Lee|2005}}.</ref>
关于计算径宽的早期近似算法，见{{harvtxt|Bodlaender|Gilbert|Hafsteinsson|Kloks|1992}}与{{harvtxt|Guha|2000}}；关于受限图类的近似计算，见{{harvtxt|Kloks|Bodlaender|1992}}。

==图子式==
图''G''的[[图子式|子式]]是由''G''通过收缩边、移除边、移除顶点得到的另一张图。图子式有深奥的理论，其中几个重要结果涉及径宽。

===排除森林===
若图族''F''对取子式封闭（即''F''成员的子式还在''F''中），则由[[罗伯森–西摩定理]]，''F''的特征是在禁子式有限集''X''中没有任何子式。<ref name="gm20">{{harvtxt|Robertson|Seymour|2004}}.</ref>例如，[[瓦格纳定理]]指出，[[平面图]]是既没有[[完整图]]<math>K_5</math>也没有[[完全二分图]]<math>K_{3,\ 3}</math>作为子式的图。很多时候，''F''的性质与''X''的性质密切相关，此类的第一个结果由{{harvtxt|Robertson|Seymour|1983}}提出，<ref name="rs83"/>将有界径宽与禁子式族中[[树 (图论)|森林]]的存在联系起来。具体来说，若存在常数''p''使''F''中图的径宽不大于''p''，则称图族''F''具有有界径宽。那么，当且仅当''F''的禁子式集''X''至少包括一个森林时，子式闭族''F''具有有界的径宽。

从一个方向来看，这结果很容易证明：若''X''不含森林，则“无''X''子式图”的径宽便无界。因为这时，无''X''子式图将包含所有森林，特别是包括[[二叉树#完美二叉树|完美二叉树]]。而一棵<math>2k+1</math>层的完美二叉树的径宽为''k''，所以这时无''X''子式图的径宽无解。从另一方向看，若''X''包含''n''顶点森林，则无''X''子式图的径宽不大于<math>n-2</math>。<ref>{{harvtxt|Bienstock|Robertson|Seymour|Thomas|1991}}; {{harvtxt|Diestel|1995}}; {{harvtxt|Cattell|Dinneen|Fellows|1996}}.</ref>
===径宽有界的障碍===
[[File:Pathwidth-1 obstructions.svg|thumb|径宽为1的图的禁子式。]]
径宽不大于''p''的性质本身对取子式封闭：若''G''的径分解宽度不大于''p''，则从''G''中删去任何边，同一径分解仍有效，且可以从''G''及其径分解中删去任意顶点而不增加宽度。同样，通过合并表示收缩后边的两端点的子径，也可在收缩边时不增加分解宽度。因此，径宽至多为''p''的图可用排除子式的集合<math>X_p</math>描述。<ref name="gm20"/><ref name="obstructions">{{harvtxt|Kinnersley|1992}}; {{harvtxt|Takahashi|Ueno|Kajitani|1994}}; {{harvtxt|Bodlaender|1998}}, p. 8.</ref>

虽然<math>X_p</math>必然包括森林，但并不是说<math>X_p</math>中的所有图都是森林：例如，<math>X_1</math>包含2张图，一个7顶点树与三角<math>K_3</math>。而<math>X_p</math>中的树集可以精确描述：它们是<math>X_{p-1}</math>中三棵树通过边，连接新的根顶点与3棵小树中任意顶点而形成的树。例如，<math>X_1</math>中的7顶点树就是这样由<math>X_0</math>中的2顶点树（一条边）组成的。基于这种构造，可以证明<math>X_p</math>中的禁子式数至少为<math>(p!)^2</math>。<ref name="obstructions"/>已计算出2径宽图的完备禁子式集<math>X_2</math>，其中包含110个图。<ref>{{harvtxt|Kinnersley|Langston|1994}}.</ref>

===结构理论===
子式闭图族的[[图结构定理]]指出，对任意图族''F''，其中的图可分解为能[[图嵌入|嵌入]]到[[亏格]]有界曲面上的图的[[团和]]，且团和的每个分量都有有界多的顶点（apex）与涡（vortex）。这里的顶点可能与其组分中任何顶点相邻，涡是径宽有界图，粘合到某组分的亏格有界嵌入的面上。涡所嵌入面周围的顶点的循环排序必须与涡的径分解相容，即，打破循环、形成线性排序必然产生顶点分隔数有界的排序。<ref name="Robertson 2003"/>这一理论中，径宽与任意子式闭图族密切相关，具有重要的算法应用。<ref>{{harvtxt|Demaine|Hajiaghayi|Kawarabayashi|2005}}.</ref>

==应用==
===超大规模集成电路===
[[超大规模集成电路]]设计中，顶点分隔问题最初是将电路分为子系统的方法，子系统边界有少量元件。<ref name="ms88"/>

{{harvtxt|Ohtsuki|Mori|Kuh|Kashiwabara|1979}}使用区间厚度模拟VLSI一维布局所需的轨道数，此布局由网络系统相互连接的模块组成。在他们的模型中，顶点代表网，若两网都连接到同一模块，就将两顶点由边相连；也就是说，若将模块与网视作[[超图]]的结点与超边，则由它们形成的图就是超图的[[线图]]。这超图的区间表示与[[图着色问题|着色]]描述了沿水平轨道（一种颜色对应一条轨道）系统的网的排列，使模块可沿轨道以线性顺序排列，并连接到相应的网。区间图都是[[完美图]]<ref>{{harvtxt|Berge|1967}}.</ref>，表明这类最佳排列中，所需颜色数等于网图的区间完备化的团数。

