Abstract 1 Introduction 2 Preliminaries 3 Planar Straight-line Dominance Drawings are Difficult to Get 4 𝒔𝒕-plane 𝟑-trees 5 Left-non-transitive 𝒔𝒕-plane graphs 6 Conclusions and Open Problems References

On Planar Straight-Line Dominance Drawings

Patrizio Angelini ORCID John Cabot University, Rome, Italy Michael A. Bekos ORCID University of Ioannina, Greece Giuseppe Di Battista ORCID Università degli Studi Roma Tre, Rome, Italy Fabrizio Frati ORCID Università degli Studi Roma Tre, Rome, Italy Luca Grilli ORCID Università degli Studi di Perugia, Italy Giacomo Ortali ORCID Università degli Studi di Perugia, Italy
Abstract

We study the following question, which has been considered since the 90’s: Does every st-planar graph admit a planar straight-line dominance drawing? We show concrete evidence for the difficulty of this question, by proving that, unlike upward planar straight-line drawings, planar straight-line dominance drawings with prescribed y-coordinates do not always exist and planar straight-line dominance drawings cannot always be constructed via a contract-draw-expand inductive approach. We also show several classes of st-planar graphs that always admit a planar straight-line dominance drawing. These include st-planar 3-trees in which every stacking operation introduces two edges incoming into the new vertex, st-planar graphs in which every vertex is adjacent to the sink, and st-planar graphs in which no face has the left boundary that is a single edge.

Keywords and phrases:
st-graphs, dominance drawings, planar straight-line drawings, upward planarity
Funding:
Giuseppe Di Battista: Supported by the European Union, Next Generation EU, Mission 4, Component 1, CUP C53D23003680006 PRIN project no. 2022TS4Y3N “EXPAND: scalable algorithms for EXPloratory Analyses of heterogeneous and dynamic Networked Data”.
Fabrizio Frati: Supported by the European Union, Next Generation EU, Mission 4, Component 1, CUP J53D23007130006 PRIN proj. 2022ME9Z78 “NextGRAAL: Next-generation algorithms for constrained GRAph visuALization”.
Luca Grilli: Supported by MUR PNRR project SERICS (COVERT: CUP_J93C23002310006), funded by the European Union – Next Generation EU.
Copyright and License:
[Uncaptioned image] © Patrizio Angelini, Michael A. Bekos, Giuseppe Di Battista, Fabrizio Frati, Luca Grilli, and
Giacomo Ortali; licensed under Creative Commons License CC-BY 4.0
2012 ACM Subject Classification:
Theory of computation Computational geometry
; Mathematics of computing Graph algorithms
Acknowledgements:
This research initiated at the First Summer Workshop on Graph Drawing (SWGD 2021). Thanks to the organizers and the participants for an inspiring atmosphere.
Editors:
Pat Morin and Eunjin Oh

1 Introduction

Drawings of directed graphs are an evergreen research topic in the graph drawing literature. Early papers on the subject go back to the 80’s [13, 14, 34] and the number of papers on the topic published since 2023 is in double digits [1, 2, 3, 4, 6, 7, 9, 10, 11, 12, 16, 20, 22, 23, 24, 25, 28, 30]. From an applicative perspective, many domains require techniques for visualizing directed graphs, such as visualization tools for biological networks and SIEM systems for cyber threat intelligence. Many standards for drawing directed graphs have been defined, and in most of them the drawing is upward, i.e., each edge is represented by a Jordan arc whose y-coordinates monotonically increase from the tail to the head of the edge. Di Battista and Tamassia [14] proved that every upward planar graph (that is, a directed graph that admits an upward planar drawing) admits an upward planar straight-line drawing, a result analogous to Fary’s celebrated result about the geometric realizability of planar graphs [19]. In order to prove the geometric realizability of upward planar graphs, it suffices to look at upward planar graphs whose faces are delimited by 3-cycles. Indeed, every upward planar graph is a subgraph of an st-planar graph [14] (that is, an upward planar graph with a single source s and a single sink t), which in turn is a subgraph of a maximal st-planar graph [14] (that is, an st-planar graph to which no edge can be added without losing simplicity or upward planarity).

One of the easiest algorithms, if not the easiest algorithm, for constructing upward planar straight-line drawings is due to Di Battista, Tamassia and Tollis [15]. This algorithm assigns x- and y-coordinates to the vertices simply by performing two pre-order traversals of the input st-planar graph. Moreover, the algorithm constructs upward planar straight-line drawings that are actually dominance drawings. These are xy-monotone drawings (that is, each edge is represented by a Jordan arc whose x- and y-coordinates monotonically increase from the tail to the head of the edge) such that, for any pair of vertices u,v, there exists a directed path from u to v in the graph if and only if x(u)x(v) and y(u)y(v) hold in the drawing. Dominance drawings constitute an interesting graph drawing style because they express the reachability between vertices by their dominance relationship, i.e., by the coordinates assigned to them; this allows one to answer reachability queries in constant time, see, e.g, [27, 35]. For more about dominance drawings, see, e.g., [5, 8, 18, 26, 31, 32, 34]. Figure 1 shows planar straight-line drawings of an st-planar graph that are non-upward, upward (and not xy-monotone), xy-monotone (and not dominance), and dominance.

(a) Non-upward.
(b) Upward.
(c) xy-monotone.
(d) Dominance.
Figure 1: Four planar straight-line drawings of an st-planar graph G. (a) A non-upward drawing. (b) An upward drawing. (c) An xy-monotone drawing. (d) A dominance drawing.

Di Battista, Tamassia and Tollis’s algorithm [15] does not actually construct an upward planar straight-line drawing of every st-planar graph. Indeed, it may construct a non-planar drawing if the input st-planar graph contains transitive edges, where an edge is transitive if the graph contains a directed path from the tail to the head of the edge. By subdividing each transitive edge with a new vertex, their algorithm constructs a planar dominance drawing of any st-planar graph in which each edge is either a straight-line segment (if it is non-transitive) or a 1-bend polyline (if it is transitive). Whether this bend per edge can be eliminated by designing an algorithm different from the one in [15] is the question we study in this paper.

