In this paper, we reduce Prize-Collecting Steiner TSP (PCTSP), Prize-Collecting Stroll (PCS), Prize-Collecting Steiner Tree (PCST), Prize-Collecting Steiner Forest (PCSF) and more generally Submodular Prize-Collecting Steiner Forest (SPCSF) on planar graphs (and more generally bounded-genus graphs) to the same problems on graphs of bounded treewidth. More precisely, we show any α-approximation algorithm for these problems on graphs of bounded treewidth gives an (α + )-approximation algorithm for these problems on planar graphs (and more generally bounded-genus graphs), for any constant > 0. Since PCS, PCTSP, and PCST can be solved exactly on graphs of bounded treewidth using dynamic programming, we obtain PTASs for these problems on planar graphs and bounded-genus graphs. In contrast, we show PCSF is APX-hard to approximate on series-parallel graphs, which are planar graphs of treewidth at most 2. This result is interesting on its own because it gives the first provable hardness separation between prize-collecting and non-prize-collecting (regular) versions of the problems: regular Steiner Forest is known to be polynomially solvable on series-parallel graphs and admits a PTAS on graphs of bounded treewidth. An analogous hardness result can be shown for Euclidian PCSF. This ends the common belief that prize-collecting variants should not add any new hardness to the problems.Prize-collecting problems involve situations where there are various demands that desire to be "served" by some structure and we must find the structure of lowest cost to accomplish this. However, if some of the demands are too expensive to serve, then we can refuse to serve them and instead pay a penalty. In particular, prize-collecting Steiner problems are well-known network design problems with several applications in expanding telecommunications networks (see for example [46,52]), cost sharing, and Lagrangian relaxation techniques (see e.g. [45,21]). A general form of these problems is the Prize-Collecting Steiner Forest (PCSF) problem 1 : given a network (graph) G = (V, E), a set of source-sink pairs 2 D = {{s 1 , t 1 }, {s 2 , t 2 }, . . . , {s k , t k }}, a non-negative cost function c : E → R + , and a non-negative penalty function π : 2 D → R + , our goal is a minimum-cost way of installing (buying) a set of links (edges) and paying the penalty for those pairs which are not connected via installed links. We also consider the problem with a general penalty function called Submodular Prize-Collecting Steiner Forest (SPCSF), in which the penalty function π is a monotone non-negative submodular function 3 of all unsatisfied pairs. In PCSF when all penalties are ∞, the problem is the classic APX-hard Steiner Forest problem, for which the best known approximation ratio is 2 − 2 n (n is the number of nodes of the graph) due to Agrawal, Klein, and Ravi [2] (see also [35] for a more general result and a simpler analysis). The case of Prize-Collecting Steiner Forest problem in which all sinks are identical is the classic (rooted) Prize-Collectin...