门矩阵布局<ref>{{harvtxt|Lopez|Law|1980}}.</ref>是一种用于[[布尔逻辑]]电路的[[CMOS]] VLSI布局。当中，信号沿“线”（垂直线段）传播，而电路的每个门则由沿水平线段的一系列器件特征构成。因此，代表门的水平线段须与代表门输入输出的线路的垂直线段交叉。与{{harvtxt|Ohtsuki|Mori|Kuh|Kashiwabara|1979}}的布局类似，通过计算以线路为顶点，以共享同一门的线对为边的图的径宽，可以找到使排列线路的垂直轨道数最小的布局。<ref name="fl89">{{harvtxt|Fellows|Langston|1989}}.</ref>这种算法方法也可为[[可编程逻辑阵列]]的折叠问题建模。<ref>{{harvtxt|Möhring|1990}}; {{harvtxt|Ferreira|Song|1992}}.</ref>

===图绘制===
径宽在[[绘制 (图论)|图绘制]]中有多个应用：
* 给定[[交叉数]]的最小图的径宽受交叉数函数的约束。<ref name="h03">{{harvtxt|Hliněny|2003}}.</ref>
* 树的顶点可画在多少条平行线上而边不交（根据对相邻顶点在线序列上摆放方式的各种自然限制），与树的径宽成正比。<ref>{{harvtxt|Suderman|2004}}.</ref>
* 图''G''的''k''交叉''h''层绘图是将''G''的顶点放置在''h''条水平线上，边在其间以单调多边形路径排列，使得最多有''k''处交叉。具有这种绘制的图的径宽由''h''与''k''的函数约束。于是，''h''、''k''为常值时，可在线性时间内确定图是都具有''k''交叉''h''层绘制。<ref name="dfkl08">{{harvtxt|Dujmović|Fellows|Kitching|Liotta|2008}}.</ref>
* ''n''顶点、径宽为''p''的图可嵌入3维格<math>p\times p\times n</math>，使得边（表为格点间的直线段）不交。于是，径宽有界图具有此种线性体积嵌入。<ref>{{harvtxt|Dujmović|Morin|Wood|2003}}.</ref>

===编译器设计===
[[高级语言]]的[[编译]]过程中，径宽见于重排直线代码序列（即无[[控制流]]分支或循环的代码）问题，使代码算得的所有值都可[[寄存器配置|放在寄存器中]]，而不必溢出到主内存中。这种应用中，我们将待编译代码表为[[有向无环图]]，其中结点是代码的输入输出值。这个DAG中，结点''x''到结点''y''的边表示''x''值是操作了''y''的输入之一。此DAG的顶点的[[拓扑排序]]表示代码的有效重排，在给定排序中评估代码所需的寄存器数由排序的顶点分隔数给出。<ref name="bgt98">{{harvtxt|Bodlaender|Gustedt|Telle|1998}}.</ref>

对表示寄存器数的任意定值''w''，可在限行时间内确定一段直线代码能否重排，以便用不多于''w''个寄存器求值。若拓扑排序的顶点分隔数最多为''w''，则所有排序中的最小顶点分隔也不会更大，于是忽略DAG方向形成的无向图的径宽不大于''w''。可用已知的固定参数可解算法计算径宽，若是，则可在假设''w''为常数的线性时间内找到无向图的径分解。找到径分解，就可用动态规划，在线性时间内找到宽''w''的拓扑排序。<ref name="bgt98"/>

===语言学===
{{harvtxt|Kornai|Tuza|1992}}描述了径宽在[[自然语言处理]]中的应用。句子被建模为图，顶点表示词，边表示词之间的关系。例如，若形容词修饰了名词，则图中这两个词之间就会有一条边。Kornai和Tuza认为，由于人类的短时记忆能力有限，<ref>{{harvtxt|Miller|1956}}.</ref>这种图的径宽一定有界（更具体地说，他们认为是6），否则人类将无法正确解析语言。

===指数算法===
图算法中的很多问题都可通过对径分解进行[[动态规划]]，在径宽较小的图上高效解决。<ref name="Arnborg 1985"/>例如，若给定''n''顶点图''G''的顶点的线性排序，就有可能在<math>O(2^wn)</math>的时间内找到''G''的最大独立集。<ref name="fh06"/>在径宽有界图上，这种方法会产生以径宽为参数的固定参数可解算法。<ref name="fl89"/>这种结果在文献中不常见，因为已经包含在以树宽为参数的类似算法；然而，即使在基于树宽的动态规划算法中，径宽也会出现衡量算法[[空间复杂度]]的过程中。<ref name="apt00"/>

同样的动态规划方法也可用于径宽无界图，产生以[[时间复杂度#指数时间|指数时间]]解决无参图问题的算法。例如，将这种方法与[[立方图]]径宽为<math>\frac{n}{6}+o(n)</math>的事实相结合，可以发现在立方图中，最大[[支配集]]的构造耗时<math>O(2^{\frac{n}{6}+o(n)})</math>，比以往方法更快。<ref name="fh06"/>类似方法还可改进立方图中[[最大割]]与最小支配集问题的指数时间算法，<ref name="fh06"/>及其他一些NP难优化问题的指数时间算法。<ref>{{harvtxt|Kneis|Mölle|Richter|Rossmanith|2005}}; {{harvtxt|Björklund|Husfeldt|2008}}.</ref>

==另见==
*[[箱性]]
*[[割宽]]
*[[树深]]
*[[退化 (图论)]]
*[[带宽 (图论)]]

*[[斯特拉勒数]]

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{{refend}}

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