Formally, we ask: Does every st-planar graph admit a planar straight-line dominance drawing? Apart from the st-planar graphs without transitive edges, the question is known to have a positive answer for series-parallel digraphs [8]. We prove the following results.

  • In Section 3, we prove a remarkable difference between dominance and upward drawings. We revisit the two main approaches for the construction of upward planar straight-line drawings of st-planar graphs and prove that they cannot be successfully applied to construct planar straight-line dominance drawings. The first approach [14] contracts an internal edge of the graph, constructs a drawing inductively, and then expands the previously contracted edge to be a “short” segment. We show that there exist st-planar graphs in which no edge can be used in the contract-draw-expand approach so to get a planar straight-line dominance drawing. The second method [17, 21, 33] prescribes the y-coordinates of the vertices, so that the tail of any edge is assigned a smaller y-coordinate than its head. This additional constraint on the drawing allows for easier recursive schemes for its construction. We prove that planar straight-line dominance drawings with prescribed y-coordinates do not always exist. We believe that these results provide solid evidence for the difficulty of constructing planar straight-line dominance drawings.

  • In Section 4, we study st-planar graphs whose underlying graph is a planar 3-tree. Planar 3-trees, also known as stacked triangulations and Apollonian networks, constitute a common benchmark for planar graph drawing problems, as they allow for easy inductive constructions; for example, every planar 3-tree with at least four vertices can be constructed by “stacking” a vertex inside a face of a smaller planar 3-tree. For our question, the study of st-planar 3-trees turns out to be complicated, as inductive drawing constructions do not cope well with the dominance relationship that needs to be ensured between vertices that are “far away” in the graph. We show how to construct planar straight-line dominance drawings for two classes of st-planar 3-trees, the first one with a constraint on the orientation (every stacking operation introduces two edges incoming into the new vertex) and the second one with a constraint on the graph structure (every stacking operation happens in a face incident to the sink). The latter graph class coincides with the maximal st-planar graphs in which the sink is adjacent to every vertex.

  • In Section 5, we improve the mentioned result by Di Battista, Tamassia and Tollis [15], by proving that a planar straight-line dominance drawing always exists for any st-planar graph in which every transitive edge is to the right of every directed path from the tail to the head of the edge. This result is obtained via an ear decomposition of the graph. This shows that the problem of constructing planar straight-line dominance drawings is made difficult by the interaction between “left transitive edges” and “right transitive edges”.

All our algorithms construct drawings whose resolution is exponentially small (or worse). This drawback is sometimes necessary for upward planar straight-line drawings [15], and hence also for planar straight-line dominance drawings. However, for the graph classes we considered, we do not know whether an exponentially-small resolution is actually required in order to construct planar straight-line dominance drawings.

2 Preliminaries

A drawing of a graph maps each vertex to a distinct point in the plane and each edge to a Jordan arc between its endpoints. A drawing is straight-line if each edge is represented by a straight-line segment and planar if no two edges intersect, except at common endpoints. Two planar drawings of a connected graph are plane-equivalent if they define the same clockwise order of the edges incident to each vertex and the same clockwise order of the vertices and edges along the boundary of the outer face. A plane embedding is an equivalence class of planar drawings and a plane graph is a graph with a plane embedding. Whenever we talk about planar drawings of a plane graph, we always assume that they are in the equivalence class associated with the plane graph. An st-plane graph is an st-planar graph with a plane embedding (for its underlying graph) in which s and t are incident to the outer face. An st-plane graph is maximal if no edge can be added to it while maintaining it an st-plane graph. Since every st-planar graph can be augmented (by adding vertices and edges) to maximal without altering the reachability between vertices [14], the existence of a planar straight-line dominance drawing for all st-planar graphs can be decided by only looking at maximal st-planar graphs. Note that, in any planar straight-line dominance drawing of an st-planar graph, the vertex placements can be perturbed so that no two vertices share the same x- or the same y-coordinate and so that the drawing remains planar, straight-line and dominance. Hence, throughout the paper, every considered dominance drawing has distinct x- and distinct y-coordinates for its vertices. Two vertices in a directed graph are incomparable if no directed path goes from any of the vertices to the other one.

As a warm-up result, we prove that every Hamiltonian st-planar graph has a planar straight-line dominance drawing. A directed graph is Hamiltonian if it contains a directed path (v1=s,v2,,vn=t), where {v1,v2,,vn} is the vertex set of the graph.

Theorem 1.

Hamiltonian st-planar graphs admit planar straight-line dominance drawings.

Proof.

Consider a Hamiltonian st-planar graph G. Construct an upward planar straight-line drawing Γ of G; this always exists [14]. Stretch Γ vertically, so that the slope of every edge is in the range (45,135). Now rotate Γ in clockwise direction by 45. Since the slope of every edge is now in the range (0,90), we have that Γ is xy-monotone. Since vertical stretch and rotation are affine transformations, Γ is planar, as well. Finally, since G contains a Hamiltonian path (v1,,vn), vertex vj is reachable from vertex vi, for every 1i<jn. Since the slope of the edge (vk,vk+1) is in the range (0,90), for k=i,,j1, vertex vj is in the first quadrant of vertex vi, hence Γ is a dominance drawing.

3 Planar Straight-line Dominance Drawings are Difficult to Get

In this section, we revisit the two main approaches for the construction of upward planar straight-line drawings of st-planar graphs and prove that they cannot be enhanced (or at least not in a direct way) to construct planar straight-line dominance drawings.

3.1 Constructing Drawings via Contractions and Expansions

Di Battista and Tamassia [14] first proved that every st-plane graph admits an upward planar straight-line drawing. Their proof extends to directed graphs a well-known proof by Fáry [19], showing that every (undirected) plane graph admits a planar straight-line drawing. We briefly describe the algorithm by Di Battista and Tamassia [14].

An internal edge (u,v) of a maximal st-plane graph G is contractible if it satisfies the following conditions: (1) The vertices u and v have exactly two common neighbors, denoted by z1 and z2; note that the cycles (u,v,z1) and (u,v,z2) delimit internal faces of G. (2) For i=1,2, the edges connecting u and v with zi are both incoming or both outgoing at zi.

The contraction of a contractible edge (u,v) constructs a graph G by identifying u and v into a vertex w with the following adjacencies (see Fig 2(a)). For every neighbor z{u,v,z1,z2} of u (of v), we have that G contains an edge between w and z, which is outgoing at z if and only if the edge between u and z (resp.  between v and z) is outgoing at z. Also, for i=1,2, we have that G contains an edge between w and zi, which is outgoing at zi if and only if the edges connecting u and v with zi are both outgoing at zi. It is easy to see that G is a maximal st-plane graph.

The core of Di Battista and Tamassia’s algorithm lies in the following two statements111Di Battista and Tamassia’s proof actually distinguishes the case in which G contains a separating triangle (a 3-cycle with vertices in its interior) from the case in which it does not, performing different constructions in the two cases. However, the first case is unnecessary, as a contractible edge in an st-planar graph can always be found, similarly to what was noted by Wood [36] for undirected graphs.: (i) every maximal st-plane graph G has a contractible edge (u,v), whose contraction results in a maximal st-plane graph G; and (ii) an upward planar straight-line drawing Γ of G can be obtained from an upward planar straight-line drawing Γ of G by expanding w, that is, by replacing w with a sufficiently small segment (with a suitable slope) representing (u,v).

(a)
(b)
Figure 2: (a) The contraction of an edge (u,v) in a maximal st-plane graph. (b) A maximal st-plane graph with no dominance-expandable edge. Thin edges are not contractible, while fat edges are contractible but not dominance-expandable; for example, (1,3) is not dominance-expandable, because vertex 2 is a predecessor of vertex 3 but not a predecessor of vertex 1.

Since, depending on the geometric placement of the neighbors of w in Γ, the edge (u,v) might need to be an arbitrarily small segment in Γ, in order for Γ to be a dominance drawing we need u and v to have the same successors and predecessors. That is, let 𝒮(z) be the set of successors of a vertex z, that is, the set of all vertices z such that there exists a directed path from z to z. Analogously, let 𝒫(z) be the sets of predecessors of a vertex z. A contractible edge (u,v) is dominance-expandable if 𝒮(u)=𝒮(v){v} and 𝒫(v)=𝒫(u){u}. Di Battista and Tamassia’s approach could be enhanced to construct planar straight-line dominance drawings if every maximal st-plane graph contained a dominance-expandable edge. However, we can prove that there exist maximal st-plane graphs with no dominance-expandable edge, as the one in Fig 2(b), which constitutes a barrier for this approach we cannot overcome.

We remark that, for every graph class for which we can prove the existence of planar straight-line dominance drawings in the upcoming sections, there exist graphs in the class that do not have a dominance-expandable edge or such that the contraction of any dominance-expandable edge would result in a graph not in the same class.

3.2 Constructing Drawings by Prescribing the 𝒚-Coordinates

Eades, Feg, Lin, and Nagamochi [17] and, independently, Pach and Tóth [33] proved that every upward planar drawing can be straightened while preserving the y-coordinates of the vertices. This implies that every st-plane graph admits an upward planar straight-line drawing with prescribed y-coordinates (as long as these respect the reachability between vertices). This result was strengthened by Hong and Nagamochi [21], who proved that every internally-triconnected st-plane graph admits an upward planar straight-line convex drawing with prescribed y-coordinates and prescribed outer face. It is interesting that, while more constrained, drawings with prescribed y-coordinates (and a prescribed outer face) allow for an easier recursive construction.

We now show that, unlike upward planar straight-line drawings, planar straight-line dominance drawings with given y-coordinates do not always exist.

Theorem 2.

For every n7, there exists an st-planar graph Gn with vertex set {v1,v2,,vn} such that:

  • there exists a planar dominance drawing of Gn such that y(vi)=i, for i=1,,n; and

  • there exists no planar straight-line dominance drawing of Gn such that y(vi)=i, for i=1,,n.

(a)
(b)
Figure 3: (a) The graph for the proof of Theorem 2. (b) The rays 1,2 and 3,4 diverge.

Proof.

The st-planar graph Gn consists of the directed paths (s=v1,v2,v5), (v1,v3,v4,v5), (v5,v6,,vn=t), and of the edges (v1,v6), (v3,v6), (v3,v7), and (v1,vn). Fig 3(a) shows a planar dominance drawing of Gn with y(vi)=i, for i=1,,n. Suppose, for a contradiction, that a planar straight-line dominance drawing Γ of Gn exists with y(vi)=i, for i=1,,n. We prove that the plane embedding in Γ of the underlying graph of Gn is the one in Fig 3(a), except, possibly, for the position of the edge (s,t). Obviously, the path (v1,v2,v5,v6,,vn) has a unique plane embedding. Since v2 and v4 are incomparable and y(v2)<y(v4), we have x(v4)x(v2), hence the clockwise order of the vertices along the cycle 𝒞:=(v1,v3,v4,v5,v2) is v1,v3,v4,v5,v2. From that, we get that the edges (v3,v6) and (v3,v7) lie above the path (v3,v4,v5,v6,v7), and finally that the edge (v1,v6) lies below the path (v1,v2,v5,v6). For any distinct i,j{1,,n}, let i,j be the ray starting at vi and passing through vj. Since x(v1)<x(v3)<x(v4)x(v2), we have x(v2)x(v1)>x(v4)x(v3). Also, we have y(v2)y(v1)=y(v4)y(v3)=1. Hence, the ray 1,2 has smaller slope than the ray 3,4; that is, such rays diverge, see Fig 3(b). Since the ray 1,6 has smaller slope than 1,2, and since the ray 3,6 has larger slope than 3,4, it follows that 1,6 and 3,6 also diverge, while they meet at v6, a contradiction which proves the theorem. Note that vertices v8,,vn only serve the purpose of creating an infinite graph family.

We can similarly show that one cannot, in general, prescribe the x-coordinates of a planar straight-line dominance drawing.

Also, we can strengthen Theorem 2 by proving that, for every n10 and for every sequence y1<<yn of y-coordinates, there exists an st-planar graph Gn with vertex set {v1,,vn} such that there exists a planar dominance drawing of Gn with y(vi)=yi, for i=1,,n, and there exists no planar straight-line dominance drawing of Gn with y(vi)=yi, for i=1,,n. That is, the y-coordinates prescribed by Theorem 2 do not need to be uniformly distributed.

The key point for this is the observation that the proof of Theorem 2 works as long as y(v2)y(v1)y(v4)y(v3). Hence, we can consider the four lines y=yi, with i=4,5,6,7, and then distinguish two cases. If y5y4y7y6, we let our st-planar graph Gn contain the graph G7 from the proof of Theorem 2 and we set y(vi)=yi+3, for i=1,,7, where v1,,v7 is the vertex set of G7. Otherwise, that is, if y7y6<y5y4, we let our st-planar graph Gn contain the graph obtained by reversing the edge directions of the graph G7 and we set y(vi)=y8i, for i=1,,7, where v1,,v7 is the vertex set of G7.

4 𝒔𝒕-plane 𝟑-trees

A plane 3-tree is a plane graph recursively defined as follows. A 3-cycle embedded in the plane is a plane 3-tree. Any plane 3-tree with n4 vertices can be obtained from a plane 3-tree with n1 vertices by stacking a new vertex into an internal face, that is, by connecting the new vertex to the three vertices incident to the face. An st-plane 3-tree is an st-plane graph whose underlying graph is a plane 3-tree. In our opinion, st-plane 3-trees constitute a very challenging class of st-plane graphs for our problem. Indeed, the “natural” strategies for drawing the graphs in this class are to either recursively construct and then combine the drawings of three smaller st-plane 3-trees, or to iteratively add a single vertex to a previously constructed drawing of a smaller st-plane 3-tree; both these strategies do not cope well with the geometric relationship that has to be ensured for incomparable vertices. Nevertheless, in this section we show how to obtain planar straight-line dominance drawings of two classes of st-plane 3-trees.

4.1 Upper 𝒔𝒕-plane 𝟑-trees

Consider the construction of an st-plane 3-tree G via repeated stacking operations. If a vertex u is stacked into a face delimited by a cycle (a,b,c), where a and c are the source and the sink of the cycle, respectively, then the edge (a,u) is directed from a to u, the edge (u,c) is directed from u to c, while the edge (b,u) might be directed either way. We say that G is an upper st-plane 3-tree if, at every stacking operation, the edge that can be directed either way is always directed towards the newly inserted vertex. We have the following.

Theorem 3.

Upper st-plane 3-trees admit planar straight-line dominance drawings.

Proof.

Let G be an n-vertex upper st-plane 3-tree whose outer face is delimited by the cycle (s,m,t). Let Δ be any triangle with vertices ps,pm,pt, where x(ps)<x(pm)<x(pt) and y(ps)<y(pm)<y(pt). Also, let D be a closed disk in the interior of Δ such that, for any point p in D, we have x(pm)<x(p)<x(pt) and y(pm)<y(p)<y(pt); see Figs 4(a) and 4(c). We prove by induction that G admits a planar straight-line dominance drawing such that:

  • s lies at ps, m lies at pm, and t lies at pt; and

  • every internal vertex of G lies in the interior of D.

(a)
(b)
(c)
(d)
Figure 4: (a) and (c) Triangle Δ and disk D for the input to the induction. (b) and (d) Placing point pr (white) and disks D1, D2, and D3 (gray) inside D; an enlarged view of the placement of r and of disks D1, D2, and D3 inside D is also shown.

The statement clearly implies the theorem. In the base case, in which n=3, the triangle Δ is the required drawing of G and the statement is trivially true.

Suppose now that n>3. Let r be the first stacked vertex in the construction of G; that is, r is the unique vertex of G adjacent to s, m, and t. Note that the edge (m,r) is directed away from m, given that G is an upper st-plane 3-tree. Let G1, G2, and G3 be the subgraphs of G inside the cycles (s,m,r), (s,r,t), and (m,r,t), respectively. Note that G1 is an upper sr-plane 3-tree, G2 is an upper st-plane 3-tree, and G3 is an upper mt-plane 3-tree. Also, each of G1, G2, and G3 has less than n vertices. Let pr be any point inside D and let Δ1, Δ2, and Δ3 be the triangles (ps,pm,pr), (ps,pr,pt), and (pm,pr,pt), respectively. Place r at pr; by the properties of D, we have x(pm)<x(pr) and y(pm)<y(pr), which complies with the orientation of (m,r). Let D1, D2, and D3 be closed disks such that (see Figs 4(b) and 4(d)):

  • disk D1 lies in the interior of Δ1D, disk D2 lies in the interior of Δ2D, and disk D3 lies in the interior of Δ3D;

  • for any point pD2D3, we have x(pr)<x(p) and y(pr)<y(p); and

  • for any point p2D2 and any point p3D3, if the clockwise order of the vertices of Δ is ps,pt,pm, then we have x(p2)<x(p3) and y(p3)<y(p2), otherwise we have y(p2)<y(p3) and x(p3)<x(p2).

Clearly, disks D1, D2, and D3 with the above properties always exist. By induction, G1, G2, and G3 have planar straight-line dominance drawings Γ1, Γ2, and Γ3 with s, m, r, and t drawn at ps, pm, pr, and pt, respectively, so that the internal vertices of G1, G2, and G3 lie in the interior of D1, D2, and D3, respectively. This results in a straight-line drawing Γ of G.

Since pr, D1, D2, and D3 lie in the interior of D, all the internal vertices of G lie in the interior of D, as required. The upward planarity of Γ follows from the ones of Γ1, Γ2, and Γ3. In order to prove that Γ is a dominance drawing, consider any pair of vertices u and v.

  • If u and v belong to the same graph Gi, for some i{1,2,3}, then their placement complies with their dominance relationship, by induction.

  • If one of u and v is s, say u=s, then u is a predecessor of v, and indeed we have x(u)<x(v) and y(u)<y(v). The case u=t can be discussed similarly.

  • If neither of u and v is s or t, and one of u and v is m, say u=m, then u is a predecessor of v, since G is an upper st-plane 3-tree. Since x(pm)<x(p) and y(pm)<y(p), for any point pD, we have x(u)<x(v) and y(u)<y(v).

  • If u is an internal vertex of G1 and v is an internal vertex of G2 or G3, then u is a predecessor of v, since G is an upper st-plane 3-tree. Since, for any point pD1 and any point qD2D3, we have x(p)<x(pr)<x(q) and y(p)<x(yr)<y(q), the placement of u and v complies with their dominance relationship.

  • Finally, if u is an internal vertex of G2 and v is an internal vertex of G3, then u and v are incomparable, since G is an upper st-plane 3-tree. Since, for any point p2D2 and any point p3D3, we have x(p2)<x(p3) and y(p3)<y(p2), or y(p2)<y(p3) and x(p3)<x(p2), the placement of u and v complies with their dominance relationship.

This completes the induction and the proof of the theorem.

An analogous result holds true for st-plane 3-trees such that, at every stacking operation, the edge that can be directed either way is always directed out of the newly inserted vertex.

Trying to use a similar strategy in order to construct a planar straight-line dominance drawing of every st-plane 3-tree might be tempting. However, the “types” of internal vertices in a general st-plane 3-tree are more than three. Namely, referring to the notation introduced in the proof of the theorem, the internal vertices of G2 and G3 are not all successors of r, but rather some are predecessors, some are successors, and some are incomparable to r. Hence, the “three-disks schema” fails, and more complex geometric invariants seem to be needed.

4.2 Sink-dominant 𝒔𝒕-plane 𝟑-trees

We next look at the st-plane 3-trees in which every stacking operation happens in a face incident to the sink t of the graph. This results in an st-plane 3-tree in which the sink is adjacent to every vertex. We call this a sink-dominant st-plane 3-tree. It is easy to observe that every n-vertex maximal st-plane graph in which the sink has degree n1 is a sink-dominant st-plane 3-tree (and vice versa). We have the following.

Theorem 4.

Sink-dominant st-plane 3-trees admit planar straight-line dominance drawings.

Proof.

Let G be an n-vertex sink-dominant st-plane 3-tree whose outer face is delimited by the cycle (s,m,t).

Assumption.

If n>3, then let r be the internal vertex of G adjacent to s, m and t. If r is a predecessor of m, as in Fig 5(a), we add a new source s adjacent to s, m and t in the outer face of G, so that the outer face of the resulting graph G is delimited by the 3-cycle (s,s,t). Now m is the internal vertex of G adjacent to s, s and t; furthermore, m is a successor of s. Hence, by possibly adding a vertex and three edges to G and changing some labels, we can assume w.l.o.g. that the internal vertex r that is adjacent to the three vertices s, m and t incident to the outer face of our input st-plane 3-tree G is a successor of m.

Inductive hypothesis.

The proof is similar in spirit to, however more involved than, the proof of Theorem 3. Let Δ be any triangle with vertices ps, pm and pt, where x(ps)<x(pm)<x(pt) and y(ps)<y(pm)<y(pt). If pm lies above the line through ps and pt, we say that Δ is of type A (see Fig 5(b)), otherwise it is of type B (see Fig 5(c)). Let D and E be closed disks contained in the interior of Δ such that:

  • if Δ is of type A, then D and E are horizontally aligned, that is, they have the same two vertical tangents, while if Δ is of type B, then D and E are vertically aligned;

  • if Δ is of type A, then D is strictly below and to the right of pm, while if Δ is of type B, then D is strictly above and to the left of pm; and

  • E is strictly above and to the right of pm.

(a)
(b)
(c)
Figure 5: (a) Augmenting G so that the vertex adjacent to the three vertices on the outer face is a successor of two of them. (b) and (c) Triangle Δ and disks D and E for the input to the induction. In (b) Δ is of type A, while in (c) it is of type B.

We prove, by induction on n, that G admits a planar straight-line dominance drawing such that:

  • s lies at ps, m lies at pm, and t lies at pt;

  • every internal vertex of G that is a successor of m lies in the interior of E; and

  • every internal vertex of G that is incomparable to m lies in the interior of D.

Note that, because of the assumption that r is a successor of m, no internal vertex of G is a predecessor of m.

The statement clearly implies the theorem. In the base case, in which n=3, the triangle Δ is the required drawing of G and the statement is true. Suppose now that n>3. We only show the construction for the case in which Δ is of Type B, as the other case is analogous.

Graph structure.

Recall that r is the unique vertex of G adjacent to s, m and t, and that the edge (m,r) is directed towards r; refer to Fig 6.

Let Pm:=(v0=m,v1,,v=r) be the longest directed path from m to r. Since every vertex is adjacent to t and since r is a successor of m, we have that Pm exists and is unique. For j=1,,, let Mj be the subgraph of G induced by the vertices inside or on the boundary of the 3-cycle (vj1,vj,t) and note that Mj is a sink-dominant st-plane 3-tree. By the fact that Pm is the longest directed path from m to r, we have that, if Mj contains internal vertices, then the internal vertex of Mj that is adjacent to vj1, vj and t is a successor of vj. This implies that Mj can be drawn recursively.

Also, let Ps:=(u0=s,u1,,uk=r) be the longest directed path from s to r in G that does not pass through m. For i=1,,k, the subgraph Si of G induced by the vertices inside or on the boundary of the 3-cycle (ui1,ui,t) is a sink-dominant st-plane 3-tree. Further, if Si contains internal vertices, then the internal vertex of Si that is adjacent to ui1, ui and t is a successor of ui, hence Si can be drawn recursively.

Since every vertex of G is adjacent to t, the interior of the cycle 𝒞sm:=PsPm(s,m) does not contain any vertices, while it might contain some edges (and in fact it does, unless 𝒞sm=(s,m,r)). We are going to draw 𝒞sm as a convex curve (hence the edges in its interior will not cause crossings).

Figure 6: Paths Pm and Ps (as thick lines) and graphs M1,,M,S1,,Sk (with gray interior).
Figure 7: Drawing paths Ps and Pm, disks D1u,E1u,,Dku,Eku, and disks D1v,E1v,,Dv,Ev. For the sake of readability, some edges are drawn as curves, as the illustration is mainly meant to represent the relative placement of the vertices of the paths Ps and Pm and of the listed disks.

Construction.

We now draw Ps and Pm. We also draw disks inside the triangles representing the cycles (ui1,ui,t), for i=1,,k, and (vj1,vj,t), for j=1,,, so that induction can be applied in order to draw the subgraphs Si and Mj recursively. Refer to Fig 7 for an illustration of the relative placement of the vertices of Ps and Pm and of the desired disks.

Figure 8: Drawing vertex ui.

We start by placing r at the center of the disk E. Next, we draw the vertices u1,,uk1 in this order inside D. Let σr be the intersection of the horizontal line r through r with D, and let d1 and d2 be the leftmost and rightmost endpoints of σr, respectively. For i=1,,k1, by drawing ui, we complete the drawing of the triangle Δiu representing cycle (ui1,ui,t). Then we also place suitable disks Diu and Eiu inside Δiu so that Si can be drawn recursively.

When we have to draw ui, for some i{1,,k1}, we assume that (see Fig 8):

  • (C1) the polygonal line (u0,,ui1,r) is convex and lies below r;

  • (C2) if i>1, the line through ui2 and ui1 cuts σr in its interior, at a point pi;

  • (C3) if i>1, the segment between ui1 and t cuts σr in its interior, at a point qi; and

  • (C4) if i>1, the disks Di1u and Ei1u lie inside D and above r.

We denote by ei be the rightmost point of Ei1u. Note that conditions (C1)–(C4) are vacuous if i=1 (i.e., before drawing u1). In that case, for the sake of simplicity of the description, we let pi, qi, and ei coincide with d1.

We now explain how to draw ui. Let x¯=max{x(pi),x(qi),x(ei)}, let x~=(x(d2)+x¯)/2, where x¯<x~<x(d2), and let p~ be the point of σr with x(p~)=x~. We place ui at (x~,y(r)ϵ), where ϵ>0 is sufficiently small so that conditions (C1)–(C3) are satisfied when we have to draw ui+1. Indeed, if ϵ=0, then ui would be placed at p~ and conditions (C1)–(C3) would be trivially satisfied when we have to draw ui+1, hence they are also satisfied for some sufficiently small ϵ>0, by continuity.

We now place the disks Diu and Eiu so that they have radius δ and centers at (x~±ϵ,y(r)+ϵ), where ϵ>δ>0 are sufficiently small so that:

  • Diu and Eiu lie inside the triangle Δiu=(ui1,ui,t);

  • Diu and Eiu are lower than Di1u and Ei1u; and

  • condition (C4) is satisfied when we have to draw ui+1.

Indeed, if ϵ=δ=0 such disks would degenerate and coincide with p~, which is inside D and also inside Δiu, as the segment ui1t¯ cuts σr at a point qi to the left of p~ and the segment uit¯ cuts σr at a point to the right of p~. Hence, such disks remain inside D and Δiu if ϵ>δ>0 is sufficiently small, by continuity. Since ϵ>δ, disks Diu and Eiu lie above r, hence ensuring condition (C4). Finally, choosing δ+ϵ smaller than the distance between Ei1u and r ensures that Diu and Eiu are lower than Di1u and Ei1u.

We now draw the vertices v1,,v1 in this order. For j=1,,1, when we draw vj, we have drawn the triangle Δjv representing cycle (vj1,vj,t). Then we also show how to place suitable disks Djv and Ejv inside Δjv so that Mj can be drawn recursively. This is done very similarly to the way vertices u1,,uk1 and disks D1u,E1u,,Dk1u,Ek1u were drawn (see again Fig 7), so we only highlight the differences here.

  • First, all such vertices and disks lie inside E, rather than inside D.

  • Second, the role previously played by σr is now played by a segment σr along the vertical line r through r. The endpoints of σr are the lowest intersection point e1 of r with the boundary of E and the intersection point of r with the horizontal line through u1. This is because the vertices v1,,v1 and the disks D1v,E1v,,D1v,E1v,Dv have to be placed below (and to the right of) u1,,uk1, so to satisfy the constraints of a dominance drawing. When a vertex vj is drawn, the segment vjt¯ crosses the interior of σr.

  • Third, the triangles Δjv are of Type A, unlike the triangles Δiu which are of Type B. Hence, the disks Djv and Ejv are horizontally aligned, to the right of σr. The disks Djv and Ejv are above and to the left of the disks Dj1v and Ej1v.

Figure 9: Illustration for the placement of the disks Dku, Eku, Dv, and Ev. White circles represent initial or intermediate placements for such disks.

After the vertices v1,,v1 and the disks D1v,E1v,,D1v,E1v have been drawn, it only remains to draw the disks Dku and Eku inside Δku=(uk1,uk,t) and the disks Dv and Ev inside Δv=(v1,v,t). See Fig 9. We have to place Dku and Eku above σr and below Ek1u, with Dku in D and Eku in E; also, Eku has to be to the right of r. Analogously, we have to place Dv and Ev in E, to the right of σr and to the left of E1v, with Ev above r. Finally, Eku has to be above and to the left of Ev.

We can again use continuity arguments to prove that such disk placements exist. Indeed, uk1t¯ cuts the interior of σr, hence Dku can be initially set to be a point in the interior of σr, to the right of uk1t¯. Analogously, Dv can be initially set to be a point in the interior of σr above v1t¯. Disks Eku and Ev are initially set to coincide with r. Now Dku and Eku can be moved upward of a sufficiently small distance so that Dku does not collide with uk1t¯ and remains below Ek1u; note that now Dku and Eku are in the interior of Δku. Analogously, disks Dv and Ev can be moved rightward, of a sufficiently small distance so that they still are to the left of E1v and they now both lie in the interior of Δv. Next, we move Eku rightward and Ev upward so that they are to the right and above r, respectively. This movement is sufficiently small so that Eku remains in Δku and Ev in Δv, and so that Eku remains above and to the left of Ev. Finally, we enlarge the disks so that they have a positive radius. Such a radius can be set to be sufficiently small so that all the above listed properties, which were satisfied before such an enlargement, are still maintained.

The drawing Γ of G is completed by drawing the subgraphs M1,,M, S1,,Sk recursively, with triangles Δ1v,,Δv,Δ1u,,Δku representing their outer faces, and with disks D1v,E1v,,Dv,Ev,,D1u,E1u,,Dku,Eku inside such triangles.

Correctness.

The drawing Γ is straight-line by construction.

The drawings of the subgraphs M1,,M,S1,,Sk are planar by induction. Moreover, the construction guarantees that the cycle 𝒞sm is represented by a convex curve which keeps in its exterior every edge from a vertex of 𝒞sm to t. It follows that distinct subgraphs among M1,,M,S1,,Sk do not cross each other, that the edges inside or on the boundary of 𝒞sm do not cross the subgraphs M1,,M,S1,,Sk, and that the edges inside or on the boundary of 𝒞sm do not cross each other. Hence, Γ is planar.

Finally, we prove that Γ is a dominance drawing.

  • Vertices that are internal to the same subgraph among M1,,M,S1,,Sk are in the correct dominance relationship, by induction.

  • Vertices that are internal to distinct subgraphs among M1,,M,S1,,Sk are incomparable. This is because, for any internal vertex v of a subgraph Mj or Si, we have that t is the only vertex incident to the outer face of Mj or Si, respectively, that is a successor of v, as a consequence of the fact that Ps and Pm are the longest paths between their end-vertices. By induction, vertices that are internal to distinct subgraphs among M1,,M,S1,,Sk are placed into disks among D1v,E1v,,Dv,Ev,D1u,E1u,,Dku, Eku. Also, any two disks associated to distinct subgraphs among M1,,M,S1,,Sk are one to the left and above the other one, hence such vertices are in the correct dominance relationship.

  • By construction, v1,,v1 are to the right and below u1,,uk1, which is the correct dominance relationship as any vertex among v1,,v1 is incomparable with any vertex among u1,,uk1.

  • Also by construction, we have that vj is above and to the right of vj1, for j=1,,, and that ui is above and to the right of ui1, for i=1,,, which is the correct dominance relationship because of the existence of the directed paths Ps and Pm.

  • Each vertex ui with i=1,,k is below and to the right of every disk among D1u,E1u,,Diu and is below and to the left of every disk among Eiu,Di+1u,,Dku,Eku; this is indeed the correct dominance relationship, as all the vertices in the former sequence of disks are incomparable to ui, while all the vertices in the latter sequence of disks are successors of ui. That the vertices among v1,,v are in the correct dominance relationship with respect to vertices inside disks D1v,E1v,,Dv,Ev can be argued similarly.

  • Each vertex ui with i=1,,k1 is above and to the left of every disk among D1v,E1v,,Dv; this is indeed the correct dominance relationship, as ui is incomparable to every vertex internal to a subgraph Mj with j=1,,, with the exception of the successors of r in M, which are also successors of ui; these vertices are in Ev, which is indeed above and to the right of ui. Similarly, each vertex vj with j=1,,1 is in the correct dominance relationship with respect to every vertex internal to a subgraph Si with i=1,,k.

Clearly, an analogous result holds true for st-plane 3-trees in which the source is adjacent to every vertex.

5 Left-non-transitive 𝒔𝒕-plane graphs

We now consider left-non-transitive st-plane graphs. These are the st-plane graphs such that the left boundary of every face is not a single edge. We show the following.

Theorem 5.

Left-non-transitive st-plane graphs admit planar straight-line dominance drawings.

Proof.

Consider a left-non-transitive st-plane graph G. We are going to use a right-to-left path decomposition of G. This consists of a sequence of directed paths P1,P2,,Pk such that the following properties are satisfied.

  • P1 is the right boundary of the outer face of G;

  • for i=1,,k, the graph Gi:=P1P2Pi is an st-plane graph;

  • for i=2,,k, the path Pi is the left boundary of a face of G whose right boundary belongs to the left boundary of the outer face of Gi1; the internal vertices of Pi do not belong to Gi1; and

  • Gk=G.

This decomposition can be found by ordering the faces of G as in a DFS of the dual of G; for a formal proof see, e.g., [29].

We are going to construct a planar straight-line dominance drawing Γi of Gi, for i=2,,k. Then Γk is the desired drawing of G.

Figure 10: Constructing Γi from Γi1. The interior of Γi1 is not shown and shaded gray.

For i=1,,k, let Pi=(u1i,u2i,,unii). Since G is left-non-transitive, ni3 holds. The drawing Γ1 of G1=P1 is constructed as any straight-line drawing such that x(u11)<x(u21)<<x(un11) and y(u11)<y(u21)<<y(un11). Clearly, Γ1 is a planar dominance drawing. Now suppose that a planar straight-line dominance drawing Γi1 of Gi1 has been constructed, for some i{2,,k}, so that no two vertices have the same x- or y-coordinate. We construct a planar straight-line dominance drawing Γi of Gi from Γi1 as follows; refer to Fig 10. Recall that u1i and unii are vertices on the left boundary of Gi1, while the internal vertices of Pi need to be inserted into Γi1 in order to define Γi. Among all the vertices of Gi1 that lie to the right of u1i in Γi1, let vmin be the one with smallest x-coordinate. Also, among all the vertices of Gi1 that lie below unii in Γi1, let vmax be the one with largest y-coordinate. Note that x(vmin)x(unii) and y(u1i)y(vmax). We assign coordinates to the internal vertices of Pi so that x(u1i)<x(u2i)<<x(uni1i)<x(vmin) and y(vmax)<y(u2i)<<y(uni1i)<y(unii). This completes the construction of Γi.

We prove the planarity of Γi. Since the drawing of Gi1 in Γi coincides with Γi1 and since Γi1 is planar, it suffices to prove that the edges of Pi do not cross each other and do not cross Γi1. The former follows directly from the fact that x(u1i)<x(u2i)<<x(uni1i)<x(unii) and y(u1i)<y(u2i)<<y(uni1i)<y(unii), by construction. We now deal with the latter.

  • First, we prove that the edge (u1i,u2i) does not cross Γi1. Let (u1i,w) be the edge of Gi1 outgoing from u1i and incident to the left boundary of Gi1. Such an edge has the outer face of Γi1 to its left, when traversed from u1i to w. By construction, we have x(u2i)<x(vmin)x(w) and y(w)y(vmax)<y(u2i), hence the interval of x-coordinates spanned by the edge (u1i,u2i) is a subset of the one spanned by the edge (u1i,w) and the slope of the edge (u1i,u2i) is larger than the one of the edge (u1i,w). It follows that (u1i,u2i) lies in the outer face of Γi1, and hence does not cross Γi1.

  • The proof that the edge (uni1i,unii) does not cross Γi1 is analogous.

  • Finally, consider any edge (uji,uj+1i) with 2jni2. By construction, the interval of x-coordinates spanned by (uji,uj+1i) is a subset of the interval (x(u1i),x(w)), where w is defined as above. Also by construction, we have that y(u1i)<y(w)y(vmax)<y(uji)<y(uj+1i). Hence, the edge lies above the edge (u1i,w), thus in the outer face of Γi1, which is not crossed by it.

We now prove that Γi is a dominance drawing. Since the drawing of Gi1 in Γi coincides with Γi1 and since Γi1 is a dominance drawing, it suffices to prove that the placement of the internal vertices of Pi complies with the dominance relationships they are involved in. Consider any internal vertex uji of Pi. For h=1,,j1, vertex uhi is a predecessor of uji and indeed we have x(uhi)<x(uji) and y(uhi)<y(uji), by construction. Analogously, for h=j+1,,ni, vertex uhi is a successor of uji and indeed we have x(uji)<x(uhi) and y(uji)<y(uhi), by construction. Consider any vertex w of Gi1 different from u1i and unii.

  • First, if w is a predecessor of u1i, then it is also a predecessor of uji and indeed we have x(w)<x(uji) and y(w)<y(uji), given that x(w)<x(u1i) and y(w)<y(u1i) (since Γi1 is a dominance drawing) and that x(u1i)<x(uji) and y(u1i)<y(uji) (as proved above).

  • Second, if w is a successor of unii, then it is also a successor of uji and indeed we have x(uji)<x(w) and y(uji)<y(w) given that x(unii)<x(w) and y(unii)<y(w) (since Γi1 is a dominance drawing) and that x(uji)<x(unii) and y(uji)<y(unii) (as proved above).

  • Finally, if w is neither a predecessor of u1i nor a successor of unii, then it is incomparable with uji. Note that x(w)>x(u1i), as x(w)<x(u1i) would imply y(w)<y(u1i) (given that u1i is on the left boundary of Gi1), which is not possible since w is incomparable with u1i and Γi1 is a dominance drawing. Analogously, we have y(w)<y(unii). By construction, we have x(uji)<x(vmin)x(w) and y(uji)>y(vmax)y(w), hence the placement of w and uji complies with their dominance relationship.

This concludes the proof that Γi is a planar straight-line dominance drawing, hence the induction and the proof of the theorem.

Clearly, an analogous result holds true for right-non-transitive st-plane graphs, which are st-plane graphs such that the right boundary of every face is not a single edge.

6 Conclusions and Open Problems

In this paper, we tackled the following problem: Does every st-plane graph admit a planar straight-line dominance drawing? While we were not able to solve this question in its generality, our research advanced the state of the art in many directions.

First, we have provided concrete evidence for the difficulty in constructing planar straight-line dominance drawings. Most notably, we proved that planar straight-line dominance drawings with prescribed y-coordinates do not always exist. Our research in this direction indicates that, if an algorithm that constructs a planar straight-line dominance drawing of every st-plane graph exists, then it should use substantially different ideas than known algorithms for the construction of upward planar straight-line drawings.

Second, we have described several classes of st-plane graphs that admit a planar straight-line dominance drawing. A difficult benchmark here is, in our opinion, provided by the st-plane 3-trees. Hence, we believe it would be a major milestone to understand whether these graphs always admit planar straight-line dominance drawings.

We conclude with one more open problem. Does every (undirected) maximal planar graph admit a planar straight-line dominance drawing? That is, does it admit an st-orientation such that the resulting st-plane graph has a planar straight-line dominance drawing?

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